rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
|
|
|
* Read-Copy Update mechanism for mutual exclusion (tree-based version)
|
|
|
|
* Internal non-public definitions that provide either classic
|
2011-03-02 22:15:15 +01:00
|
|
|
* or preemptible semantics.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*
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|
|
* This program is free software; you can redistribute it and/or modify
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* it under the terms of the GNU General Public License as published by
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* the Free Software Foundation; either version 2 of the License, or
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* (at your option) any later version.
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*
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|
* This program is distributed in the hope that it will be useful,
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* but WITHOUT ANY WARRANTY; without even the implied warranty of
|
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* MERCHANTABILITY or FITNESS FOR A PARTICULAR PURPOSE. See the
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|
|
* GNU General Public License for more details.
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*
|
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* You should have received a copy of the GNU General Public License
|
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* along with this program; if not, write to the Free Software
|
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|
* Foundation, Inc., 59 Temple Place - Suite 330, Boston, MA 02111-1307, USA.
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*
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* Copyright Red Hat, 2009
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* Copyright IBM Corporation, 2009
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*
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* Author: Ingo Molnar <mingo@elte.hu>
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* Paul E. McKenney <paulmck@linux.vnet.ibm.com>
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*/
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2009-12-02 21:10:15 +01:00
|
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#include <linux/delay.h>
|
2010-10-21 05:29:05 +02:00
|
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|
#include <linux/stop_machine.h>
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
|
2011-08-19 20:39:11 +02:00
|
|
|
#define RCU_KTHREAD_PRIO 1
|
|
|
|
|
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
#define RCU_BOOST_PRIO CONFIG_RCU_BOOST_PRIO
|
|
|
|
#else
|
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|
|
#define RCU_BOOST_PRIO RCU_KTHREAD_PRIO
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|
#endif
|
|
|
|
|
2010-04-13 23:19:23 +02:00
|
|
|
/*
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|
|
|
* Check the RCU kernel configuration parameters and print informative
|
|
|
|
* messages about anything out of the ordinary. If you like #ifdef, you
|
|
|
|
* will love this function.
|
|
|
|
*/
|
|
|
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static void __init rcu_bootup_announce_oddness(void)
|
|
|
|
{
|
|
|
|
#ifdef CONFIG_RCU_TRACE
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printk(KERN_INFO "\tRCU debugfs-based tracing is enabled.\n");
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#endif
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#if (defined(CONFIG_64BIT) && CONFIG_RCU_FANOUT != 64) || (!defined(CONFIG_64BIT) && CONFIG_RCU_FANOUT != 32)
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printk(KERN_INFO "\tCONFIG_RCU_FANOUT set to non-default value of %d\n",
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CONFIG_RCU_FANOUT);
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#endif
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#ifdef CONFIG_RCU_FANOUT_EXACT
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printk(KERN_INFO "\tHierarchical RCU autobalancing is disabled.\n");
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#endif
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#ifdef CONFIG_RCU_FAST_NO_HZ
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printk(KERN_INFO
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"\tRCU dyntick-idle grace-period acceleration is enabled.\n");
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#endif
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#ifdef CONFIG_PROVE_RCU
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printk(KERN_INFO "\tRCU lockdep checking is enabled.\n");
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#endif
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#ifdef CONFIG_RCU_TORTURE_TEST_RUNNABLE
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printk(KERN_INFO "\tRCU torture testing starts during boot.\n");
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|
|
#endif
|
2010-08-30 18:52:50 +02:00
|
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|
#if defined(CONFIG_TREE_PREEMPT_RCU) && !defined(CONFIG_RCU_CPU_STALL_VERBOSE)
|
2010-04-13 23:19:23 +02:00
|
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printk(KERN_INFO "\tVerbose stalled-CPUs detection is disabled.\n");
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#endif
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|
#if NUM_RCU_LVL_4 != 0
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printk(KERN_INFO "\tExperimental four-level hierarchy is enabled.\n");
|
|
|
|
#endif
|
|
|
|
}
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
#ifdef CONFIG_TREE_PREEMPT_RCU
|
|
|
|
|
2011-06-21 09:13:44 +02:00
|
|
|
struct rcu_state rcu_preempt_state = RCU_STATE_INITIALIZER(rcu_preempt);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
DEFINE_PER_CPU(struct rcu_data, rcu_preempt_data);
|
2011-02-07 21:47:15 +01:00
|
|
|
static struct rcu_state *rcu_state = &rcu_preempt_state;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
static void rcu_read_unlock_special(struct task_struct *t);
|
2009-12-02 21:10:15 +01:00
|
|
|
static int rcu_preempted_readers_exp(struct rcu_node *rnp);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
|
|
|
* Tell them what RCU they are running.
|
|
|
|
*/
|
2009-11-11 20:28:06 +01:00
|
|
|
static void __init rcu_bootup_announce(void)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
2011-03-02 22:15:15 +01:00
|
|
|
printk(KERN_INFO "Preemptible hierarchical RCU implementation.\n");
|
2010-04-13 23:19:23 +02:00
|
|
|
rcu_bootup_announce_oddness();
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Return the number of RCU-preempt batches processed thus far
|
|
|
|
* for debug and statistics.
|
|
|
|
*/
|
|
|
|
long rcu_batches_completed_preempt(void)
|
|
|
|
{
|
|
|
|
return rcu_preempt_state.completed;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_batches_completed_preempt);
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Return the number of RCU batches processed thus far for debug & stats.
|
|
|
|
*/
|
|
|
|
long rcu_batches_completed(void)
|
|
|
|
{
|
|
|
|
return rcu_batches_completed_preempt();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_batches_completed);
|
|
|
|
|
2010-01-05 00:09:10 +01:00
|
|
|
/*
|
|
|
|
* Force a quiescent state for preemptible RCU.
|
|
|
|
*/
|
|
|
|
void rcu_force_quiescent_state(void)
|
|
|
|
{
|
|
|
|
force_quiescent_state(&rcu_preempt_state, 0);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_force_quiescent_state);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Record a preemptible-RCU quiescent state for the specified CPU. Note
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* that this just means that the task currently running on the CPU is
|
|
|
|
* not in a quiescent state. There might be any number of tasks blocked
|
|
|
|
* while in an RCU read-side critical section.
|
rcu: refactor RCU's context-switch handling
The addition of preemptible RCU to treercu resulted in a bit of
confusion and inefficiency surrounding the handling of context switches
for RCU-sched and for RCU-preempt. For RCU-sched, a context switch
is a quiescent state, pure and simple, just like it always has been.
For RCU-preempt, a context switch is in no way a quiescent state, but
special handling is required when a task blocks in an RCU read-side
critical section.
However, the callout from the scheduler and the outer loop in ksoftirqd
still calls something named rcu_sched_qs(), whose name is no longer
accurate. Furthermore, when rcu_check_callbacks() notes an RCU-sched
quiescent state, it ends up unnecessarily (though harmlessly, aside
from the performance hit) enqueuing the current task if it happens to
be running in an RCU-preempt read-side critical section. This not only
increases the maximum latency of scheduler_tick(), it also needlessly
increases the overhead of the next outermost rcu_read_unlock() invocation.
This patch addresses this situation by separating the notion of RCU's
context-switch handling from that of RCU-sched's quiescent states.
The context-switch handling is covered by rcu_note_context_switch() in
general and by rcu_preempt_note_context_switch() for preemptible RCU.
This permits rcu_sched_qs() to handle quiescent states and only quiescent
states. It also reduces the maximum latency of scheduler_tick(), though
probably by much less than a microsecond. Finally, it means that tasks
within preemptible-RCU read-side critical sections avoid incurring the
overhead of queuing unless there really is a context switch.
Suggested-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Acked-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Peter Zijlstra <peterz@infradead.org>
2010-04-02 02:37:01 +02:00
|
|
|
*
|
|
|
|
* Unlike the other rcu_*_qs() functions, callers to this function
|
|
|
|
* must disable irqs in order to protect the assignment to
|
|
|
|
* ->rcu_read_unlock_special.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
2009-09-13 18:15:10 +02:00
|
|
|
static void rcu_preempt_qs(int cpu)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
struct rcu_data *rdp = &per_cpu(rcu_preempt_data, cpu);
|
rcu: refactor RCU's context-switch handling
The addition of preemptible RCU to treercu resulted in a bit of
confusion and inefficiency surrounding the handling of context switches
for RCU-sched and for RCU-preempt. For RCU-sched, a context switch
is a quiescent state, pure and simple, just like it always has been.
For RCU-preempt, a context switch is in no way a quiescent state, but
special handling is required when a task blocks in an RCU read-side
critical section.
However, the callout from the scheduler and the outer loop in ksoftirqd
still calls something named rcu_sched_qs(), whose name is no longer
accurate. Furthermore, when rcu_check_callbacks() notes an RCU-sched
quiescent state, it ends up unnecessarily (though harmlessly, aside
from the performance hit) enqueuing the current task if it happens to
be running in an RCU-preempt read-side critical section. This not only
increases the maximum latency of scheduler_tick(), it also needlessly
increases the overhead of the next outermost rcu_read_unlock() invocation.
This patch addresses this situation by separating the notion of RCU's
context-switch handling from that of RCU-sched's quiescent states.
The context-switch handling is covered by rcu_note_context_switch() in
general and by rcu_preempt_note_context_switch() for preemptible RCU.
This permits rcu_sched_qs() to handle quiescent states and only quiescent
states. It also reduces the maximum latency of scheduler_tick(), though
probably by much less than a microsecond. Finally, it means that tasks
within preemptible-RCU read-side critical sections avoid incurring the
overhead of queuing unless there really is a context switch.
Suggested-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Acked-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Peter Zijlstra <peterz@infradead.org>
2010-04-02 02:37:01 +02:00
|
|
|
|
rcu: Simplify quiescent-state accounting
There is often a delay between the time that a CPU passes through a
quiescent state and the time that this quiescent state is reported to the
RCU core. It is quite possible that the grace period ended before the
quiescent state could be reported, for example, some other CPU might have
deduced that this CPU passed through dyntick-idle mode. It is critically
important that quiescent state be counted only against the grace period
that was in effect at the time that the quiescent state was detected.
Previously, this was handled by recording the number of the last grace
period to complete when passing through a quiescent state. The RCU
core then checks this number against the current value, and rejects
the quiescent state if there is a mismatch. However, one additional
possibility must be accounted for, namely that the quiescent state was
recorded after the prior grace period completed but before the current
grace period started. In this case, the RCU core must reject the
quiescent state, but the recorded number will match. This is handled
when the CPU becomes aware of a new grace period -- at that point,
it invalidates any prior quiescent state.
This works, but is a bit indirect. The new approach records the current
grace period, and the RCU core checks to see (1) that this is still the
current grace period and (2) that this grace period has not yet ended.
This approach simplifies reasoning about correctness, and this commit
changes over to this new approach.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-27 09:17:43 +02:00
|
|
|
rdp->passed_quiesce_gpnum = rdp->gpnum;
|
2009-09-13 18:15:10 +02:00
|
|
|
barrier();
|
rcu: Simplify quiescent-state accounting
There is often a delay between the time that a CPU passes through a
quiescent state and the time that this quiescent state is reported to the
RCU core. It is quite possible that the grace period ended before the
quiescent state could be reported, for example, some other CPU might have
deduced that this CPU passed through dyntick-idle mode. It is critically
important that quiescent state be counted only against the grace period
that was in effect at the time that the quiescent state was detected.
Previously, this was handled by recording the number of the last grace
period to complete when passing through a quiescent state. The RCU
core then checks this number against the current value, and rejects
the quiescent state if there is a mismatch. However, one additional
possibility must be accounted for, namely that the quiescent state was
recorded after the prior grace period completed but before the current
grace period started. In this case, the RCU core must reject the
quiescent state, but the recorded number will match. This is handled
when the CPU becomes aware of a new grace period -- at that point,
it invalidates any prior quiescent state.
This works, but is a bit indirect. The new approach records the current
grace period, and the RCU core checks to see (1) that this is still the
current grace period and (2) that this grace period has not yet ended.
This approach simplifies reasoning about correctness, and this commit
changes over to this new approach.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-27 09:17:43 +02:00
|
|
|
if (rdp->passed_quiesce == 0)
|
rcu: Add grace-period, quiescent-state, and call_rcu trace events
Add trace events to record grace-period start and end, quiescent states,
CPUs noticing grace-period start and end, grace-period initialization,
call_rcu() invocation, tasks blocking in RCU read-side critical sections,
tasks exiting those same critical sections, force_quiescent_state()
detection of dyntick-idle and offline CPUs, CPUs entering and leaving
dyntick-idle mode (except from NMIs), CPUs coming online and going
offline, and CPUs being kicked for staying in dyntick-idle mode for too
long (as in many weeks, even on 32-bit systems).
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
rcu: Add the rcu flavor to callback trace events
The earlier trace events for registering RCU callbacks and for invoking
them did not include the RCU flavor (rcu_bh, rcu_preempt, or rcu_sched).
This commit adds the RCU flavor to those trace events.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-25 15:36:56 +02:00
|
|
|
trace_rcu_grace_period("rcu_preempt", rdp->gpnum, "cpuqs");
|
rcu: Simplify quiescent-state accounting
There is often a delay between the time that a CPU passes through a
quiescent state and the time that this quiescent state is reported to the
RCU core. It is quite possible that the grace period ended before the
quiescent state could be reported, for example, some other CPU might have
deduced that this CPU passed through dyntick-idle mode. It is critically
important that quiescent state be counted only against the grace period
that was in effect at the time that the quiescent state was detected.
Previously, this was handled by recording the number of the last grace
period to complete when passing through a quiescent state. The RCU
core then checks this number against the current value, and rejects
the quiescent state if there is a mismatch. However, one additional
possibility must be accounted for, namely that the quiescent state was
recorded after the prior grace period completed but before the current
grace period started. In this case, the RCU core must reject the
quiescent state, but the recorded number will match. This is handled
when the CPU becomes aware of a new grace period -- at that point,
it invalidates any prior quiescent state.
This works, but is a bit indirect. The new approach records the current
grace period, and the RCU core checks to see (1) that this is still the
current grace period and (2) that this grace period has not yet ended.
This approach simplifies reasoning about correctness, and this commit
changes over to this new approach.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-27 09:17:43 +02:00
|
|
|
rdp->passed_quiesce = 1;
|
rcu: refactor RCU's context-switch handling
The addition of preemptible RCU to treercu resulted in a bit of
confusion and inefficiency surrounding the handling of context switches
for RCU-sched and for RCU-preempt. For RCU-sched, a context switch
is a quiescent state, pure and simple, just like it always has been.
For RCU-preempt, a context switch is in no way a quiescent state, but
special handling is required when a task blocks in an RCU read-side
critical section.
However, the callout from the scheduler and the outer loop in ksoftirqd
still calls something named rcu_sched_qs(), whose name is no longer
accurate. Furthermore, when rcu_check_callbacks() notes an RCU-sched
quiescent state, it ends up unnecessarily (though harmlessly, aside
from the performance hit) enqueuing the current task if it happens to
be running in an RCU-preempt read-side critical section. This not only
increases the maximum latency of scheduler_tick(), it also needlessly
increases the overhead of the next outermost rcu_read_unlock() invocation.
This patch addresses this situation by separating the notion of RCU's
context-switch handling from that of RCU-sched's quiescent states.
The context-switch handling is covered by rcu_note_context_switch() in
general and by rcu_preempt_note_context_switch() for preemptible RCU.
This permits rcu_sched_qs() to handle quiescent states and only quiescent
states. It also reduces the maximum latency of scheduler_tick(), though
probably by much less than a microsecond. Finally, it means that tasks
within preemptible-RCU read-side critical sections avoid incurring the
overhead of queuing unless there really is a context switch.
Suggested-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Acked-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Peter Zijlstra <peterz@infradead.org>
2010-04-02 02:37:01 +02:00
|
|
|
current->rcu_read_unlock_special &= ~RCU_READ_UNLOCK_NEED_QS;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2009-09-13 18:15:10 +02:00
|
|
|
* We have entered the scheduler, and the current task might soon be
|
|
|
|
* context-switched away from. If this task is in an RCU read-side
|
|
|
|
* critical section, we will no longer be able to rely on the CPU to
|
2010-11-30 06:56:39 +01:00
|
|
|
* record that fact, so we enqueue the task on the blkd_tasks list.
|
|
|
|
* The task will dequeue itself when it exits the outermost enclosing
|
|
|
|
* RCU read-side critical section. Therefore, the current grace period
|
|
|
|
* cannot be permitted to complete until the blkd_tasks list entries
|
|
|
|
* predating the current grace period drain, in other words, until
|
|
|
|
* rnp->gp_tasks becomes NULL.
|
2009-09-13 18:15:10 +02:00
|
|
|
*
|
|
|
|
* Caller must disable preemption.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
2009-09-13 18:15:10 +02:00
|
|
|
static void rcu_preempt_note_context_switch(int cpu)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
struct task_struct *t = current;
|
2009-09-13 18:15:10 +02:00
|
|
|
unsigned long flags;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
struct rcu_data *rdp;
|
|
|
|
struct rcu_node *rnp;
|
|
|
|
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
if (t->rcu_read_lock_nesting > 0 &&
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
(t->rcu_read_unlock_special & RCU_READ_UNLOCK_BLOCKED) == 0) {
|
|
|
|
|
|
|
|
/* Possibly blocking in an RCU read-side critical section. */
|
2010-06-28 10:25:04 +02:00
|
|
|
rdp = per_cpu_ptr(rcu_preempt_state.rda, cpu);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
rnp = rdp->mynode;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
t->rcu_read_unlock_special |= RCU_READ_UNLOCK_BLOCKED;
|
2009-08-28 00:00:12 +02:00
|
|
|
t->rcu_blocked_node = rnp;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
|
|
|
|
/*
|
|
|
|
* If this CPU has already checked in, then this task
|
|
|
|
* will hold up the next grace period rather than the
|
|
|
|
* current grace period. Queue the task accordingly.
|
|
|
|
* If the task is queued for the current grace period
|
|
|
|
* (i.e., this CPU has not yet passed through a quiescent
|
|
|
|
* state for the current grace period), then as long
|
|
|
|
* as that task remains queued, the current grace period
|
2010-11-30 06:56:39 +01:00
|
|
|
* cannot end. Note that there is some uncertainty as
|
|
|
|
* to exactly when the current grace period started.
|
|
|
|
* We take a conservative approach, which can result
|
|
|
|
* in unnecessarily waiting on tasks that started very
|
|
|
|
* slightly after the current grace period began. C'est
|
|
|
|
* la vie!!!
|
2009-09-13 18:15:09 +02:00
|
|
|
*
|
|
|
|
* But first, note that the current CPU must still be
|
|
|
|
* on line!
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
2009-09-13 18:15:09 +02:00
|
|
|
WARN_ON_ONCE((rdp->grpmask & rnp->qsmaskinit) == 0);
|
2009-09-18 18:50:18 +02:00
|
|
|
WARN_ON_ONCE(!list_empty(&t->rcu_node_entry));
|
2010-11-30 06:56:39 +01:00
|
|
|
if ((rnp->qsmask & rdp->grpmask) && rnp->gp_tasks != NULL) {
|
|
|
|
list_add(&t->rcu_node_entry, rnp->gp_tasks->prev);
|
|
|
|
rnp->gp_tasks = &t->rcu_node_entry;
|
2011-02-07 21:47:15 +01:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
if (rnp->boost_tasks != NULL)
|
|
|
|
rnp->boost_tasks = rnp->gp_tasks;
|
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
2010-11-30 06:56:39 +01:00
|
|
|
} else {
|
|
|
|
list_add(&t->rcu_node_entry, &rnp->blkd_tasks);
|
|
|
|
if (rnp->qsmask & rdp->grpmask)
|
|
|
|
rnp->gp_tasks = &t->rcu_node_entry;
|
|
|
|
}
|
rcu: Add grace-period, quiescent-state, and call_rcu trace events
Add trace events to record grace-period start and end, quiescent states,
CPUs noticing grace-period start and end, grace-period initialization,
call_rcu() invocation, tasks blocking in RCU read-side critical sections,
tasks exiting those same critical sections, force_quiescent_state()
detection of dyntick-idle and offline CPUs, CPUs entering and leaving
dyntick-idle mode (except from NMIs), CPUs coming online and going
offline, and CPUs being kicked for staying in dyntick-idle mode for too
long (as in many weeks, even on 32-bit systems).
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
rcu: Add the rcu flavor to callback trace events
The earlier trace events for registering RCU callbacks and for invoking
them did not include the RCU flavor (rcu_bh, rcu_preempt, or rcu_sched).
This commit adds the RCU flavor to those trace events.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-25 15:36:56 +02:00
|
|
|
trace_rcu_preempt_task(rdp->rsp->name,
|
|
|
|
t->pid,
|
|
|
|
(rnp->qsmask & rdp->grpmask)
|
|
|
|
? rnp->gpnum
|
|
|
|
: rnp->gpnum + 1);
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
} else if (t->rcu_read_lock_nesting < 0 &&
|
|
|
|
t->rcu_read_unlock_special) {
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Complete exit from RCU read-side critical section on
|
|
|
|
* behalf of preempted instance of __rcu_read_unlock().
|
|
|
|
*/
|
|
|
|
rcu_read_unlock_special(t);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Either we were not in an RCU read-side critical section to
|
|
|
|
* begin with, or we have now recorded that critical section
|
|
|
|
* globally. Either way, we can now note a quiescent state
|
|
|
|
* for this CPU. Again, if we were in an RCU read-side critical
|
|
|
|
* section, and if that critical section was blocking the current
|
|
|
|
* grace period, then the fact that the task has been enqueued
|
|
|
|
* means that we continue to block the current grace period.
|
|
|
|
*/
|
2009-09-18 18:50:18 +02:00
|
|
|
local_irq_save(flags);
|
rcu: refactor RCU's context-switch handling
The addition of preemptible RCU to treercu resulted in a bit of
confusion and inefficiency surrounding the handling of context switches
for RCU-sched and for RCU-preempt. For RCU-sched, a context switch
is a quiescent state, pure and simple, just like it always has been.
For RCU-preempt, a context switch is in no way a quiescent state, but
special handling is required when a task blocks in an RCU read-side
critical section.
However, the callout from the scheduler and the outer loop in ksoftirqd
still calls something named rcu_sched_qs(), whose name is no longer
accurate. Furthermore, when rcu_check_callbacks() notes an RCU-sched
quiescent state, it ends up unnecessarily (though harmlessly, aside
from the performance hit) enqueuing the current task if it happens to
be running in an RCU-preempt read-side critical section. This not only
increases the maximum latency of scheduler_tick(), it also needlessly
increases the overhead of the next outermost rcu_read_unlock() invocation.
This patch addresses this situation by separating the notion of RCU's
context-switch handling from that of RCU-sched's quiescent states.
The context-switch handling is covered by rcu_note_context_switch() in
general and by rcu_preempt_note_context_switch() for preemptible RCU.
This permits rcu_sched_qs() to handle quiescent states and only quiescent
states. It also reduces the maximum latency of scheduler_tick(), though
probably by much less than a microsecond. Finally, it means that tasks
within preemptible-RCU read-side critical sections avoid incurring the
overhead of queuing unless there really is a context switch.
Suggested-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Acked-by: Lai Jiangshan <laijs@cn.fujitsu.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Peter Zijlstra <peterz@infradead.org>
2010-04-02 02:37:01 +02:00
|
|
|
rcu_preempt_qs(cpu);
|
2009-09-18 18:50:18 +02:00
|
|
|
local_irq_restore(flags);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Tree-preemptible RCU implementation for rcu_read_lock().
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* Just increment ->rcu_read_lock_nesting, shared state will be updated
|
|
|
|
* if we block.
|
|
|
|
*/
|
|
|
|
void __rcu_read_lock(void)
|
|
|
|
{
|
2010-08-20 01:57:45 +02:00
|
|
|
current->rcu_read_lock_nesting++;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
barrier(); /* needed if we ever invoke rcu_read_lock in rcutree.c */
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(__rcu_read_lock);
|
|
|
|
|
2009-09-23 18:50:41 +02:00
|
|
|
/*
|
|
|
|
* Check for preempted RCU readers blocking the current grace period
|
|
|
|
* for the specified rcu_node structure. If the caller needs a reliable
|
|
|
|
* answer, it must hold the rcu_node's ->lock.
|
|
|
|
*/
|
2011-02-07 21:47:15 +01:00
|
|
|
static int rcu_preempt_blocked_readers_cgp(struct rcu_node *rnp)
|
2009-09-23 18:50:41 +02:00
|
|
|
{
|
2010-11-30 06:56:39 +01:00
|
|
|
return rnp->gp_tasks != NULL;
|
2009-09-23 18:50:41 +02:00
|
|
|
}
|
|
|
|
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
/*
|
|
|
|
* Record a quiescent state for all tasks that were previously queued
|
|
|
|
* on the specified rcu_node structure and that were blocking the current
|
|
|
|
* RCU grace period. The caller must hold the specified rnp->lock with
|
|
|
|
* irqs disabled, and this lock is released upon return, but irqs remain
|
|
|
|
* disabled.
|
|
|
|
*/
|
2009-12-02 21:10:13 +01:00
|
|
|
static void rcu_report_unblock_qs_rnp(struct rcu_node *rnp, unsigned long flags)
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
__releases(rnp->lock)
|
|
|
|
{
|
|
|
|
unsigned long mask;
|
|
|
|
struct rcu_node *rnp_p;
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
if (rnp->qsmask != 0 || rcu_preempt_blocked_readers_cgp(rnp)) {
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
return; /* Still need more quiescent states! */
|
|
|
|
}
|
|
|
|
|
|
|
|
rnp_p = rnp->parent;
|
|
|
|
if (rnp_p == NULL) {
|
|
|
|
/*
|
|
|
|
* Either there is only one rcu_node in the tree,
|
|
|
|
* or tasks were kicked up to root rcu_node due to
|
|
|
|
* CPUs going offline.
|
|
|
|
*/
|
2009-12-02 21:10:13 +01:00
|
|
|
rcu_report_qs_rsp(&rcu_preempt_state, flags);
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
return;
|
|
|
|
}
|
|
|
|
|
|
|
|
/* Report up the rest of the hierarchy. */
|
|
|
|
mask = rnp->grpmask;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock(&rnp->lock); /* irqs remain disabled. */
|
|
|
|
raw_spin_lock(&rnp_p->lock); /* irqs already disabled. */
|
2009-12-02 21:10:13 +01:00
|
|
|
rcu_report_qs_rnp(mask, &rcu_preempt_state, rnp_p, flags);
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
}
|
|
|
|
|
2010-11-30 06:56:39 +01:00
|
|
|
/*
|
|
|
|
* Advance a ->blkd_tasks-list pointer to the next entry, instead
|
|
|
|
* returning NULL if at the end of the list.
|
|
|
|
*/
|
|
|
|
static struct list_head *rcu_next_node_entry(struct task_struct *t,
|
|
|
|
struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
struct list_head *np;
|
|
|
|
|
|
|
|
np = t->rcu_node_entry.next;
|
|
|
|
if (np == &rnp->blkd_tasks)
|
|
|
|
np = NULL;
|
|
|
|
return np;
|
|
|
|
}
|
|
|
|
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
/*
|
|
|
|
* Handle special cases during rcu_read_unlock(), such as needing to
|
|
|
|
* notify RCU core processing or task having blocked during the RCU
|
|
|
|
* read-side critical section.
|
|
|
|
*/
|
2011-05-21 14:57:18 +02:00
|
|
|
static noinline void rcu_read_unlock_special(struct task_struct *t)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
int empty;
|
2009-12-02 21:10:15 +01:00
|
|
|
int empty_exp;
|
2011-09-21 23:41:37 +02:00
|
|
|
int empty_exp_now;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
unsigned long flags;
|
2010-11-30 06:56:39 +01:00
|
|
|
struct list_head *np;
|
2011-08-04 16:55:34 +02:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
struct rt_mutex *rbmp = NULL;
|
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
struct rcu_node *rnp;
|
|
|
|
int special;
|
|
|
|
|
|
|
|
/* NMI handlers cannot block and cannot safely manipulate state. */
|
|
|
|
if (in_nmi())
|
|
|
|
return;
|
|
|
|
|
|
|
|
local_irq_save(flags);
|
|
|
|
|
|
|
|
/*
|
|
|
|
* If RCU core is waiting for this CPU to exit critical section,
|
|
|
|
* let it know that we have done so.
|
|
|
|
*/
|
|
|
|
special = t->rcu_read_unlock_special;
|
|
|
|
if (special & RCU_READ_UNLOCK_NEED_QS) {
|
2009-09-13 18:15:10 +02:00
|
|
|
rcu_preempt_qs(smp_processor_id());
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/* Hardware IRQ handlers cannot block. */
|
2011-07-20 00:32:00 +02:00
|
|
|
if (in_irq() || in_serving_softirq()) {
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
local_irq_restore(flags);
|
|
|
|
return;
|
|
|
|
}
|
|
|
|
|
|
|
|
/* Clean up if blocked during RCU read-side critical section. */
|
|
|
|
if (special & RCU_READ_UNLOCK_BLOCKED) {
|
|
|
|
t->rcu_read_unlock_special &= ~RCU_READ_UNLOCK_BLOCKED;
|
|
|
|
|
2009-08-27 23:58:16 +02:00
|
|
|
/*
|
|
|
|
* Remove this task from the list it blocked on. The
|
|
|
|
* task can migrate while we acquire the lock, but at
|
|
|
|
* most one time. So at most two passes through loop.
|
|
|
|
*/
|
|
|
|
for (;;) {
|
2009-08-28 00:00:12 +02:00
|
|
|
rnp = t->rcu_blocked_node;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock(&rnp->lock); /* irqs already disabled. */
|
2009-08-28 00:00:12 +02:00
|
|
|
if (rnp == t->rcu_blocked_node)
|
2009-08-27 23:58:16 +02:00
|
|
|
break;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock(&rnp->lock); /* irqs remain disabled. */
|
2009-08-27 23:58:16 +02:00
|
|
|
}
|
2011-02-07 21:47:15 +01:00
|
|
|
empty = !rcu_preempt_blocked_readers_cgp(rnp);
|
2009-12-02 21:10:15 +01:00
|
|
|
empty_exp = !rcu_preempted_readers_exp(rnp);
|
|
|
|
smp_mb(); /* ensure expedited fastpath sees end of RCU c-s. */
|
2010-11-30 06:56:39 +01:00
|
|
|
np = rcu_next_node_entry(t, rnp);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
list_del_init(&t->rcu_node_entry);
|
2011-08-04 16:55:34 +02:00
|
|
|
t->rcu_blocked_node = NULL;
|
rcu: Add grace-period, quiescent-state, and call_rcu trace events
Add trace events to record grace-period start and end, quiescent states,
CPUs noticing grace-period start and end, grace-period initialization,
call_rcu() invocation, tasks blocking in RCU read-side critical sections,
tasks exiting those same critical sections, force_quiescent_state()
detection of dyntick-idle and offline CPUs, CPUs entering and leaving
dyntick-idle mode (except from NMIs), CPUs coming online and going
offline, and CPUs being kicked for staying in dyntick-idle mode for too
long (as in many weeks, even on 32-bit systems).
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
rcu: Add the rcu flavor to callback trace events
The earlier trace events for registering RCU callbacks and for invoking
them did not include the RCU flavor (rcu_bh, rcu_preempt, or rcu_sched).
This commit adds the RCU flavor to those trace events.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-25 15:36:56 +02:00
|
|
|
trace_rcu_unlock_preempted_task("rcu_preempt",
|
|
|
|
rnp->gpnum, t->pid);
|
2010-11-30 06:56:39 +01:00
|
|
|
if (&t->rcu_node_entry == rnp->gp_tasks)
|
|
|
|
rnp->gp_tasks = np;
|
|
|
|
if (&t->rcu_node_entry == rnp->exp_tasks)
|
|
|
|
rnp->exp_tasks = np;
|
2011-02-07 21:47:15 +01:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
if (&t->rcu_node_entry == rnp->boost_tasks)
|
|
|
|
rnp->boost_tasks = np;
|
2011-08-04 16:55:34 +02:00
|
|
|
/* Snapshot/clear ->rcu_boost_mutex with rcu_node lock held. */
|
|
|
|
if (t->rcu_boost_mutex) {
|
|
|
|
rbmp = t->rcu_boost_mutex;
|
|
|
|
t->rcu_boost_mutex = NULL;
|
rcu: Fix RCU_BOOST race handling current->rcu_read_unlock_special
The RCU_BOOST commits for TREE_PREEMPT_RCU introduced an other-task
write to a new RCU_READ_UNLOCK_BOOSTED bit in the task_struct structure's
->rcu_read_unlock_special field, but, as noted by Steven Rostedt, without
correctly synchronizing all accesses to ->rcu_read_unlock_special.
This could result in bits in ->rcu_read_unlock_special being spuriously
set and cleared due to conflicting accesses, which in turn could result
in deadlocks between the rcu_node structure's ->lock and the scheduler's
rq and pi locks. These deadlocks would result from RCU incorrectly
believing that the just-ended RCU read-side critical section had been
preempted and/or boosted. If that RCU read-side critical section was
executed with either rq or pi locks held, RCU's ensuing (incorrect)
calls to the scheduler would cause the scheduler to attempt to once
again acquire the rq and pi locks, resulting in deadlock. More complex
deadlock cycles are also possible, involving multiple rq and pi locks
as well as locks from multiple rcu_node structures.
This commit fixes synchronization by creating ->rcu_boosted field in
task_struct that is accessed and modified only when holding the ->lock
in the rcu_node structure on which the task is queued (on that rcu_node
structure's ->blkd_tasks list). This results in tasks accessing only
their own current->rcu_read_unlock_special fields, making unsynchronized
access once again legal, and keeping the rcu_read_unlock() fastpath free
of atomic instructions and memory barriers.
The reason that the rcu_read_unlock() fastpath does not need to access
the new current->rcu_boosted field is that this new field cannot
be non-zero unless the RCU_READ_UNLOCK_BLOCKED bit is set in the
current->rcu_read_unlock_special field. Therefore, rcu_read_unlock()
need only test current->rcu_read_unlock_special: if that is zero, then
current->rcu_boosted must also be zero.
This bug does not affect TINY_PREEMPT_RCU because this implementation
of RCU accesses current->rcu_read_unlock_special with irqs disabled,
thus preventing races on the !SMP systems that TINY_PREEMPT_RCU runs on.
Maybe-reported-by: Dave Jones <davej@redhat.com>
Maybe-reported-by: Sergey Senozhatsky <sergey.senozhatsky@gmail.com>
Reported-by: Steven Rostedt <rostedt@goodmis.org>
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Reviewed-by: Steven Rostedt <rostedt@goodmis.org>
2011-07-14 21:24:11 +02:00
|
|
|
}
|
2011-02-07 21:47:15 +01:00
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
|
|
|
|
/*
|
|
|
|
* If this was the last task on the current list, and if
|
|
|
|
* we aren't waiting on any CPUs, report the quiescent state.
|
2011-09-21 23:41:37 +02:00
|
|
|
* Note that rcu_report_unblock_qs_rnp() releases rnp->lock,
|
|
|
|
* so we must take a snapshot of the expedited state.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
2011-09-21 23:41:37 +02:00
|
|
|
empty_exp_now = !rcu_preempted_readers_exp(rnp);
|
rcu: Add grace-period, quiescent-state, and call_rcu trace events
Add trace events to record grace-period start and end, quiescent states,
CPUs noticing grace-period start and end, grace-period initialization,
call_rcu() invocation, tasks blocking in RCU read-side critical sections,
tasks exiting those same critical sections, force_quiescent_state()
detection of dyntick-idle and offline CPUs, CPUs entering and leaving
dyntick-idle mode (except from NMIs), CPUs coming online and going
offline, and CPUs being kicked for staying in dyntick-idle mode for too
long (as in many weeks, even on 32-bit systems).
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
rcu: Add the rcu flavor to callback trace events
The earlier trace events for registering RCU callbacks and for invoking
them did not include the RCU flavor (rcu_bh, rcu_preempt, or rcu_sched).
This commit adds the RCU flavor to those trace events.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-25 15:36:56 +02:00
|
|
|
if (!empty && !rcu_preempt_blocked_readers_cgp(rnp)) {
|
|
|
|
trace_rcu_quiescent_state_report("preempt_rcu",
|
|
|
|
rnp->gpnum,
|
|
|
|
0, rnp->qsmask,
|
|
|
|
rnp->level,
|
|
|
|
rnp->grplo,
|
|
|
|
rnp->grphi,
|
|
|
|
!!rnp->gp_tasks);
|
2009-12-02 21:10:13 +01:00
|
|
|
rcu_report_unblock_qs_rnp(rnp, flags);
|
rcu: Add grace-period, quiescent-state, and call_rcu trace events
Add trace events to record grace-period start and end, quiescent states,
CPUs noticing grace-period start and end, grace-period initialization,
call_rcu() invocation, tasks blocking in RCU read-side critical sections,
tasks exiting those same critical sections, force_quiescent_state()
detection of dyntick-idle and offline CPUs, CPUs entering and leaving
dyntick-idle mode (except from NMIs), CPUs coming online and going
offline, and CPUs being kicked for staying in dyntick-idle mode for too
long (as in many weeks, even on 32-bit systems).
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
rcu: Add the rcu flavor to callback trace events
The earlier trace events for registering RCU callbacks and for invoking
them did not include the RCU flavor (rcu_bh, rcu_preempt, or rcu_sched).
This commit adds the RCU flavor to those trace events.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-25 15:36:56 +02:00
|
|
|
} else
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2009-12-02 21:10:15 +01:00
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
/* Unboost if we were boosted. */
|
2011-08-04 16:55:34 +02:00
|
|
|
if (rbmp)
|
|
|
|
rt_mutex_unlock(rbmp);
|
2011-02-07 21:47:15 +01:00
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
|
|
|
|
2009-12-02 21:10:15 +01:00
|
|
|
/*
|
|
|
|
* If this was the last task on the expedited lists,
|
|
|
|
* then we need to report up the rcu_node hierarchy.
|
|
|
|
*/
|
2011-09-21 23:41:37 +02:00
|
|
|
if (!empty_exp && empty_exp_now)
|
2011-10-22 16:12:34 +02:00
|
|
|
rcu_report_exp_rnp(&rcu_preempt_state, rnp, true);
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
} else {
|
|
|
|
local_irq_restore(flags);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Tree-preemptible RCU implementation for rcu_read_unlock().
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* Decrement ->rcu_read_lock_nesting. If the result is zero (outermost
|
|
|
|
* rcu_read_unlock()) and ->rcu_read_unlock_special is non-zero, then
|
|
|
|
* invoke rcu_read_unlock_special() to clean up after a context switch
|
|
|
|
* in an RCU read-side critical section and other special cases.
|
|
|
|
*/
|
|
|
|
void __rcu_read_unlock(void)
|
|
|
|
{
|
|
|
|
struct task_struct *t = current;
|
|
|
|
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
if (t->rcu_read_lock_nesting != 1)
|
|
|
|
--t->rcu_read_lock_nesting;
|
|
|
|
else {
|
2011-08-01 15:22:11 +02:00
|
|
|
barrier(); /* critical section before exit code. */
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
t->rcu_read_lock_nesting = INT_MIN;
|
|
|
|
barrier(); /* assign before ->rcu_read_unlock_special load */
|
2011-05-21 14:57:18 +02:00
|
|
|
if (unlikely(ACCESS_ONCE(t->rcu_read_unlock_special)))
|
|
|
|
rcu_read_unlock_special(t);
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
barrier(); /* ->rcu_read_unlock_special load before assign */
|
|
|
|
t->rcu_read_lock_nesting = 0;
|
2011-05-21 14:57:18 +02:00
|
|
|
}
|
2010-01-05 01:04:01 +01:00
|
|
|
#ifdef CONFIG_PROVE_LOCKING
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
{
|
|
|
|
int rrln = ACCESS_ONCE(t->rcu_read_lock_nesting);
|
|
|
|
|
|
|
|
WARN_ON_ONCE(rrln < 0 && rrln > INT_MIN / 2);
|
|
|
|
}
|
2010-01-05 01:04:01 +01:00
|
|
|
#endif /* #ifdef CONFIG_PROVE_LOCKING */
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(__rcu_read_unlock);
|
|
|
|
|
2010-02-23 02:05:05 +01:00
|
|
|
#ifdef CONFIG_RCU_CPU_STALL_VERBOSE
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Dump detailed information for all tasks blocking the current RCU
|
|
|
|
* grace period on the specified rcu_node structure.
|
|
|
|
*/
|
|
|
|
static void rcu_print_detail_task_stall_rnp(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
if (!rcu_preempt_blocked_readers_cgp(rnp))
|
2010-11-30 06:56:39 +01:00
|
|
|
return;
|
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
t = list_entry(rnp->gp_tasks,
|
|
|
|
struct task_struct, rcu_node_entry);
|
|
|
|
list_for_each_entry_continue(t, &rnp->blkd_tasks, rcu_node_entry)
|
|
|
|
sched_show_task(t);
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2010-02-23 02:05:05 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Dump detailed information for all tasks blocking the current RCU
|
|
|
|
* grace period.
|
|
|
|
*/
|
|
|
|
static void rcu_print_detail_task_stall(struct rcu_state *rsp)
|
|
|
|
{
|
|
|
|
struct rcu_node *rnp = rcu_get_root(rsp);
|
|
|
|
|
|
|
|
rcu_print_detail_task_stall_rnp(rnp);
|
|
|
|
rcu_for_each_leaf_node(rsp, rnp)
|
|
|
|
rcu_print_detail_task_stall_rnp(rnp);
|
|
|
|
}
|
|
|
|
|
|
|
|
#else /* #ifdef CONFIG_RCU_CPU_STALL_VERBOSE */
|
|
|
|
|
|
|
|
static void rcu_print_detail_task_stall(struct rcu_state *rsp)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #else #ifdef CONFIG_RCU_CPU_STALL_VERBOSE */
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
|
|
|
* Scan the current list of tasks blocked within RCU read-side critical
|
|
|
|
* sections, printing out the tid of each.
|
|
|
|
*/
|
2011-08-13 22:31:47 +02:00
|
|
|
static int rcu_print_task_stall(struct rcu_node *rnp)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
struct task_struct *t;
|
2011-08-13 22:31:47 +02:00
|
|
|
int ndetected = 0;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
if (!rcu_preempt_blocked_readers_cgp(rnp))
|
2011-08-13 22:31:47 +02:00
|
|
|
return 0;
|
2010-11-30 06:56:39 +01:00
|
|
|
t = list_entry(rnp->gp_tasks,
|
|
|
|
struct task_struct, rcu_node_entry);
|
2011-08-13 22:31:47 +02:00
|
|
|
list_for_each_entry_continue(t, &rnp->blkd_tasks, rcu_node_entry) {
|
2010-11-30 06:56:39 +01:00
|
|
|
printk(" P%d", t->pid);
|
2011-08-13 22:31:47 +02:00
|
|
|
ndetected++;
|
|
|
|
}
|
|
|
|
return ndetected;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
2010-08-10 23:28:53 +02:00
|
|
|
/*
|
|
|
|
* Suppress preemptible RCU's CPU stall warnings by pushing the
|
|
|
|
* time of the next stall-warning message comfortably far into the
|
|
|
|
* future.
|
|
|
|
*/
|
|
|
|
static void rcu_preempt_stall_reset(void)
|
|
|
|
{
|
|
|
|
rcu_preempt_state.jiffies_stall = jiffies + ULONG_MAX / 2;
|
|
|
|
}
|
|
|
|
|
2009-09-13 18:15:09 +02:00
|
|
|
/*
|
|
|
|
* Check that the list of blocked tasks for the newly completed grace
|
|
|
|
* period is in fact empty. It is a serious bug to complete a grace
|
|
|
|
* period that still has RCU readers blocked! This function must be
|
|
|
|
* invoked -before- updating this rnp's ->gpnum, and the rnp's ->lock
|
|
|
|
* must be held by the caller.
|
2010-11-30 06:56:39 +01:00
|
|
|
*
|
|
|
|
* Also, if there are blocked tasks on the list, they automatically
|
|
|
|
* block the newly created grace period, so set up ->gp_tasks accordingly.
|
2009-09-13 18:15:09 +02:00
|
|
|
*/
|
|
|
|
static void rcu_preempt_check_blocked_tasks(struct rcu_node *rnp)
|
|
|
|
{
|
2011-02-07 21:47:15 +01:00
|
|
|
WARN_ON_ONCE(rcu_preempt_blocked_readers_cgp(rnp));
|
2010-11-30 06:56:39 +01:00
|
|
|
if (!list_empty(&rnp->blkd_tasks))
|
|
|
|
rnp->gp_tasks = rnp->blkd_tasks.next;
|
2009-09-18 18:50:17 +02:00
|
|
|
WARN_ON_ONCE(rnp->qsmask);
|
2009-09-13 18:15:09 +02:00
|
|
|
}
|
|
|
|
|
2009-08-24 18:42:01 +02:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
2009-08-27 23:58:16 +02:00
|
|
|
/*
|
|
|
|
* Handle tasklist migration for case in which all CPUs covered by the
|
|
|
|
* specified rcu_node have gone offline. Move them up to the root
|
|
|
|
* rcu_node. The reason for not just moving them to the immediate
|
|
|
|
* parent is to remove the need for rcu_read_unlock_special() to
|
|
|
|
* make more than two attempts to acquire the target rcu_node's lock.
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
* Returns true if there were tasks blocking the current RCU grace
|
|
|
|
* period.
|
2009-08-27 23:58:16 +02:00
|
|
|
*
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
* Returns 1 if there was previously a task blocking the current grace
|
|
|
|
* period on the specified rcu_node structure.
|
|
|
|
*
|
2009-08-27 23:58:16 +02:00
|
|
|
* The caller must hold rnp->lock with irqs disabled.
|
|
|
|
*/
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
static int rcu_preempt_offline_tasks(struct rcu_state *rsp,
|
|
|
|
struct rcu_node *rnp,
|
|
|
|
struct rcu_data *rdp)
|
2009-08-27 23:58:16 +02:00
|
|
|
{
|
|
|
|
struct list_head *lp;
|
|
|
|
struct list_head *lp_root;
|
2009-12-02 21:10:15 +01:00
|
|
|
int retval = 0;
|
2009-08-27 23:58:16 +02:00
|
|
|
struct rcu_node *rnp_root = rcu_get_root(rsp);
|
2010-11-30 06:56:39 +01:00
|
|
|
struct task_struct *t;
|
2009-08-27 23:58:16 +02:00
|
|
|
|
2009-08-28 00:00:12 +02:00
|
|
|
if (rnp == rnp_root) {
|
|
|
|
WARN_ONCE(1, "Last CPU thought to be offlined?");
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
return 0; /* Shouldn't happen: at least one CPU online. */
|
2009-08-28 00:00:12 +02:00
|
|
|
}
|
2010-11-30 06:56:39 +01:00
|
|
|
|
|
|
|
/* If we are on an internal node, complain bitterly. */
|
|
|
|
WARN_ON_ONCE(rnp != rdp->mynode);
|
2009-08-27 23:58:16 +02:00
|
|
|
|
|
|
|
/*
|
2010-11-30 06:56:39 +01:00
|
|
|
* Move tasks up to root rcu_node. Don't try to get fancy for
|
|
|
|
* this corner-case operation -- just put this node's tasks
|
|
|
|
* at the head of the root node's list, and update the root node's
|
|
|
|
* ->gp_tasks and ->exp_tasks pointers to those of this node's,
|
|
|
|
* if non-NULL. This might result in waiting for more tasks than
|
|
|
|
* absolutely necessary, but this is a good performance/complexity
|
|
|
|
* tradeoff.
|
2009-08-27 23:58:16 +02:00
|
|
|
*/
|
2011-02-07 21:47:15 +01:00
|
|
|
if (rcu_preempt_blocked_readers_cgp(rnp))
|
2009-12-02 21:10:15 +01:00
|
|
|
retval |= RCU_OFL_TASKS_NORM_GP;
|
|
|
|
if (rcu_preempted_readers_exp(rnp))
|
|
|
|
retval |= RCU_OFL_TASKS_EXP_GP;
|
2010-11-30 06:56:39 +01:00
|
|
|
lp = &rnp->blkd_tasks;
|
|
|
|
lp_root = &rnp_root->blkd_tasks;
|
|
|
|
while (!list_empty(lp)) {
|
|
|
|
t = list_entry(lp->next, typeof(*t), rcu_node_entry);
|
|
|
|
raw_spin_lock(&rnp_root->lock); /* irqs already disabled */
|
|
|
|
list_del(&t->rcu_node_entry);
|
|
|
|
t->rcu_blocked_node = rnp_root;
|
|
|
|
list_add(&t->rcu_node_entry, lp_root);
|
|
|
|
if (&t->rcu_node_entry == rnp->gp_tasks)
|
|
|
|
rnp_root->gp_tasks = rnp->gp_tasks;
|
|
|
|
if (&t->rcu_node_entry == rnp->exp_tasks)
|
|
|
|
rnp_root->exp_tasks = rnp->exp_tasks;
|
2011-02-07 21:47:15 +01:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
if (&t->rcu_node_entry == rnp->boost_tasks)
|
|
|
|
rnp_root->boost_tasks = rnp->boost_tasks;
|
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
2010-11-30 06:56:39 +01:00
|
|
|
raw_spin_unlock(&rnp_root->lock); /* irqs still disabled */
|
2009-08-27 23:58:16 +02:00
|
|
|
}
|
2011-02-07 21:47:15 +01:00
|
|
|
|
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
/* In case root is being boosted and leaf is not. */
|
|
|
|
raw_spin_lock(&rnp_root->lock); /* irqs already disabled */
|
|
|
|
if (rnp_root->boost_tasks != NULL &&
|
|
|
|
rnp_root->boost_tasks != rnp_root->gp_tasks)
|
|
|
|
rnp_root->boost_tasks = rnp_root->gp_tasks;
|
|
|
|
raw_spin_unlock(&rnp_root->lock); /* irqs still disabled */
|
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
|
|
|
|
2010-11-30 06:56:39 +01:00
|
|
|
rnp->gp_tasks = NULL;
|
|
|
|
rnp->exp_tasks = NULL;
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
return retval;
|
2009-08-27 23:58:16 +02:00
|
|
|
}
|
|
|
|
|
2009-08-24 18:42:01 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Do CPU-offline processing for preemptible RCU.
|
2009-08-24 18:42:01 +02:00
|
|
|
*/
|
|
|
|
static void rcu_preempt_offline_cpu(int cpu)
|
|
|
|
{
|
|
|
|
__rcu_offline_cpu(cpu, &rcu_preempt_state);
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
|
|
|
* Check for a quiescent state from the current CPU. When a task blocks,
|
|
|
|
* the task is recorded in the corresponding CPU's rcu_node structure,
|
|
|
|
* which is checked elsewhere.
|
|
|
|
*
|
|
|
|
* Caller must disable hard irqs.
|
|
|
|
*/
|
|
|
|
static void rcu_preempt_check_callbacks(int cpu)
|
|
|
|
{
|
|
|
|
struct task_struct *t = current;
|
|
|
|
|
|
|
|
if (t->rcu_read_lock_nesting == 0) {
|
2009-09-13 18:15:10 +02:00
|
|
|
rcu_preempt_qs(cpu);
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
return;
|
|
|
|
}
|
rcu: protect __rcu_read_unlock() against scheduler-using irq handlers
The addition of RCU read-side critical sections within runqueue and
priority-inheritance lock critical sections introduced some deadlock
cycles, for example, involving interrupts from __rcu_read_unlock()
where the interrupt handlers call wake_up(). This situation can cause
the instance of __rcu_read_unlock() invoked from interrupt to do some
of the processing that would otherwise have been carried out by the
task-level instance of __rcu_read_unlock(). When the interrupt-level
instance of __rcu_read_unlock() is called with a scheduler lock held
from interrupt-entry/exit situations where in_irq() returns false,
deadlock can result.
This commit resolves these deadlocks by using negative values of
the per-task ->rcu_read_lock_nesting counter to indicate that an
instance of __rcu_read_unlock() is in flight, which in turn prevents
instances from interrupt handlers from doing any special processing.
This patch is inspired by Steven Rostedt's earlier patch that similarly
made __rcu_read_unlock() guard against interrupt-mediated recursion
(see https://lkml.org/lkml/2011/7/15/326), but this commit refines
Steven's approach to avoid the need for preemption disabling on the
__rcu_read_unlock() fastpath and to also avoid the need for manipulating
a separate per-CPU variable.
This patch avoids need for preempt_disable() by instead using negative
values of the per-task ->rcu_read_lock_nesting counter. Note that nested
rcu_read_lock()/rcu_read_unlock() pairs are still permitted, but they will
never see ->rcu_read_lock_nesting go to zero, and will therefore never
invoke rcu_read_unlock_special(), thus preventing them from seeing the
RCU_READ_UNLOCK_BLOCKED bit should it be set in ->rcu_read_unlock_special.
This patch also adds a check for ->rcu_read_unlock_special being negative
in rcu_check_callbacks(), thus preventing the RCU_READ_UNLOCK_NEED_QS
bit from being set should a scheduling-clock interrupt occur while
__rcu_read_unlock() is exiting from an outermost RCU read-side critical
section.
Of course, __rcu_read_unlock() can be preempted during the time that
->rcu_read_lock_nesting is negative. This could result in the setting
of the RCU_READ_UNLOCK_BLOCKED bit after __rcu_read_unlock() checks it,
and would also result it this task being queued on the corresponding
rcu_node structure's blkd_tasks list. Therefore, some later RCU read-side
critical section would enter rcu_read_unlock_special() to clean up --
which could result in deadlock if that critical section happened to be in
the scheduler where the runqueue or priority-inheritance locks were held.
This situation is dealt with by making rcu_preempt_note_context_switch()
check for negative ->rcu_read_lock_nesting, thus refraining from
queuing the task (and from setting RCU_READ_UNLOCK_BLOCKED) if we are
already exiting from the outermost RCU read-side critical section (in
other words, we really are no longer actually in that RCU read-side
critical section). In addition, rcu_preempt_note_context_switch()
invokes rcu_read_unlock_special() to carry out the cleanup in this case,
which clears out the ->rcu_read_unlock_special bits and dequeues the task
(if necessary), in turn avoiding needless delay of the current RCU grace
period and needless RCU priority boosting.
It is still illegal to call rcu_read_unlock() while holding a scheduler
lock if the prior RCU read-side critical section has ever had either
preemption or irqs enabled. However, the common use case is legal,
namely where then entire RCU read-side critical section executes with
irqs disabled, for example, when the scheduler lock is held across the
entire lifetime of the RCU read-side critical section.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-07-18 06:14:35 +02:00
|
|
|
if (t->rcu_read_lock_nesting > 0 &&
|
|
|
|
per_cpu(rcu_preempt_data, cpu).qs_pending)
|
2009-09-13 18:15:10 +02:00
|
|
|
t->rcu_read_unlock_special |= RCU_READ_UNLOCK_NEED_QS;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Process callbacks for preemptible RCU.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
static void rcu_preempt_process_callbacks(void)
|
|
|
|
{
|
|
|
|
__rcu_process_callbacks(&rcu_preempt_state,
|
|
|
|
&__get_cpu_var(rcu_preempt_data));
|
|
|
|
}
|
|
|
|
|
2011-06-16 00:47:09 +02:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
|
rcu: Use softirq to address performance regression
Commit a26ac2455ffcf3(rcu: move TREE_RCU from softirq to kthread)
introduced performance regression. In an AIM7 test, this commit degraded
performance by about 40%.
The commit runs rcu callbacks in a kthread instead of softirq. We observed
high rate of context switch which is caused by this. Out test system has
64 CPUs and HZ is 1000, so we saw more than 64k context switch per second
which is caused by RCU's per-CPU kthread. A trace showed that most of
the time the RCU per-CPU kthread doesn't actually handle any callbacks,
but instead just does a very small amount of work handling grace periods.
This means that RCU's per-CPU kthreads are making the scheduler do quite
a bit of work in order to allow a very small amount of RCU-related
processing to be done.
Alex Shi's analysis determined that this slowdown is due to lock
contention within the scheduler. Unfortunately, as Peter Zijlstra points
out, the scheduler's real-time semantics require global action, which
means that this contention is inherent in real-time scheduling. (Yes,
perhaps someone will come up with a workaround -- otherwise, -rt is not
going to do well on large SMP systems -- but this patch will work around
this issue in the meantime. And "the meantime" might well be forever.)
This patch therefore re-introduces softirq processing to RCU, but only
for core RCU work. RCU callbacks are still executed in kthread context,
so that only a small amount of RCU work runs in softirq context in the
common case. This should minimize ksoftirqd execution, allowing us to
skip boosting of ksoftirqd for CONFIG_RCU_BOOST=y kernels.
Signed-off-by: Shaohua Li <shaohua.li@intel.com>
Tested-by: "Alex,Shi" <alex.shi@intel.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-06-14 07:26:25 +02:00
|
|
|
static void rcu_preempt_do_callbacks(void)
|
|
|
|
{
|
|
|
|
rcu_do_batch(&rcu_preempt_state, &__get_cpu_var(rcu_preempt_data));
|
|
|
|
}
|
|
|
|
|
2011-06-16 00:47:09 +02:00
|
|
|
#endif /* #ifdef CONFIG_RCU_BOOST */
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Queue a preemptible-RCU callback for invocation after a grace period.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
void call_rcu(struct rcu_head *head, void (*func)(struct rcu_head *rcu))
|
|
|
|
{
|
|
|
|
__call_rcu(head, func, &rcu_preempt_state);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(call_rcu);
|
|
|
|
|
2009-11-22 17:53:50 +01:00
|
|
|
/**
|
|
|
|
* synchronize_rcu - wait until a grace period has elapsed.
|
|
|
|
*
|
|
|
|
* Control will return to the caller some time after a full grace
|
|
|
|
* period has elapsed, in other words after all currently executing RCU
|
2010-07-09 02:38:59 +02:00
|
|
|
* read-side critical sections have completed. Note, however, that
|
|
|
|
* upon return from synchronize_rcu(), the caller might well be executing
|
|
|
|
* concurrently with new RCU read-side critical sections that began while
|
|
|
|
* synchronize_rcu() was waiting. RCU read-side critical sections are
|
|
|
|
* delimited by rcu_read_lock() and rcu_read_unlock(), and may be nested.
|
2009-11-22 17:53:50 +01:00
|
|
|
*/
|
|
|
|
void synchronize_rcu(void)
|
|
|
|
{
|
|
|
|
if (!rcu_scheduler_active)
|
|
|
|
return;
|
2011-05-27 07:14:36 +02:00
|
|
|
wait_rcu_gp(call_rcu);
|
2009-11-22 17:53:50 +01:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(synchronize_rcu);
|
|
|
|
|
2009-12-02 21:10:15 +01:00
|
|
|
static DECLARE_WAIT_QUEUE_HEAD(sync_rcu_preempt_exp_wq);
|
|
|
|
static long sync_rcu_preempt_exp_count;
|
|
|
|
static DEFINE_MUTEX(sync_rcu_preempt_exp_mutex);
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Return non-zero if there are any tasks in RCU read-side critical
|
|
|
|
* sections blocking the current preemptible-RCU expedited grace period.
|
|
|
|
* If there is no preemptible-RCU expedited grace period currently in
|
|
|
|
* progress, returns zero unconditionally.
|
|
|
|
*/
|
|
|
|
static int rcu_preempted_readers_exp(struct rcu_node *rnp)
|
|
|
|
{
|
2010-11-30 06:56:39 +01:00
|
|
|
return rnp->exp_tasks != NULL;
|
2009-12-02 21:10:15 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* return non-zero if there is no RCU expedited grace period in progress
|
|
|
|
* for the specified rcu_node structure, in other words, if all CPUs and
|
|
|
|
* tasks covered by the specified rcu_node structure have done their bit
|
|
|
|
* for the current expedited grace period. Works only for preemptible
|
|
|
|
* RCU -- other RCU implementation use other means.
|
|
|
|
*
|
|
|
|
* Caller must hold sync_rcu_preempt_exp_mutex.
|
|
|
|
*/
|
|
|
|
static int sync_rcu_preempt_exp_done(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
return !rcu_preempted_readers_exp(rnp) &&
|
|
|
|
ACCESS_ONCE(rnp->expmask) == 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Report the exit from RCU read-side critical section for the last task
|
|
|
|
* that queued itself during or before the current expedited preemptible-RCU
|
|
|
|
* grace period. This event is reported either to the rcu_node structure on
|
|
|
|
* which the task was queued or to one of that rcu_node structure's ancestors,
|
|
|
|
* recursively up the tree. (Calm down, calm down, we do the recursion
|
|
|
|
* iteratively!)
|
|
|
|
*
|
2011-10-22 16:12:34 +02:00
|
|
|
* Most callers will set the "wake" flag, but the task initiating the
|
|
|
|
* expedited grace period need not wake itself.
|
|
|
|
*
|
2009-12-02 21:10:15 +01:00
|
|
|
* Caller must hold sync_rcu_preempt_exp_mutex.
|
|
|
|
*/
|
2011-10-22 16:12:34 +02:00
|
|
|
static void rcu_report_exp_rnp(struct rcu_state *rsp, struct rcu_node *rnp,
|
|
|
|
bool wake)
|
2009-12-02 21:10:15 +01:00
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
unsigned long mask;
|
|
|
|
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
2009-12-02 21:10:15 +01:00
|
|
|
for (;;) {
|
2011-07-17 11:05:49 +02:00
|
|
|
if (!sync_rcu_preempt_exp_done(rnp)) {
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2009-12-02 21:10:15 +01:00
|
|
|
break;
|
2011-07-17 11:05:49 +02:00
|
|
|
}
|
2009-12-02 21:10:15 +01:00
|
|
|
if (rnp->parent == NULL) {
|
2011-07-17 11:05:49 +02:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2011-10-22 16:12:34 +02:00
|
|
|
if (wake)
|
|
|
|
wake_up(&sync_rcu_preempt_exp_wq);
|
2009-12-02 21:10:15 +01:00
|
|
|
break;
|
|
|
|
}
|
|
|
|
mask = rnp->grpmask;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock(&rnp->lock); /* irqs remain disabled */
|
2009-12-02 21:10:15 +01:00
|
|
|
rnp = rnp->parent;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock(&rnp->lock); /* irqs already disabled */
|
2009-12-02 21:10:15 +01:00
|
|
|
rnp->expmask &= ~mask;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Snapshot the tasks blocking the newly started preemptible-RCU expedited
|
|
|
|
* grace period for the specified rcu_node structure. If there are no such
|
|
|
|
* tasks, report it up the rcu_node hierarchy.
|
|
|
|
*
|
|
|
|
* Caller must hold sync_rcu_preempt_exp_mutex and rsp->onofflock.
|
|
|
|
*/
|
|
|
|
static void
|
|
|
|
sync_rcu_preempt_exp_init(struct rcu_state *rsp, struct rcu_node *rnp)
|
|
|
|
{
|
2011-05-05 06:43:49 +02:00
|
|
|
unsigned long flags;
|
2010-11-30 06:56:39 +01:00
|
|
|
int must_wait = 0;
|
2009-12-02 21:10:15 +01:00
|
|
|
|
2011-05-05 06:43:49 +02:00
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
if (list_empty(&rnp->blkd_tasks))
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
|
|
|
else {
|
2010-11-30 06:56:39 +01:00
|
|
|
rnp->exp_tasks = rnp->blkd_tasks.next;
|
2011-05-05 06:43:49 +02:00
|
|
|
rcu_initiate_boost(rnp, flags); /* releases rnp->lock */
|
2010-11-30 06:56:39 +01:00
|
|
|
must_wait = 1;
|
|
|
|
}
|
2009-12-02 21:10:15 +01:00
|
|
|
if (!must_wait)
|
2011-10-22 16:12:34 +02:00
|
|
|
rcu_report_exp_rnp(rsp, rnp, false); /* Don't wake self. */
|
2009-12-02 21:10:15 +01:00
|
|
|
}
|
|
|
|
|
2009-10-14 19:15:56 +02:00
|
|
|
/*
|
2009-12-02 21:10:15 +01:00
|
|
|
* Wait for an rcu-preempt grace period, but expedite it. The basic idea
|
|
|
|
* is to invoke synchronize_sched_expedited() to push all the tasks to
|
2010-11-30 06:56:39 +01:00
|
|
|
* the ->blkd_tasks lists and wait for this list to drain.
|
2009-10-14 19:15:56 +02:00
|
|
|
*/
|
|
|
|
void synchronize_rcu_expedited(void)
|
|
|
|
{
|
2009-12-02 21:10:15 +01:00
|
|
|
unsigned long flags;
|
|
|
|
struct rcu_node *rnp;
|
|
|
|
struct rcu_state *rsp = &rcu_preempt_state;
|
|
|
|
long snap;
|
|
|
|
int trycount = 0;
|
|
|
|
|
|
|
|
smp_mb(); /* Caller's modifications seen first by other CPUs. */
|
|
|
|
snap = ACCESS_ONCE(sync_rcu_preempt_exp_count) + 1;
|
|
|
|
smp_mb(); /* Above access cannot bleed into critical section. */
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Acquire lock, falling back to synchronize_rcu() if too many
|
|
|
|
* lock-acquisition failures. Of course, if someone does the
|
|
|
|
* expedited grace period for us, just leave.
|
|
|
|
*/
|
|
|
|
while (!mutex_trylock(&sync_rcu_preempt_exp_mutex)) {
|
|
|
|
if (trycount++ < 10)
|
|
|
|
udelay(trycount * num_online_cpus());
|
|
|
|
else {
|
|
|
|
synchronize_rcu();
|
|
|
|
return;
|
|
|
|
}
|
|
|
|
if ((ACCESS_ONCE(sync_rcu_preempt_exp_count) - snap) > 0)
|
|
|
|
goto mb_ret; /* Others did our work for us. */
|
|
|
|
}
|
|
|
|
if ((ACCESS_ONCE(sync_rcu_preempt_exp_count) - snap) > 0)
|
|
|
|
goto unlock_mb_ret; /* Others did our work for us. */
|
|
|
|
|
2010-11-30 06:56:39 +01:00
|
|
|
/* force all RCU readers onto ->blkd_tasks lists. */
|
2009-12-02 21:10:15 +01:00
|
|
|
synchronize_sched_expedited();
|
|
|
|
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock_irqsave(&rsp->onofflock, flags);
|
2009-12-02 21:10:15 +01:00
|
|
|
|
|
|
|
/* Initialize ->expmask for all non-leaf rcu_node structures. */
|
|
|
|
rcu_for_each_nonleaf_node_breadth_first(rsp, rnp) {
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_lock(&rnp->lock); /* irqs already disabled. */
|
2009-12-02 21:10:15 +01:00
|
|
|
rnp->expmask = rnp->qsmaskinit;
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock(&rnp->lock); /* irqs remain disabled. */
|
2009-12-02 21:10:15 +01:00
|
|
|
}
|
|
|
|
|
2010-11-30 06:56:39 +01:00
|
|
|
/* Snapshot current state of ->blkd_tasks lists. */
|
2009-12-02 21:10:15 +01:00
|
|
|
rcu_for_each_leaf_node(rsp, rnp)
|
|
|
|
sync_rcu_preempt_exp_init(rsp, rnp);
|
|
|
|
if (NUM_RCU_NODES > 1)
|
|
|
|
sync_rcu_preempt_exp_init(rsp, rcu_get_root(rsp));
|
|
|
|
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock_irqrestore(&rsp->onofflock, flags);
|
2009-12-02 21:10:15 +01:00
|
|
|
|
2010-11-30 06:56:39 +01:00
|
|
|
/* Wait for snapshotted ->blkd_tasks lists to drain. */
|
2009-12-02 21:10:15 +01:00
|
|
|
rnp = rcu_get_root(rsp);
|
|
|
|
wait_event(sync_rcu_preempt_exp_wq,
|
|
|
|
sync_rcu_preempt_exp_done(rnp));
|
|
|
|
|
|
|
|
/* Clean up and exit. */
|
|
|
|
smp_mb(); /* ensure expedited GP seen before counter increment. */
|
|
|
|
ACCESS_ONCE(sync_rcu_preempt_exp_count)++;
|
|
|
|
unlock_mb_ret:
|
|
|
|
mutex_unlock(&sync_rcu_preempt_exp_mutex);
|
|
|
|
mb_ret:
|
|
|
|
smp_mb(); /* ensure subsequent action seen after grace period. */
|
2009-10-14 19:15:56 +02:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(synchronize_rcu_expedited);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Check to see if there is any immediate preemptible-RCU-related work
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* to be done.
|
|
|
|
*/
|
|
|
|
static int rcu_preempt_pending(int cpu)
|
|
|
|
{
|
|
|
|
return __rcu_pending(&rcu_preempt_state,
|
|
|
|
&per_cpu(rcu_preempt_data, cpu));
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Does preemptible RCU need the CPU to stay out of dynticks mode?
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
static int rcu_preempt_needs_cpu(int cpu)
|
|
|
|
{
|
|
|
|
return !!per_cpu(rcu_preempt_data, cpu).nxtlist;
|
|
|
|
}
|
|
|
|
|
2009-10-07 06:48:17 +02:00
|
|
|
/**
|
|
|
|
* rcu_barrier - Wait until all in-flight call_rcu() callbacks complete.
|
|
|
|
*/
|
|
|
|
void rcu_barrier(void)
|
|
|
|
{
|
|
|
|
_rcu_barrier(&rcu_preempt_state, call_rcu);
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_barrier);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Initialize preemptible RCU's per-CPU data.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
static void __cpuinit rcu_preempt_init_percpu_data(int cpu)
|
|
|
|
{
|
|
|
|
rcu_init_percpu_data(cpu, &rcu_preempt_state, 1);
|
|
|
|
}
|
|
|
|
|
2009-10-07 06:48:17 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Move preemptible RCU's callbacks from dying CPU to other online CPU.
|
2009-10-07 06:48:17 +02:00
|
|
|
*/
|
2010-10-20 08:13:06 +02:00
|
|
|
static void rcu_preempt_send_cbs_to_online(void)
|
2009-10-07 06:48:17 +02:00
|
|
|
{
|
2010-10-20 08:13:06 +02:00
|
|
|
rcu_send_cbs_to_online(&rcu_preempt_state);
|
2009-10-07 06:48:17 +02:00
|
|
|
}
|
|
|
|
|
2009-09-23 18:50:42 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Initialize preemptible RCU's state structures.
|
2009-09-23 18:50:42 +02:00
|
|
|
*/
|
|
|
|
static void __init __rcu_init_preempt(void)
|
|
|
|
{
|
2010-06-28 10:25:04 +02:00
|
|
|
rcu_init_one(&rcu_preempt_state, &rcu_preempt_data);
|
2009-09-23 18:50:42 +02:00
|
|
|
}
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Check for a task exiting while in a preemptible-RCU read-side
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* critical section, clean up if so. No need to issue warnings,
|
|
|
|
* as debug_check_no_locks_held() already does this if lockdep
|
|
|
|
* is enabled.
|
|
|
|
*/
|
|
|
|
void exit_rcu(void)
|
|
|
|
{
|
|
|
|
struct task_struct *t = current;
|
|
|
|
|
|
|
|
if (t->rcu_read_lock_nesting == 0)
|
|
|
|
return;
|
|
|
|
t->rcu_read_lock_nesting = 1;
|
2011-02-25 20:37:59 +01:00
|
|
|
__rcu_read_unlock();
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
#else /* #ifdef CONFIG_TREE_PREEMPT_RCU */
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
static struct rcu_state *rcu_state = &rcu_sched_state;
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
|
|
|
* Tell them what RCU they are running.
|
|
|
|
*/
|
2009-11-11 20:28:06 +01:00
|
|
|
static void __init rcu_bootup_announce(void)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
printk(KERN_INFO "Hierarchical RCU implementation.\n");
|
2010-04-13 23:19:23 +02:00
|
|
|
rcu_bootup_announce_oddness();
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Return the number of RCU batches processed thus far for debug & stats.
|
|
|
|
*/
|
|
|
|
long rcu_batches_completed(void)
|
|
|
|
{
|
|
|
|
return rcu_batches_completed_sched();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_batches_completed);
|
|
|
|
|
2010-01-05 00:09:10 +01:00
|
|
|
/*
|
|
|
|
* Force a quiescent state for RCU, which, because there is no preemptible
|
|
|
|
* RCU, becomes the same as rcu-sched.
|
|
|
|
*/
|
|
|
|
void rcu_force_quiescent_state(void)
|
|
|
|
{
|
|
|
|
rcu_sched_force_quiescent_state();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_force_quiescent_state);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, we never have to check for
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* CPUs being in quiescent states.
|
|
|
|
*/
|
2009-09-13 18:15:10 +02:00
|
|
|
static void rcu_preempt_note_context_switch(int cpu)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2009-09-23 18:50:41 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, there are never any preempted
|
2009-09-23 18:50:41 +02:00
|
|
|
* RCU readers.
|
|
|
|
*/
|
2011-02-07 21:47:15 +01:00
|
|
|
static int rcu_preempt_blocked_readers_cgp(struct rcu_node *rnp)
|
2009-09-23 18:50:41 +02:00
|
|
|
{
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
|
|
|
/* Because preemptible RCU does not exist, no quieting of tasks. */
|
2009-12-02 21:10:13 +01:00
|
|
|
static void rcu_report_unblock_qs_rnp(struct rcu_node *rnp, unsigned long flags)
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
{
|
2010-02-23 02:05:02 +01:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
rcu: Fix grace-period-stall bug on large systems with CPU hotplug
When the last CPU of a given leaf rcu_node structure goes
offline, all of the tasks queued on that leaf rcu_node structure
(due to having blocked in their current RCU read-side critical
sections) are requeued onto the root rcu_node structure. This
requeuing is carried out by rcu_preempt_offline_tasks().
However, it is possible that these queued tasks are the only
thing preventing the leaf rcu_node structure from reporting a
quiescent state up the rcu_node hierarchy. Unfortunately, the
old code would fail to do this reporting, resulting in a
grace-period stall given the following sequence of events:
1. Kernel built for more than 32 CPUs on 32-bit systems or for more
than 64 CPUs on 64-bit systems, so that there is more than one
rcu_node structure. (Or CONFIG_RCU_FANOUT is artificially set
to a number smaller than CONFIG_NR_CPUS.)
2. The kernel is built with CONFIG_TREE_PREEMPT_RCU.
3. A task running on a CPU associated with a given leaf rcu_node
structure blocks while in an RCU read-side critical section
-and- that CPU has not yet passed through a quiescent state
for the current RCU grace period. This will cause the task
to be queued on the leaf rcu_node's blocked_tasks[] array, in
particular, on the element of this array corresponding to the
current grace period.
4. Each of the remaining CPUs corresponding to this same leaf rcu_node
structure pass through a quiescent state. However, the task is
still in its RCU read-side critical section, so these quiescent
states cannot be reported further up the rcu_node hierarchy.
Nevertheless, all bits in the leaf rcu_node structure's ->qsmask
field are now zero.
5. Each of the remaining CPUs go offline. (The events in step
#4 and #5 can happen in any order as long as each CPU passes
through a quiescent state before going offline.)
6. When the last CPU goes offline, __rcu_offline_cpu() will invoke
rcu_preempt_offline_tasks(), which will move the task to the
root rcu_node structure, but without reporting a quiescent state
up the rcu_node hierarchy (and this failure to report a quiescent
state is the bug).
But because this leaf rcu_node structure's ->qsmask field is
already zero and its ->block_tasks[] entries are all empty,
force_quiescent_state() will skip this rcu_node structure.
Therefore, grace periods are now hung.
This patch abstracts some code out of rcu_read_unlock_special(),
calling the result task_quiet() by analogy with cpu_quiet(), and
invokes task_quiet() from both rcu_read_lock_special() and
__rcu_offline_cpu(). Invoking task_quiet() from
__rcu_offline_cpu() reports the quiescent state up the rcu_node
hierarchy, fixing the bug. This ends up requiring a separate
lock_class_key per level of the rcu_node hierarchy, which this
patch also provides.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <12589088301770-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-11-22 17:53:48 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
2010-02-23 02:05:05 +01:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, we never have to check for
|
2010-02-23 02:05:05 +01:00
|
|
|
* tasks blocked within RCU read-side critical sections.
|
|
|
|
*/
|
|
|
|
static void rcu_print_detail_task_stall(struct rcu_state *rsp)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, we never have to check for
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* tasks blocked within RCU read-side critical sections.
|
|
|
|
*/
|
2011-08-13 22:31:47 +02:00
|
|
|
static int rcu_print_task_stall(struct rcu_node *rnp)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
2011-08-13 22:31:47 +02:00
|
|
|
return 0;
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
}
|
|
|
|
|
2010-08-10 23:28:53 +02:00
|
|
|
/*
|
|
|
|
* Because preemptible RCU does not exist, there is no need to suppress
|
|
|
|
* its CPU stall warnings.
|
|
|
|
*/
|
|
|
|
static void rcu_preempt_stall_reset(void)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2009-09-13 18:15:09 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because there is no preemptible RCU, there can be no readers blocked,
|
2009-09-18 18:50:19 +02:00
|
|
|
* so there is no need to check for blocked tasks. So check only for
|
|
|
|
* bogus qsmask values.
|
2009-09-13 18:15:09 +02:00
|
|
|
*/
|
|
|
|
static void rcu_preempt_check_blocked_tasks(struct rcu_node *rnp)
|
|
|
|
{
|
2009-09-18 18:50:19 +02:00
|
|
|
WARN_ON_ONCE(rnp->qsmask);
|
2009-09-13 18:15:09 +02:00
|
|
|
}
|
|
|
|
|
2009-08-24 18:42:01 +02:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
2009-08-27 23:58:16 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never needs to migrate
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
* tasks that were blocked within RCU read-side critical sections, and
|
|
|
|
* such non-existent tasks cannot possibly have been blocking the current
|
|
|
|
* grace period.
|
2009-08-27 23:58:16 +02:00
|
|
|
*/
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
static int rcu_preempt_offline_tasks(struct rcu_state *rsp,
|
|
|
|
struct rcu_node *rnp,
|
|
|
|
struct rcu_data *rdp)
|
2009-08-27 23:58:16 +02:00
|
|
|
{
|
rcu: Fix TREE_PREEMPT_RCU CPU_HOTPLUG bad-luck hang
If the following sequence of events occurs, then
TREE_PREEMPT_RCU will hang waiting for a grace period to
complete, eventually OOMing the system:
o A TREE_PREEMPT_RCU build of the kernel is booted on a system
with more than 64 physical CPUs present (32 on a 32-bit system).
Alternatively, a TREE_PREEMPT_RCU build of the kernel is booted
with RCU_FANOUT set to a sufficiently small value that the
physical CPUs populate two or more leaf rcu_node structures.
o A task is preempted in an RCU read-side critical section
while running on a CPU corresponding to a given leaf rcu_node
structure.
o All CPUs corresponding to this same leaf rcu_node structure
record quiescent states for the current grace period.
o All of these same CPUs go offline (hence the need for enough
physical CPUs to populate more than one leaf rcu_node structure).
This causes the preempted task to be moved to the root rcu_node
structure.
At this point, there is nothing left to cause the quiescent
state to be propagated up the rcu_node tree, so the current
grace period never completes.
The simplest fix, especially after considering the deadlock
possibilities, is to detect this situation when the last CPU is
offlined, and to set that CPU's ->qsmask bit in its leaf
rcu_node structure. This will cause the next invocation of
force_quiescent_state() to end the grace period.
Without this fix, this hang can be triggered in an hour or so on
some machines with rcutorture and random CPU onlining/offlining.
With this fix, these same machines pass a full 10 hours of this
sort of abuse.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: mathieu.desnoyers@polymtl.ca
Cc: josh@joshtriplett.org
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
Cc: Valdis.Kletnieks@vt.edu
Cc: dhowells@redhat.com
LKML-Reference: <20091015162614.GA19131@linux.vnet.ibm.com>
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-10-15 18:26:14 +02:00
|
|
|
return 0;
|
2009-08-27 23:58:16 +02:00
|
|
|
}
|
|
|
|
|
2009-08-24 18:42:01 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never needs CPU-offline
|
2009-08-24 18:42:01 +02:00
|
|
|
* processing.
|
|
|
|
*/
|
|
|
|
static void rcu_preempt_offline_cpu(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never has any callbacks
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* to check.
|
|
|
|
*/
|
2009-09-23 18:50:42 +02:00
|
|
|
static void rcu_preempt_check_callbacks(int cpu)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never has any callbacks
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* to process.
|
|
|
|
*/
|
2009-09-23 18:50:42 +02:00
|
|
|
static void rcu_preempt_process_callbacks(void)
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2009-10-14 19:15:56 +02:00
|
|
|
/*
|
|
|
|
* Wait for an rcu-preempt grace period, but make it happen quickly.
|
2011-03-02 22:15:15 +01:00
|
|
|
* But because preemptible RCU does not exist, map to rcu-sched.
|
2009-10-14 19:15:56 +02:00
|
|
|
*/
|
|
|
|
void synchronize_rcu_expedited(void)
|
|
|
|
{
|
|
|
|
synchronize_sched_expedited();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(synchronize_rcu_expedited);
|
|
|
|
|
2009-12-02 21:10:15 +01:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, there is never any need to
|
2009-12-02 21:10:15 +01:00
|
|
|
* report on tasks preempted in RCU read-side critical sections during
|
|
|
|
* expedited RCU grace periods.
|
|
|
|
*/
|
2011-10-22 16:12:34 +02:00
|
|
|
static void rcu_report_exp_rnp(struct rcu_state *rsp, struct rcu_node *rnp,
|
|
|
|
bool wake)
|
2009-12-02 21:10:15 +01:00
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never has any work to do.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
static int rcu_preempt_pending(int cpu)
|
|
|
|
{
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it never needs any CPU.
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
*/
|
|
|
|
static int rcu_preempt_needs_cpu(int cpu)
|
|
|
|
{
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2009-10-07 06:48:17 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, rcu_barrier() is just
|
2009-10-07 06:48:17 +02:00
|
|
|
* another name for rcu_barrier_sched().
|
|
|
|
*/
|
|
|
|
void rcu_barrier(void)
|
|
|
|
{
|
|
|
|
rcu_barrier_sched();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(rcu_barrier);
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, there is no per-CPU
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
* data to initialize.
|
|
|
|
*/
|
|
|
|
static void __cpuinit rcu_preempt_init_percpu_data(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2009-10-07 06:48:17 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because there is no preemptible RCU, there are no callbacks to move.
|
2009-10-07 06:48:17 +02:00
|
|
|
*/
|
2010-10-20 08:13:06 +02:00
|
|
|
static void rcu_preempt_send_cbs_to_online(void)
|
2009-10-07 06:48:17 +02:00
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2009-09-23 18:50:42 +02:00
|
|
|
/*
|
2011-03-02 22:15:15 +01:00
|
|
|
* Because preemptible RCU does not exist, it need not be initialized.
|
2009-09-23 18:50:42 +02:00
|
|
|
*/
|
|
|
|
static void __init __rcu_init_preempt(void)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
rcu: Merge preemptable-RCU functionality into hierarchical RCU
Create a kernel/rcutree_plugin.h file that contains definitions
for preemptable RCU (or, under the #else branch of the #ifdef,
empty definitions for the classic non-preemptable semantics).
These definitions fit into plugins defined in kernel/rcutree.c
for this purpose.
This variant of preemptable RCU uses a new algorithm whose
read-side expense is roughly that of classic hierarchical RCU
under CONFIG_PREEMPT. This new algorithm's update-side expense
is similar to that of classic hierarchical RCU, and, in absence
of read-side preemption or blocking, is exactly that of classic
hierarchical RCU. Perhaps more important, this new algorithm
has a much simpler implementation, saving well over 1,000 lines
of code compared to mainline's implementation of preemptable
RCU, which will hopefully be retired in favor of this new
algorithm.
The simplifications are obtained by maintaining per-task
nesting state for running tasks, and using a simple
lock-protected algorithm to handle accounting when tasks block
within RCU read-side critical sections, making use of lessons
learned while creating numerous user-level RCU implementations
over the past 18 months.
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
Cc: laijs@cn.fujitsu.com
Cc: dipankar@in.ibm.com
Cc: akpm@linux-foundation.org
Cc: mathieu.desnoyers@polymtl.ca
Cc: josht@linux.vnet.ibm.com
Cc: dvhltc@us.ibm.com
Cc: niv@us.ibm.com
Cc: peterz@infradead.org
Cc: rostedt@goodmis.org
LKML-Reference: <12509746134003-git-send-email->
Signed-off-by: Ingo Molnar <mingo@elte.hu>
2009-08-22 22:56:52 +02:00
|
|
|
#endif /* #else #ifdef CONFIG_TREE_PREEMPT_RCU */
|
2010-02-23 02:04:59 +01:00
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
#ifdef CONFIG_RCU_BOOST
|
|
|
|
|
|
|
|
#include "rtmutex_common.h"
|
|
|
|
|
2011-02-22 22:42:43 +01:00
|
|
|
#ifdef CONFIG_RCU_TRACE
|
|
|
|
|
|
|
|
static void rcu_initiate_boost_trace(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
if (list_empty(&rnp->blkd_tasks))
|
|
|
|
rnp->n_balk_blkd_tasks++;
|
|
|
|
else if (rnp->exp_tasks == NULL && rnp->gp_tasks == NULL)
|
|
|
|
rnp->n_balk_exp_gp_tasks++;
|
|
|
|
else if (rnp->gp_tasks != NULL && rnp->boost_tasks != NULL)
|
|
|
|
rnp->n_balk_boost_tasks++;
|
|
|
|
else if (rnp->gp_tasks != NULL && rnp->qsmask != 0)
|
|
|
|
rnp->n_balk_notblocked++;
|
|
|
|
else if (rnp->gp_tasks != NULL &&
|
2011-05-02 12:46:10 +02:00
|
|
|
ULONG_CMP_LT(jiffies, rnp->boost_time))
|
2011-02-22 22:42:43 +01:00
|
|
|
rnp->n_balk_notyet++;
|
|
|
|
else
|
|
|
|
rnp->n_balk_nos++;
|
|
|
|
}
|
|
|
|
|
|
|
|
#else /* #ifdef CONFIG_RCU_TRACE */
|
|
|
|
|
|
|
|
static void rcu_initiate_boost_trace(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #else #ifdef CONFIG_RCU_TRACE */
|
|
|
|
|
2011-08-17 02:46:46 +02:00
|
|
|
static struct lock_class_key rcu_boost_class;
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
/*
|
|
|
|
* Carry out RCU priority boosting on the task indicated by ->exp_tasks
|
|
|
|
* or ->boost_tasks, advancing the pointer to the next task in the
|
|
|
|
* ->blkd_tasks list.
|
|
|
|
*
|
|
|
|
* Note that irqs must be enabled: boosting the task can block.
|
|
|
|
* Returns 1 if there are more tasks needing to be boosted.
|
|
|
|
*/
|
|
|
|
static int rcu_boost(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
struct rt_mutex mtx;
|
|
|
|
struct task_struct *t;
|
|
|
|
struct list_head *tb;
|
|
|
|
|
|
|
|
if (rnp->exp_tasks == NULL && rnp->boost_tasks == NULL)
|
|
|
|
return 0; /* Nothing left to boost. */
|
|
|
|
|
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Recheck under the lock: all tasks in need of boosting
|
|
|
|
* might exit their RCU read-side critical sections on their own.
|
|
|
|
*/
|
|
|
|
if (rnp->exp_tasks == NULL && rnp->boost_tasks == NULL) {
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Preferentially boost tasks blocking expedited grace periods.
|
|
|
|
* This cannot starve the normal grace periods because a second
|
|
|
|
* expedited grace period must boost all blocked tasks, including
|
|
|
|
* those blocking the pre-existing normal grace period.
|
|
|
|
*/
|
2011-02-22 22:42:43 +01:00
|
|
|
if (rnp->exp_tasks != NULL) {
|
2011-02-07 21:47:15 +01:00
|
|
|
tb = rnp->exp_tasks;
|
2011-02-22 22:42:43 +01:00
|
|
|
rnp->n_exp_boosts++;
|
|
|
|
} else {
|
2011-02-07 21:47:15 +01:00
|
|
|
tb = rnp->boost_tasks;
|
2011-02-22 22:42:43 +01:00
|
|
|
rnp->n_normal_boosts++;
|
|
|
|
}
|
|
|
|
rnp->n_tasks_boosted++;
|
2011-02-07 21:47:15 +01:00
|
|
|
|
|
|
|
/*
|
|
|
|
* We boost task t by manufacturing an rt_mutex that appears to
|
|
|
|
* be held by task t. We leave a pointer to that rt_mutex where
|
|
|
|
* task t can find it, and task t will release the mutex when it
|
|
|
|
* exits its outermost RCU read-side critical section. Then
|
|
|
|
* simply acquiring this artificial rt_mutex will boost task
|
|
|
|
* t's priority. (Thanks to tglx for suggesting this approach!)
|
|
|
|
*
|
|
|
|
* Note that task t must acquire rnp->lock to remove itself from
|
|
|
|
* the ->blkd_tasks list, which it will do from exit() if from
|
|
|
|
* nowhere else. We therefore are guaranteed that task t will
|
|
|
|
* stay around at least until we drop rnp->lock. Note that
|
|
|
|
* rnp->lock also resolves races between our priority boosting
|
|
|
|
* and task t's exiting its outermost RCU read-side critical
|
|
|
|
* section.
|
|
|
|
*/
|
|
|
|
t = container_of(tb, struct task_struct, rcu_node_entry);
|
|
|
|
rt_mutex_init_proxy_locked(&mtx, t);
|
2011-08-17 02:46:46 +02:00
|
|
|
/* Avoid lockdep false positives. This rt_mutex is its own thing. */
|
|
|
|
lockdep_set_class_and_name(&mtx.wait_lock, &rcu_boost_class,
|
|
|
|
"rcu_boost_mutex");
|
2011-02-07 21:47:15 +01:00
|
|
|
t->rcu_boost_mutex = &mtx;
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
|
|
|
rt_mutex_lock(&mtx); /* Side effect: boosts task t's priority. */
|
|
|
|
rt_mutex_unlock(&mtx); /* Keep lockdep happy. */
|
|
|
|
|
|
|
|
return rnp->exp_tasks != NULL || rnp->boost_tasks != NULL;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Timer handler to initiate waking up of boost kthreads that
|
|
|
|
* have yielded the CPU due to excessive numbers of tasks to
|
|
|
|
* boost. We wake up the per-rcu_node kthread, which in turn
|
|
|
|
* will wake up the booster kthread.
|
|
|
|
*/
|
|
|
|
static void rcu_boost_kthread_timer(unsigned long arg)
|
|
|
|
{
|
2011-05-05 06:43:49 +02:00
|
|
|
invoke_rcu_node_kthread((struct rcu_node *)arg);
|
2011-02-07 21:47:15 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Priority-boosting kthread. One per leaf rcu_node and one for the
|
|
|
|
* root rcu_node.
|
|
|
|
*/
|
|
|
|
static int rcu_boost_kthread(void *arg)
|
|
|
|
{
|
|
|
|
struct rcu_node *rnp = (struct rcu_node *)arg;
|
|
|
|
int spincnt = 0;
|
|
|
|
int more2boost;
|
|
|
|
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start boost kthread@init");
|
2011-02-07 21:47:15 +01:00
|
|
|
for (;;) {
|
2011-03-30 02:48:28 +02:00
|
|
|
rnp->boost_kthread_status = RCU_KTHREAD_WAITING;
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End boost kthread@rcu_wait");
|
2011-05-21 01:06:29 +02:00
|
|
|
rcu_wait(rnp->boost_tasks || rnp->exp_tasks);
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start boost kthread@rcu_wait");
|
2011-03-30 02:48:28 +02:00
|
|
|
rnp->boost_kthread_status = RCU_KTHREAD_RUNNING;
|
2011-02-07 21:47:15 +01:00
|
|
|
more2boost = rcu_boost(rnp);
|
|
|
|
if (more2boost)
|
|
|
|
spincnt++;
|
|
|
|
else
|
|
|
|
spincnt = 0;
|
|
|
|
if (spincnt > 10) {
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End boost kthread@rcu_yield");
|
2011-02-07 21:47:15 +01:00
|
|
|
rcu_yield(rcu_boost_kthread_timer, (unsigned long)rnp);
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start boost kthread@rcu_yield");
|
2011-02-07 21:47:15 +01:00
|
|
|
spincnt = 0;
|
|
|
|
}
|
|
|
|
}
|
2011-05-05 06:43:49 +02:00
|
|
|
/* NOTREACHED */
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End boost kthread@notreached");
|
2011-02-07 21:47:15 +01:00
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Check to see if it is time to start boosting RCU readers that are
|
|
|
|
* blocking the current grace period, and, if so, tell the per-rcu_node
|
|
|
|
* kthread to start boosting them. If there is an expedited grace
|
|
|
|
* period in progress, it is always time to boost.
|
|
|
|
*
|
2011-05-05 06:43:49 +02:00
|
|
|
* The caller must hold rnp->lock, which this function releases,
|
|
|
|
* but irqs remain disabled. The ->boost_kthread_task is immortal,
|
|
|
|
* so we don't need to worry about it going away.
|
2011-02-07 21:47:15 +01:00
|
|
|
*/
|
2011-05-05 06:43:49 +02:00
|
|
|
static void rcu_initiate_boost(struct rcu_node *rnp, unsigned long flags)
|
2011-02-07 21:47:15 +01:00
|
|
|
{
|
|
|
|
struct task_struct *t;
|
|
|
|
|
2011-02-22 22:42:43 +01:00
|
|
|
if (!rcu_preempt_blocked_readers_cgp(rnp) && rnp->exp_tasks == NULL) {
|
|
|
|
rnp->n_balk_exp_gp_tasks++;
|
2011-05-05 06:43:49 +02:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2011-02-07 21:47:15 +01:00
|
|
|
return;
|
2011-02-22 22:42:43 +01:00
|
|
|
}
|
2011-02-07 21:47:15 +01:00
|
|
|
if (rnp->exp_tasks != NULL ||
|
|
|
|
(rnp->gp_tasks != NULL &&
|
|
|
|
rnp->boost_tasks == NULL &&
|
|
|
|
rnp->qsmask == 0 &&
|
|
|
|
ULONG_CMP_GE(jiffies, rnp->boost_time))) {
|
|
|
|
if (rnp->exp_tasks == NULL)
|
|
|
|
rnp->boost_tasks = rnp->gp_tasks;
|
2011-05-05 06:43:49 +02:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2011-02-07 21:47:15 +01:00
|
|
|
t = rnp->boost_kthread_task;
|
|
|
|
if (t != NULL)
|
|
|
|
wake_up_process(t);
|
2011-05-05 06:43:49 +02:00
|
|
|
} else {
|
2011-02-22 22:42:43 +01:00
|
|
|
rcu_initiate_boost_trace(rnp);
|
2011-05-05 06:43:49 +02:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
|
|
|
}
|
2011-02-07 21:47:15 +01:00
|
|
|
}
|
|
|
|
|
2011-06-16 00:47:09 +02:00
|
|
|
/*
|
|
|
|
* Wake up the per-CPU kthread to invoke RCU callbacks.
|
|
|
|
*/
|
|
|
|
static void invoke_rcu_callbacks_kthread(void)
|
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
|
|
|
|
local_irq_save(flags);
|
|
|
|
__this_cpu_write(rcu_cpu_has_work, 1);
|
2011-06-17 01:02:54 +02:00
|
|
|
if (__this_cpu_read(rcu_cpu_kthread_task) != NULL &&
|
|
|
|
current != __this_cpu_read(rcu_cpu_kthread_task))
|
|
|
|
wake_up_process(__this_cpu_read(rcu_cpu_kthread_task));
|
2011-06-16 00:47:09 +02:00
|
|
|
local_irq_restore(flags);
|
|
|
|
}
|
|
|
|
|
2011-04-14 21:13:53 +02:00
|
|
|
/*
|
|
|
|
* Set the affinity of the boost kthread. The CPU-hotplug locks are
|
|
|
|
* held, so no one should be messing with the existence of the boost
|
|
|
|
* kthread.
|
|
|
|
*/
|
2011-02-07 21:47:15 +01:00
|
|
|
static void rcu_boost_kthread_setaffinity(struct rcu_node *rnp,
|
|
|
|
cpumask_var_t cm)
|
|
|
|
{
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
t = rnp->boost_kthread_task;
|
|
|
|
if (t != NULL)
|
|
|
|
set_cpus_allowed_ptr(rnp->boost_kthread_task, cm);
|
|
|
|
}
|
|
|
|
|
|
|
|
#define RCU_BOOST_DELAY_JIFFIES DIV_ROUND_UP(CONFIG_RCU_BOOST_DELAY * HZ, 1000)
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Do priority-boost accounting for the start of a new grace period.
|
|
|
|
*/
|
|
|
|
static void rcu_preempt_boost_start_gp(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
rnp->boost_time = jiffies + RCU_BOOST_DELAY_JIFFIES;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Create an RCU-boost kthread for the specified node if one does not
|
|
|
|
* already exist. We only create this kthread for preemptible RCU.
|
|
|
|
* Returns zero if all is well, a negated errno otherwise.
|
|
|
|
*/
|
|
|
|
static int __cpuinit rcu_spawn_one_boost_kthread(struct rcu_state *rsp,
|
|
|
|
struct rcu_node *rnp,
|
|
|
|
int rnp_index)
|
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
struct sched_param sp;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
if (&rcu_preempt_state != rsp)
|
|
|
|
return 0;
|
2011-06-16 00:47:09 +02:00
|
|
|
rsp->boost = 1;
|
2011-02-07 21:47:15 +01:00
|
|
|
if (rnp->boost_kthread_task != NULL)
|
|
|
|
return 0;
|
|
|
|
t = kthread_create(rcu_boost_kthread, (void *)rnp,
|
2011-08-19 20:39:11 +02:00
|
|
|
"rcub/%d", rnp_index);
|
2011-02-07 21:47:15 +01:00
|
|
|
if (IS_ERR(t))
|
|
|
|
return PTR_ERR(t);
|
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
rnp->boost_kthread_task = t;
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2011-08-19 20:39:11 +02:00
|
|
|
sp.sched_priority = RCU_BOOST_PRIO;
|
2011-02-07 21:47:15 +01:00
|
|
|
sched_setscheduler_nocheck(t, SCHED_FIFO, &sp);
|
2011-05-31 05:38:55 +02:00
|
|
|
wake_up_process(t); /* get to TASK_INTERRUPTIBLE quickly. */
|
2011-02-07 21:47:15 +01:00
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2011-06-16 17:26:32 +02:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Stop the RCU's per-CPU kthread when its CPU goes offline,.
|
|
|
|
*/
|
|
|
|
static void rcu_stop_cpu_kthread(int cpu)
|
|
|
|
{
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
/* Stop the CPU's kthread. */
|
|
|
|
t = per_cpu(rcu_cpu_kthread_task, cpu);
|
|
|
|
if (t != NULL) {
|
|
|
|
per_cpu(rcu_cpu_kthread_task, cpu) = NULL;
|
|
|
|
kthread_stop(t);
|
|
|
|
}
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
|
|
|
static void rcu_kthread_do_work(void)
|
|
|
|
{
|
|
|
|
rcu_do_batch(&rcu_sched_state, &__get_cpu_var(rcu_sched_data));
|
|
|
|
rcu_do_batch(&rcu_bh_state, &__get_cpu_var(rcu_bh_data));
|
|
|
|
rcu_preempt_do_callbacks();
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Wake up the specified per-rcu_node-structure kthread.
|
|
|
|
* Because the per-rcu_node kthreads are immortal, we don't need
|
|
|
|
* to do anything to keep them alive.
|
|
|
|
*/
|
|
|
|
static void invoke_rcu_node_kthread(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
t = rnp->node_kthread_task;
|
|
|
|
if (t != NULL)
|
|
|
|
wake_up_process(t);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Set the specified CPU's kthread to run RT or not, as specified by
|
|
|
|
* the to_rt argument. The CPU-hotplug locks are held, so the task
|
|
|
|
* is not going away.
|
|
|
|
*/
|
|
|
|
static void rcu_cpu_kthread_setrt(int cpu, int to_rt)
|
|
|
|
{
|
|
|
|
int policy;
|
|
|
|
struct sched_param sp;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
t = per_cpu(rcu_cpu_kthread_task, cpu);
|
|
|
|
if (t == NULL)
|
|
|
|
return;
|
|
|
|
if (to_rt) {
|
|
|
|
policy = SCHED_FIFO;
|
|
|
|
sp.sched_priority = RCU_KTHREAD_PRIO;
|
|
|
|
} else {
|
|
|
|
policy = SCHED_NORMAL;
|
|
|
|
sp.sched_priority = 0;
|
|
|
|
}
|
|
|
|
sched_setscheduler_nocheck(t, policy, &sp);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Timer handler to initiate the waking up of per-CPU kthreads that
|
|
|
|
* have yielded the CPU due to excess numbers of RCU callbacks.
|
|
|
|
* We wake up the per-rcu_node kthread, which in turn will wake up
|
|
|
|
* the booster kthread.
|
|
|
|
*/
|
|
|
|
static void rcu_cpu_kthread_timer(unsigned long arg)
|
|
|
|
{
|
|
|
|
struct rcu_data *rdp = per_cpu_ptr(rcu_state->rda, arg);
|
|
|
|
struct rcu_node *rnp = rdp->mynode;
|
|
|
|
|
|
|
|
atomic_or(rdp->grpmask, &rnp->wakemask);
|
|
|
|
invoke_rcu_node_kthread(rnp);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Drop to non-real-time priority and yield, but only after posting a
|
|
|
|
* timer that will cause us to regain our real-time priority if we
|
|
|
|
* remain preempted. Either way, we restore our real-time priority
|
|
|
|
* before returning.
|
|
|
|
*/
|
|
|
|
static void rcu_yield(void (*f)(unsigned long), unsigned long arg)
|
|
|
|
{
|
|
|
|
struct sched_param sp;
|
|
|
|
struct timer_list yield_timer;
|
2011-08-19 20:39:11 +02:00
|
|
|
int prio = current->rt_priority;
|
2011-06-16 17:26:32 +02:00
|
|
|
|
|
|
|
setup_timer_on_stack(&yield_timer, f, arg);
|
|
|
|
mod_timer(&yield_timer, jiffies + 2);
|
|
|
|
sp.sched_priority = 0;
|
|
|
|
sched_setscheduler_nocheck(current, SCHED_NORMAL, &sp);
|
|
|
|
set_user_nice(current, 19);
|
|
|
|
schedule();
|
2011-08-19 20:39:11 +02:00
|
|
|
set_user_nice(current, 0);
|
|
|
|
sp.sched_priority = prio;
|
2011-06-16 17:26:32 +02:00
|
|
|
sched_setscheduler_nocheck(current, SCHED_FIFO, &sp);
|
|
|
|
del_timer(&yield_timer);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Handle cases where the rcu_cpu_kthread() ends up on the wrong CPU.
|
|
|
|
* This can happen while the corresponding CPU is either coming online
|
|
|
|
* or going offline. We cannot wait until the CPU is fully online
|
|
|
|
* before starting the kthread, because the various notifier functions
|
|
|
|
* can wait for RCU grace periods. So we park rcu_cpu_kthread() until
|
|
|
|
* the corresponding CPU is online.
|
|
|
|
*
|
|
|
|
* Return 1 if the kthread needs to stop, 0 otherwise.
|
|
|
|
*
|
|
|
|
* Caller must disable bh. This function can momentarily enable it.
|
|
|
|
*/
|
|
|
|
static int rcu_cpu_kthread_should_stop(int cpu)
|
|
|
|
{
|
|
|
|
while (cpu_is_offline(cpu) ||
|
|
|
|
!cpumask_equal(¤t->cpus_allowed, cpumask_of(cpu)) ||
|
|
|
|
smp_processor_id() != cpu) {
|
|
|
|
if (kthread_should_stop())
|
|
|
|
return 1;
|
|
|
|
per_cpu(rcu_cpu_kthread_status, cpu) = RCU_KTHREAD_OFFCPU;
|
|
|
|
per_cpu(rcu_cpu_kthread_cpu, cpu) = raw_smp_processor_id();
|
|
|
|
local_bh_enable();
|
|
|
|
schedule_timeout_uninterruptible(1);
|
|
|
|
if (!cpumask_equal(¤t->cpus_allowed, cpumask_of(cpu)))
|
|
|
|
set_cpus_allowed_ptr(current, cpumask_of(cpu));
|
|
|
|
local_bh_disable();
|
|
|
|
}
|
|
|
|
per_cpu(rcu_cpu_kthread_cpu, cpu) = cpu;
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Per-CPU kernel thread that invokes RCU callbacks. This replaces the
|
2011-06-21 10:29:39 +02:00
|
|
|
* RCU softirq used in flavors and configurations of RCU that do not
|
|
|
|
* support RCU priority boosting.
|
2011-06-16 17:26:32 +02:00
|
|
|
*/
|
|
|
|
static int rcu_cpu_kthread(void *arg)
|
|
|
|
{
|
|
|
|
int cpu = (int)(long)arg;
|
|
|
|
unsigned long flags;
|
|
|
|
int spincnt = 0;
|
|
|
|
unsigned int *statusp = &per_cpu(rcu_cpu_kthread_status, cpu);
|
|
|
|
char work;
|
|
|
|
char *workp = &per_cpu(rcu_cpu_has_work, cpu);
|
|
|
|
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start CPU kthread@init");
|
2011-06-16 17:26:32 +02:00
|
|
|
for (;;) {
|
|
|
|
*statusp = RCU_KTHREAD_WAITING;
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End CPU kthread@rcu_wait");
|
2011-06-16 17:26:32 +02:00
|
|
|
rcu_wait(*workp != 0 || kthread_should_stop());
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start CPU kthread@rcu_wait");
|
2011-06-16 17:26:32 +02:00
|
|
|
local_bh_disable();
|
|
|
|
if (rcu_cpu_kthread_should_stop(cpu)) {
|
|
|
|
local_bh_enable();
|
|
|
|
break;
|
|
|
|
}
|
|
|
|
*statusp = RCU_KTHREAD_RUNNING;
|
|
|
|
per_cpu(rcu_cpu_kthread_loops, cpu)++;
|
|
|
|
local_irq_save(flags);
|
|
|
|
work = *workp;
|
|
|
|
*workp = 0;
|
|
|
|
local_irq_restore(flags);
|
|
|
|
if (work)
|
|
|
|
rcu_kthread_do_work();
|
|
|
|
local_bh_enable();
|
|
|
|
if (*workp != 0)
|
|
|
|
spincnt++;
|
|
|
|
else
|
|
|
|
spincnt = 0;
|
|
|
|
if (spincnt > 10) {
|
|
|
|
*statusp = RCU_KTHREAD_YIELDING;
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End CPU kthread@rcu_yield");
|
2011-06-16 17:26:32 +02:00
|
|
|
rcu_yield(rcu_cpu_kthread_timer, (unsigned long)cpu);
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("Start CPU kthread@rcu_yield");
|
2011-06-16 17:26:32 +02:00
|
|
|
spincnt = 0;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
*statusp = RCU_KTHREAD_STOPPED;
|
2011-06-22 07:43:26 +02:00
|
|
|
trace_rcu_utilization("End CPU kthread@term");
|
2011-06-16 17:26:32 +02:00
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Spawn a per-CPU kthread, setting up affinity and priority.
|
|
|
|
* Because the CPU hotplug lock is held, no other CPU will be attempting
|
|
|
|
* to manipulate rcu_cpu_kthread_task. There might be another CPU
|
|
|
|
* attempting to access it during boot, but the locking in kthread_bind()
|
|
|
|
* will enforce sufficient ordering.
|
|
|
|
*
|
|
|
|
* Please note that we cannot simply refuse to wake up the per-CPU
|
|
|
|
* kthread because kthreads are created in TASK_UNINTERRUPTIBLE state,
|
|
|
|
* which can result in softlockup complaints if the task ends up being
|
|
|
|
* idle for more than a couple of minutes.
|
|
|
|
*
|
|
|
|
* However, please note also that we cannot bind the per-CPU kthread to its
|
|
|
|
* CPU until that CPU is fully online. We also cannot wait until the
|
|
|
|
* CPU is fully online before we create its per-CPU kthread, as this would
|
|
|
|
* deadlock the system when CPU notifiers tried waiting for grace
|
|
|
|
* periods. So we bind the per-CPU kthread to its CPU only if the CPU
|
|
|
|
* is online. If its CPU is not yet fully online, then the code in
|
|
|
|
* rcu_cpu_kthread() will wait until it is fully online, and then do
|
|
|
|
* the binding.
|
|
|
|
*/
|
|
|
|
static int __cpuinit rcu_spawn_one_cpu_kthread(int cpu)
|
|
|
|
{
|
|
|
|
struct sched_param sp;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
2011-07-11 00:57:35 +02:00
|
|
|
if (!rcu_scheduler_fully_active ||
|
2011-06-16 17:26:32 +02:00
|
|
|
per_cpu(rcu_cpu_kthread_task, cpu) != NULL)
|
|
|
|
return 0;
|
2011-06-17 00:53:18 +02:00
|
|
|
t = kthread_create_on_node(rcu_cpu_kthread,
|
|
|
|
(void *)(long)cpu,
|
|
|
|
cpu_to_node(cpu),
|
2011-08-19 20:39:11 +02:00
|
|
|
"rcuc/%d", cpu);
|
2011-06-16 17:26:32 +02:00
|
|
|
if (IS_ERR(t))
|
|
|
|
return PTR_ERR(t);
|
|
|
|
if (cpu_online(cpu))
|
|
|
|
kthread_bind(t, cpu);
|
|
|
|
per_cpu(rcu_cpu_kthread_cpu, cpu) = cpu;
|
|
|
|
WARN_ON_ONCE(per_cpu(rcu_cpu_kthread_task, cpu) != NULL);
|
|
|
|
sp.sched_priority = RCU_KTHREAD_PRIO;
|
|
|
|
sched_setscheduler_nocheck(t, SCHED_FIFO, &sp);
|
|
|
|
per_cpu(rcu_cpu_kthread_task, cpu) = t;
|
|
|
|
wake_up_process(t); /* Get to TASK_INTERRUPTIBLE quickly. */
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Per-rcu_node kthread, which is in charge of waking up the per-CPU
|
|
|
|
* kthreads when needed. We ignore requests to wake up kthreads
|
|
|
|
* for offline CPUs, which is OK because force_quiescent_state()
|
|
|
|
* takes care of this case.
|
|
|
|
*/
|
|
|
|
static int rcu_node_kthread(void *arg)
|
|
|
|
{
|
|
|
|
int cpu;
|
|
|
|
unsigned long flags;
|
|
|
|
unsigned long mask;
|
|
|
|
struct rcu_node *rnp = (struct rcu_node *)arg;
|
|
|
|
struct sched_param sp;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
|
|
|
for (;;) {
|
|
|
|
rnp->node_kthread_status = RCU_KTHREAD_WAITING;
|
|
|
|
rcu_wait(atomic_read(&rnp->wakemask) != 0);
|
|
|
|
rnp->node_kthread_status = RCU_KTHREAD_RUNNING;
|
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
mask = atomic_xchg(&rnp->wakemask, 0);
|
|
|
|
rcu_initiate_boost(rnp, flags); /* releases rnp->lock. */
|
|
|
|
for (cpu = rnp->grplo; cpu <= rnp->grphi; cpu++, mask >>= 1) {
|
|
|
|
if ((mask & 0x1) == 0)
|
|
|
|
continue;
|
|
|
|
preempt_disable();
|
|
|
|
t = per_cpu(rcu_cpu_kthread_task, cpu);
|
|
|
|
if (!cpu_online(cpu) || t == NULL) {
|
|
|
|
preempt_enable();
|
|
|
|
continue;
|
|
|
|
}
|
|
|
|
per_cpu(rcu_cpu_has_work, cpu) = 1;
|
|
|
|
sp.sched_priority = RCU_KTHREAD_PRIO;
|
|
|
|
sched_setscheduler_nocheck(t, SCHED_FIFO, &sp);
|
|
|
|
preempt_enable();
|
|
|
|
}
|
|
|
|
}
|
|
|
|
/* NOTREACHED */
|
|
|
|
rnp->node_kthread_status = RCU_KTHREAD_STOPPED;
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Set the per-rcu_node kthread's affinity to cover all CPUs that are
|
|
|
|
* served by the rcu_node in question. The CPU hotplug lock is still
|
|
|
|
* held, so the value of rnp->qsmaskinit will be stable.
|
|
|
|
*
|
|
|
|
* We don't include outgoingcpu in the affinity set, use -1 if there is
|
|
|
|
* no outgoing CPU. If there are no CPUs left in the affinity set,
|
|
|
|
* this function allows the kthread to execute on any CPU.
|
|
|
|
*/
|
|
|
|
static void rcu_node_kthread_setaffinity(struct rcu_node *rnp, int outgoingcpu)
|
|
|
|
{
|
|
|
|
cpumask_var_t cm;
|
|
|
|
int cpu;
|
|
|
|
unsigned long mask = rnp->qsmaskinit;
|
|
|
|
|
|
|
|
if (rnp->node_kthread_task == NULL)
|
|
|
|
return;
|
|
|
|
if (!alloc_cpumask_var(&cm, GFP_KERNEL))
|
|
|
|
return;
|
|
|
|
cpumask_clear(cm);
|
|
|
|
for (cpu = rnp->grplo; cpu <= rnp->grphi; cpu++, mask >>= 1)
|
|
|
|
if ((mask & 0x1) && cpu != outgoingcpu)
|
|
|
|
cpumask_set_cpu(cpu, cm);
|
|
|
|
if (cpumask_weight(cm) == 0) {
|
|
|
|
cpumask_setall(cm);
|
|
|
|
for (cpu = rnp->grplo; cpu <= rnp->grphi; cpu++)
|
|
|
|
cpumask_clear_cpu(cpu, cm);
|
|
|
|
WARN_ON_ONCE(cpumask_weight(cm) == 0);
|
|
|
|
}
|
|
|
|
set_cpus_allowed_ptr(rnp->node_kthread_task, cm);
|
|
|
|
rcu_boost_kthread_setaffinity(rnp, cm);
|
|
|
|
free_cpumask_var(cm);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Spawn a per-rcu_node kthread, setting priority and affinity.
|
|
|
|
* Called during boot before online/offline can happen, or, if
|
|
|
|
* during runtime, with the main CPU-hotplug locks held. So only
|
|
|
|
* one of these can be executing at a time.
|
|
|
|
*/
|
|
|
|
static int __cpuinit rcu_spawn_one_node_kthread(struct rcu_state *rsp,
|
|
|
|
struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
unsigned long flags;
|
|
|
|
int rnp_index = rnp - &rsp->node[0];
|
|
|
|
struct sched_param sp;
|
|
|
|
struct task_struct *t;
|
|
|
|
|
2011-07-11 00:57:35 +02:00
|
|
|
if (!rcu_scheduler_fully_active ||
|
2011-06-16 17:26:32 +02:00
|
|
|
rnp->qsmaskinit == 0)
|
|
|
|
return 0;
|
|
|
|
if (rnp->node_kthread_task == NULL) {
|
|
|
|
t = kthread_create(rcu_node_kthread, (void *)rnp,
|
2011-08-19 20:39:11 +02:00
|
|
|
"rcun/%d", rnp_index);
|
2011-06-16 17:26:32 +02:00
|
|
|
if (IS_ERR(t))
|
|
|
|
return PTR_ERR(t);
|
|
|
|
raw_spin_lock_irqsave(&rnp->lock, flags);
|
|
|
|
rnp->node_kthread_task = t;
|
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
|
|
|
sp.sched_priority = 99;
|
|
|
|
sched_setscheduler_nocheck(t, SCHED_FIFO, &sp);
|
|
|
|
wake_up_process(t); /* get to TASK_INTERRUPTIBLE quickly. */
|
|
|
|
}
|
|
|
|
return rcu_spawn_one_boost_kthread(rsp, rnp, rnp_index);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Spawn all kthreads -- called as soon as the scheduler is running.
|
|
|
|
*/
|
|
|
|
static int __init rcu_spawn_kthreads(void)
|
|
|
|
{
|
|
|
|
int cpu;
|
|
|
|
struct rcu_node *rnp;
|
|
|
|
|
2011-07-11 00:57:35 +02:00
|
|
|
rcu_scheduler_fully_active = 1;
|
2011-06-16 17:26:32 +02:00
|
|
|
for_each_possible_cpu(cpu) {
|
|
|
|
per_cpu(rcu_cpu_has_work, cpu) = 0;
|
|
|
|
if (cpu_online(cpu))
|
|
|
|
(void)rcu_spawn_one_cpu_kthread(cpu);
|
|
|
|
}
|
|
|
|
rnp = rcu_get_root(rcu_state);
|
|
|
|
(void)rcu_spawn_one_node_kthread(rcu_state, rnp);
|
|
|
|
if (NUM_RCU_NODES > 1) {
|
|
|
|
rcu_for_each_leaf_node(rcu_state, rnp)
|
|
|
|
(void)rcu_spawn_one_node_kthread(rcu_state, rnp);
|
|
|
|
}
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
early_initcall(rcu_spawn_kthreads);
|
|
|
|
|
|
|
|
static void __cpuinit rcu_prepare_kthreads(int cpu)
|
|
|
|
{
|
|
|
|
struct rcu_data *rdp = per_cpu_ptr(rcu_state->rda, cpu);
|
|
|
|
struct rcu_node *rnp = rdp->mynode;
|
|
|
|
|
|
|
|
/* Fire up the incoming CPU's kthread and leaf rcu_node kthread. */
|
2011-07-11 00:57:35 +02:00
|
|
|
if (rcu_scheduler_fully_active) {
|
2011-06-16 17:26:32 +02:00
|
|
|
(void)rcu_spawn_one_cpu_kthread(cpu);
|
|
|
|
if (rnp->node_kthread_task == NULL)
|
|
|
|
(void)rcu_spawn_one_node_kthread(rcu_state, rnp);
|
|
|
|
}
|
|
|
|
}
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
#else /* #ifdef CONFIG_RCU_BOOST */
|
|
|
|
|
2011-05-05 06:43:49 +02:00
|
|
|
static void rcu_initiate_boost(struct rcu_node *rnp, unsigned long flags)
|
2011-02-07 21:47:15 +01:00
|
|
|
{
|
2011-05-05 06:43:49 +02:00
|
|
|
raw_spin_unlock_irqrestore(&rnp->lock, flags);
|
2011-02-07 21:47:15 +01:00
|
|
|
}
|
|
|
|
|
2011-06-16 00:47:09 +02:00
|
|
|
static void invoke_rcu_callbacks_kthread(void)
|
2011-02-07 21:47:15 +01:00
|
|
|
{
|
2011-06-16 00:47:09 +02:00
|
|
|
WARN_ON_ONCE(1);
|
2011-02-07 21:47:15 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
static void rcu_preempt_boost_start_gp(struct rcu_node *rnp)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2011-06-16 17:26:32 +02:00
|
|
|
#ifdef CONFIG_HOTPLUG_CPU
|
|
|
|
|
|
|
|
static void rcu_stop_cpu_kthread(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #ifdef CONFIG_HOTPLUG_CPU */
|
|
|
|
|
|
|
|
static void rcu_node_kthread_setaffinity(struct rcu_node *rnp, int outgoingcpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
static void rcu_cpu_kthread_setrt(int cpu, int to_rt)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2011-07-11 00:57:35 +02:00
|
|
|
static int __init rcu_scheduler_really_started(void)
|
|
|
|
{
|
|
|
|
rcu_scheduler_fully_active = 1;
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
early_initcall(rcu_scheduler_really_started);
|
|
|
|
|
2011-06-16 17:26:32 +02:00
|
|
|
static void __cpuinit rcu_prepare_kthreads(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2011-02-07 21:47:15 +01:00
|
|
|
#endif /* #else #ifdef CONFIG_RCU_BOOST */
|
|
|
|
|
2010-10-21 05:29:05 +02:00
|
|
|
#ifndef CONFIG_SMP
|
|
|
|
|
|
|
|
void synchronize_sched_expedited(void)
|
|
|
|
{
|
|
|
|
cond_resched();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(synchronize_sched_expedited);
|
|
|
|
|
|
|
|
#else /* #ifndef CONFIG_SMP */
|
|
|
|
|
2010-11-23 06:36:11 +01:00
|
|
|
static atomic_t sync_sched_expedited_started = ATOMIC_INIT(0);
|
|
|
|
static atomic_t sync_sched_expedited_done = ATOMIC_INIT(0);
|
2010-10-21 05:29:05 +02:00
|
|
|
|
|
|
|
static int synchronize_sched_expedited_cpu_stop(void *data)
|
|
|
|
{
|
|
|
|
/*
|
|
|
|
* There must be a full memory barrier on each affected CPU
|
|
|
|
* between the time that try_stop_cpus() is called and the
|
|
|
|
* time that it returns.
|
|
|
|
*
|
|
|
|
* In the current initial implementation of cpu_stop, the
|
|
|
|
* above condition is already met when the control reaches
|
|
|
|
* this point and the following smp_mb() is not strictly
|
|
|
|
* necessary. Do smp_mb() anyway for documentation and
|
|
|
|
* robustness against future implementation changes.
|
|
|
|
*/
|
|
|
|
smp_mb(); /* See above comment block. */
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Wait for an rcu-sched grace period to elapse, but use "big hammer"
|
|
|
|
* approach to force grace period to end quickly. This consumes
|
|
|
|
* significant time on all CPUs, and is thus not recommended for
|
|
|
|
* any sort of common-case code.
|
|
|
|
*
|
|
|
|
* Note that it is illegal to call this function while holding any
|
|
|
|
* lock that is acquired by a CPU-hotplug notifier. Failing to
|
|
|
|
* observe this restriction will result in deadlock.
|
rcu: fix race condition in synchronize_sched_expedited()
The new (early 2010) implementation of synchronize_sched_expedited() uses
try_stop_cpu() to force a context switch on every CPU. It also permits
concurrent calls to synchronize_sched_expedited() to share a single call
to try_stop_cpu() through use of an atomically incremented
synchronize_sched_expedited_count variable. Unfortunately, this is
subject to failure as follows:
o Task A invokes synchronize_sched_expedited(), try_stop_cpus()
succeeds, but Task A is preempted before getting to the atomic
increment of synchronize_sched_expedited_count.
o Task B also invokes synchronize_sched_expedited(), with exactly
the same outcome as Task A.
o Task C also invokes synchronize_sched_expedited(), again with
exactly the same outcome as Tasks A and B.
o Task D also invokes synchronize_sched_expedited(), but only
gets as far as acquiring the mutex within try_stop_cpus()
before being preempted, interrupted, or otherwise delayed.
o Task E also invokes synchronize_sched_expedited(), but only
gets to the snapshotting of synchronize_sched_expedited_count.
o Tasks A, B, and C all increment synchronize_sched_expedited_count.
o Task E fails to get the mutex, so checks the new value
of synchronize_sched_expedited_count. It finds that the
value has increased, so (wrongly) assumes that its work
has been done, returning despite there having been no
expedited grace period since it began.
The solution is to have the lowest-numbered CPU atomically increment
the synchronize_sched_expedited_count variable within the
synchronize_sched_expedited_cpu_stop() function, which is under
the protection of the mutex acquired by try_stop_cpus(). However, this
also requires that piggybacking tasks wait for three rather than two
instances of try_stop_cpu(), because we cannot control the order in
which the per-CPU callback function occur.
Cc: Tejun Heo <tj@kernel.org>
Cc: Lai Jiangshan <laijs@cn.fujitsu.com>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2010-10-25 16:39:22 +02:00
|
|
|
*
|
2010-11-23 06:36:11 +01:00
|
|
|
* This implementation can be thought of as an application of ticket
|
|
|
|
* locking to RCU, with sync_sched_expedited_started and
|
|
|
|
* sync_sched_expedited_done taking on the roles of the halves
|
|
|
|
* of the ticket-lock word. Each task atomically increments
|
|
|
|
* sync_sched_expedited_started upon entry, snapshotting the old value,
|
|
|
|
* then attempts to stop all the CPUs. If this succeeds, then each
|
|
|
|
* CPU will have executed a context switch, resulting in an RCU-sched
|
|
|
|
* grace period. We are then done, so we use atomic_cmpxchg() to
|
|
|
|
* update sync_sched_expedited_done to match our snapshot -- but
|
|
|
|
* only if someone else has not already advanced past our snapshot.
|
|
|
|
*
|
|
|
|
* On the other hand, if try_stop_cpus() fails, we check the value
|
|
|
|
* of sync_sched_expedited_done. If it has advanced past our
|
|
|
|
* initial snapshot, then someone else must have forced a grace period
|
|
|
|
* some time after we took our snapshot. In this case, our work is
|
|
|
|
* done for us, and we can simply return. Otherwise, we try again,
|
|
|
|
* but keep our initial snapshot for purposes of checking for someone
|
|
|
|
* doing our work for us.
|
|
|
|
*
|
|
|
|
* If we fail too many times in a row, we fall back to synchronize_sched().
|
2010-10-21 05:29:05 +02:00
|
|
|
*/
|
|
|
|
void synchronize_sched_expedited(void)
|
|
|
|
{
|
2010-11-23 06:36:11 +01:00
|
|
|
int firstsnap, s, snap, trycount = 0;
|
2010-10-21 05:29:05 +02:00
|
|
|
|
2010-11-23 06:36:11 +01:00
|
|
|
/* Note that atomic_inc_return() implies full memory barrier. */
|
|
|
|
firstsnap = snap = atomic_inc_return(&sync_sched_expedited_started);
|
2010-10-21 05:29:05 +02:00
|
|
|
get_online_cpus();
|
2010-11-23 06:36:11 +01:00
|
|
|
|
|
|
|
/*
|
|
|
|
* Each pass through the following loop attempts to force a
|
|
|
|
* context switch on each CPU.
|
|
|
|
*/
|
2010-10-21 05:29:05 +02:00
|
|
|
while (try_stop_cpus(cpu_online_mask,
|
|
|
|
synchronize_sched_expedited_cpu_stop,
|
|
|
|
NULL) == -EAGAIN) {
|
|
|
|
put_online_cpus();
|
2010-11-23 06:36:11 +01:00
|
|
|
|
|
|
|
/* No joy, try again later. Or just synchronize_sched(). */
|
2010-10-21 05:29:05 +02:00
|
|
|
if (trycount++ < 10)
|
|
|
|
udelay(trycount * num_online_cpus());
|
|
|
|
else {
|
|
|
|
synchronize_sched();
|
|
|
|
return;
|
|
|
|
}
|
2010-11-23 06:36:11 +01:00
|
|
|
|
|
|
|
/* Check to see if someone else did our work for us. */
|
|
|
|
s = atomic_read(&sync_sched_expedited_done);
|
|
|
|
if (UINT_CMP_GE((unsigned)s, (unsigned)firstsnap)) {
|
2010-10-21 05:29:05 +02:00
|
|
|
smp_mb(); /* ensure test happens before caller kfree */
|
|
|
|
return;
|
|
|
|
}
|
2010-11-23 06:36:11 +01:00
|
|
|
|
|
|
|
/*
|
|
|
|
* Refetching sync_sched_expedited_started allows later
|
|
|
|
* callers to piggyback on our grace period. We subtract
|
|
|
|
* 1 to get the same token that the last incrementer got.
|
|
|
|
* We retry after they started, so our grace period works
|
|
|
|
* for them, and they started after our first try, so their
|
|
|
|
* grace period works for us.
|
|
|
|
*/
|
2010-10-21 05:29:05 +02:00
|
|
|
get_online_cpus();
|
2011-09-22 22:18:44 +02:00
|
|
|
snap = atomic_read(&sync_sched_expedited_started);
|
2010-11-23 06:36:11 +01:00
|
|
|
smp_mb(); /* ensure read is before try_stop_cpus(). */
|
2010-10-21 05:29:05 +02:00
|
|
|
}
|
2010-11-23 06:36:11 +01:00
|
|
|
|
|
|
|
/*
|
|
|
|
* Everyone up to our most recent fetch is covered by our grace
|
|
|
|
* period. Update the counter, but only if our work is still
|
|
|
|
* relevant -- which it won't be if someone who started later
|
|
|
|
* than we did beat us to the punch.
|
|
|
|
*/
|
|
|
|
do {
|
|
|
|
s = atomic_read(&sync_sched_expedited_done);
|
|
|
|
if (UINT_CMP_GE((unsigned)s, (unsigned)snap)) {
|
|
|
|
smp_mb(); /* ensure test happens before caller kfree */
|
|
|
|
break;
|
|
|
|
}
|
|
|
|
} while (atomic_cmpxchg(&sync_sched_expedited_done, s, snap) != s);
|
|
|
|
|
2010-10-21 05:29:05 +02:00
|
|
|
put_online_cpus();
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL_GPL(synchronize_sched_expedited);
|
|
|
|
|
|
|
|
#endif /* #else #ifndef CONFIG_SMP */
|
|
|
|
|
2010-02-23 02:04:59 +01:00
|
|
|
#if !defined(CONFIG_RCU_FAST_NO_HZ)
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Check to see if any future RCU-related work will need to be done
|
|
|
|
* by the current CPU, even if none need be done immediately, returning
|
|
|
|
* 1 if so. This function is part of the RCU implementation; it is -not-
|
|
|
|
* an exported member of the RCU API.
|
|
|
|
*
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
* Because we not have RCU_FAST_NO_HZ, just check whether this CPU needs
|
|
|
|
* any flavor of RCU.
|
2010-02-23 02:04:59 +01:00
|
|
|
*/
|
|
|
|
int rcu_needs_cpu(int cpu)
|
|
|
|
{
|
2011-11-02 14:54:54 +01:00
|
|
|
return rcu_cpu_has_callbacks(cpu);
|
|
|
|
}
|
|
|
|
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
/*
|
|
|
|
* Because we do not have RCU_FAST_NO_HZ, don't bother initializing for it.
|
|
|
|
*/
|
|
|
|
static void rcu_prepare_for_idle_init(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Because we do not have RCU_FAST_NO_HZ, don't bother cleaning up
|
|
|
|
* after it.
|
|
|
|
*/
|
|
|
|
static void rcu_cleanup_after_idle(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2011-11-02 14:54:54 +01:00
|
|
|
/*
|
|
|
|
* Do the idle-entry grace-period work, which, because CONFIG_RCU_FAST_NO_HZ=y,
|
|
|
|
* is nothing.
|
|
|
|
*/
|
|
|
|
static void rcu_prepare_for_idle(int cpu)
|
|
|
|
{
|
|
|
|
}
|
|
|
|
|
2010-02-23 02:04:59 +01:00
|
|
|
#else /* #if !defined(CONFIG_RCU_FAST_NO_HZ) */
|
|
|
|
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
#define RCU_NEEDS_CPU_FLUSHES 5 /* Allow for callback self-repost. */
|
|
|
|
#define RCU_IDLE_GP_DELAY 6 /* Roughly one grace period. */
|
2010-02-27 01:38:56 +01:00
|
|
|
static DEFINE_PER_CPU(int, rcu_dyntick_drain);
|
2010-02-27 01:38:58 +01:00
|
|
|
static DEFINE_PER_CPU(unsigned long, rcu_dyntick_holdoff);
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
static DEFINE_PER_CPU(struct hrtimer, rcu_idle_gp_timer);
|
|
|
|
static ktime_t rcu_idle_gp_wait;
|
2010-02-23 02:04:59 +01:00
|
|
|
|
|
|
|
/*
|
2011-11-02 14:54:54 +01:00
|
|
|
* Allow the CPU to enter dyntick-idle mode if either: (1) There are no
|
|
|
|
* callbacks on this CPU, (2) this CPU has not yet attempted to enter
|
|
|
|
* dyntick-idle mode, or (3) this CPU is in the process of attempting to
|
|
|
|
* enter dyntick-idle mode. Otherwise, if we have recently tried and failed
|
|
|
|
* to enter dyntick-idle mode, we refuse to try to enter it. After all,
|
|
|
|
* it is better to incur scheduling-clock interrupts than to spin
|
|
|
|
* continuously for the same time duration!
|
|
|
|
*/
|
|
|
|
int rcu_needs_cpu(int cpu)
|
|
|
|
{
|
|
|
|
/* If no callbacks, RCU doesn't need the CPU. */
|
|
|
|
if (!rcu_cpu_has_callbacks(cpu))
|
|
|
|
return 0;
|
|
|
|
/* Otherwise, RCU needs the CPU only if it recently tried and failed. */
|
|
|
|
return per_cpu(rcu_dyntick_holdoff, cpu) == jiffies;
|
|
|
|
}
|
|
|
|
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
/*
|
|
|
|
* Timer handler used to force CPU to start pushing its remaining RCU
|
|
|
|
* callbacks in the case where it entered dyntick-idle mode with callbacks
|
|
|
|
* pending. The hander doesn't really need to do anything because the
|
|
|
|
* real work is done upon re-entry to idle, or by the next scheduling-clock
|
|
|
|
* interrupt should idle not be re-entered.
|
|
|
|
*/
|
|
|
|
static enum hrtimer_restart rcu_idle_gp_timer_func(struct hrtimer *hrtp)
|
|
|
|
{
|
|
|
|
trace_rcu_prep_idle("Timer");
|
|
|
|
return HRTIMER_NORESTART;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Initialize the timer used to pull CPUs out of dyntick-idle mode.
|
|
|
|
*/
|
|
|
|
static void rcu_prepare_for_idle_init(int cpu)
|
|
|
|
{
|
|
|
|
static int firsttime = 1;
|
|
|
|
struct hrtimer *hrtp = &per_cpu(rcu_idle_gp_timer, cpu);
|
|
|
|
|
|
|
|
hrtimer_init(hrtp, CLOCK_MONOTONIC, HRTIMER_MODE_REL);
|
|
|
|
hrtp->function = rcu_idle_gp_timer_func;
|
|
|
|
if (firsttime) {
|
|
|
|
unsigned int upj = jiffies_to_usecs(RCU_IDLE_GP_DELAY);
|
|
|
|
|
|
|
|
rcu_idle_gp_wait = ns_to_ktime(upj * (u64)1000);
|
|
|
|
firsttime = 0;
|
|
|
|
}
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Clean up for exit from idle. Because we are exiting from idle, there
|
|
|
|
* is no longer any point to rcu_idle_gp_timer, so cancel it. This will
|
|
|
|
* do nothing if this timer is not active, so just cancel it unconditionally.
|
|
|
|
*/
|
|
|
|
static void rcu_cleanup_after_idle(int cpu)
|
|
|
|
{
|
|
|
|
hrtimer_cancel(&per_cpu(rcu_idle_gp_timer, cpu));
|
|
|
|
}
|
|
|
|
|
2011-11-02 14:54:54 +01:00
|
|
|
/*
|
|
|
|
* Check to see if any RCU-related work can be done by the current CPU,
|
|
|
|
* and if so, schedule a softirq to get it done. This function is part
|
|
|
|
* of the RCU implementation; it is -not- an exported member of the RCU API.
|
2010-02-23 02:04:59 +01:00
|
|
|
*
|
2011-11-02 14:54:54 +01:00
|
|
|
* The idea is for the current CPU to clear out all work required by the
|
|
|
|
* RCU core for the current grace period, so that this CPU can be permitted
|
|
|
|
* to enter dyntick-idle mode. In some cases, it will need to be awakened
|
|
|
|
* at the end of the grace period by whatever CPU ends the grace period.
|
|
|
|
* This allows CPUs to go dyntick-idle more quickly, and to reduce the
|
|
|
|
* number of wakeups by a modest integer factor.
|
2010-02-27 01:38:56 +01:00
|
|
|
*
|
|
|
|
* Because it is not legal to invoke rcu_process_callbacks() with irqs
|
|
|
|
* disabled, we do one pass of force_quiescent_state(), then do a
|
2011-06-16 00:47:09 +02:00
|
|
|
* invoke_rcu_core() to cause rcu_process_callbacks() to be invoked
|
2011-02-07 21:47:15 +01:00
|
|
|
* later. The per-cpu rcu_dyntick_drain variable controls the sequencing.
|
2011-11-02 14:54:54 +01:00
|
|
|
*
|
|
|
|
* The caller must have disabled interrupts.
|
2010-02-23 02:04:59 +01:00
|
|
|
*/
|
2011-11-02 14:54:54 +01:00
|
|
|
static void rcu_prepare_for_idle(int cpu)
|
2010-02-23 02:04:59 +01:00
|
|
|
{
|
2011-11-23 02:46:19 +01:00
|
|
|
unsigned long flags;
|
|
|
|
|
|
|
|
local_irq_save(flags);
|
2010-02-23 02:04:59 +01:00
|
|
|
|
2011-11-23 02:07:11 +01:00
|
|
|
/*
|
2011-11-23 05:43:02 +01:00
|
|
|
* If there are no callbacks on this CPU, enter dyntick-idle mode.
|
|
|
|
* Also reset state to avoid prejudicing later attempts.
|
2011-11-23 02:07:11 +01:00
|
|
|
*/
|
2011-11-02 14:54:54 +01:00
|
|
|
if (!rcu_cpu_has_callbacks(cpu)) {
|
|
|
|
per_cpu(rcu_dyntick_holdoff, cpu) = jiffies - 1;
|
2011-11-23 02:07:11 +01:00
|
|
|
per_cpu(rcu_dyntick_drain, cpu) = 0;
|
2011-11-23 02:46:19 +01:00
|
|
|
local_irq_restore(flags);
|
2011-11-22 23:58:03 +01:00
|
|
|
trace_rcu_prep_idle("No callbacks");
|
2011-11-02 14:54:54 +01:00
|
|
|
return;
|
2010-04-26 06:04:29 +02:00
|
|
|
}
|
2011-11-23 02:07:11 +01:00
|
|
|
|
|
|
|
/*
|
|
|
|
* If in holdoff mode, just return. We will presumably have
|
|
|
|
* refrained from disabling the scheduling-clock tick.
|
|
|
|
*/
|
2011-11-22 23:58:03 +01:00
|
|
|
if (per_cpu(rcu_dyntick_holdoff, cpu) == jiffies) {
|
2011-11-23 02:46:19 +01:00
|
|
|
local_irq_restore(flags);
|
2011-11-22 23:58:03 +01:00
|
|
|
trace_rcu_prep_idle("In holdoff");
|
2011-11-02 14:54:54 +01:00
|
|
|
return;
|
2011-11-22 23:58:03 +01:00
|
|
|
}
|
2010-02-27 01:38:56 +01:00
|
|
|
|
|
|
|
/* Check and update the rcu_dyntick_drain sequencing. */
|
|
|
|
if (per_cpu(rcu_dyntick_drain, cpu) <= 0) {
|
|
|
|
/* First time through, initialize the counter. */
|
|
|
|
per_cpu(rcu_dyntick_drain, cpu) = RCU_NEEDS_CPU_FLUSHES;
|
|
|
|
} else if (--per_cpu(rcu_dyntick_drain, cpu) <= 0) {
|
rcu: Permit dyntick-idle with callbacks pending
The current implementation of RCU_FAST_NO_HZ prevents CPUs from entering
dyntick-idle state if they have RCU callbacks pending. Unfortunately,
this has the side-effect of often preventing them from entering this
state, especially if at least one other CPU is not in dyntick-idle state.
However, the resulting per-tick wakeup is wasteful in many cases: if the
CPU has already fully responded to the current RCU grace period, there
will be nothing for it to do until this grace period ends, which will
frequently take several jiffies.
This commit therefore permits a CPU that has done everything that the
current grace period has asked of it (rcu_pending() == 0) even if it
still as RCU callbacks pending. However, such a CPU posts a timer to
wake it up several jiffies later (6 jiffies, based on experience with
grace-period lengths). This wakeup is required to handle situations
that can result in all CPUs being in dyntick-idle mode, thus failing
to ever complete the current grace period. If a CPU wakes up before
the timer goes off, then it cancels that timer, thus avoiding spurious
wakeups.
Signed-off-by: Paul E. McKenney <paul.mckenney@linaro.org>
Signed-off-by: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
2011-11-28 21:28:34 +01:00
|
|
|
/* Can we go dyntick-idle despite still having callbacks? */
|
|
|
|
if (!rcu_pending(cpu)) {
|
|
|
|
trace_rcu_prep_idle("Dyntick with callbacks");
|
|
|
|
per_cpu(rcu_dyntick_holdoff, cpu) = jiffies - 1;
|
|
|
|
hrtimer_start(&per_cpu(rcu_idle_gp_timer, cpu),
|
|
|
|
rcu_idle_gp_wait, HRTIMER_MODE_REL);
|
|
|
|
return; /* Nothing more to do immediately. */
|
|
|
|
}
|
|
|
|
|
2010-02-27 01:38:56 +01:00
|
|
|
/* We have hit the limit, so time to give up. */
|
2010-02-27 01:38:58 +01:00
|
|
|
per_cpu(rcu_dyntick_holdoff, cpu) = jiffies;
|
2011-11-23 02:46:19 +01:00
|
|
|
local_irq_restore(flags);
|
2011-11-22 23:58:03 +01:00
|
|
|
trace_rcu_prep_idle("Begin holdoff");
|
2011-11-02 14:54:54 +01:00
|
|
|
invoke_rcu_core(); /* Force the CPU out of dyntick-idle. */
|
|
|
|
return;
|
2010-02-27 01:38:56 +01:00
|
|
|
}
|
|
|
|
|
2011-11-02 14:54:54 +01:00
|
|
|
/*
|
|
|
|
* Do one step of pushing the remaining RCU callbacks through
|
|
|
|
* the RCU core state machine.
|
|
|
|
*/
|
|
|
|
#ifdef CONFIG_TREE_PREEMPT_RCU
|
|
|
|
if (per_cpu(rcu_preempt_data, cpu).nxtlist) {
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_restore(flags);
|
2011-11-02 14:54:54 +01:00
|
|
|
rcu_preempt_qs(cpu);
|
|
|
|
force_quiescent_state(&rcu_preempt_state, 0);
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_save(flags);
|
2011-11-02 14:54:54 +01:00
|
|
|
}
|
|
|
|
#endif /* #ifdef CONFIG_TREE_PREEMPT_RCU */
|
2010-02-27 01:38:56 +01:00
|
|
|
if (per_cpu(rcu_sched_data, cpu).nxtlist) {
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_restore(flags);
|
2010-02-27 01:38:56 +01:00
|
|
|
rcu_sched_qs(cpu);
|
|
|
|
force_quiescent_state(&rcu_sched_state, 0);
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_save(flags);
|
2010-02-27 01:38:56 +01:00
|
|
|
}
|
|
|
|
if (per_cpu(rcu_bh_data, cpu).nxtlist) {
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_restore(flags);
|
2010-02-27 01:38:56 +01:00
|
|
|
rcu_bh_qs(cpu);
|
|
|
|
force_quiescent_state(&rcu_bh_state, 0);
|
2011-11-23 06:08:13 +01:00
|
|
|
local_irq_save(flags);
|
2010-02-23 02:04:59 +01:00
|
|
|
}
|
|
|
|
|
2011-11-22 23:58:03 +01:00
|
|
|
/*
|
|
|
|
* If RCU callbacks are still pending, RCU still needs this CPU.
|
|
|
|
* So try forcing the callbacks through the grace period.
|
|
|
|
*/
|
2011-11-23 06:08:13 +01:00
|
|
|
if (rcu_cpu_has_callbacks(cpu)) {
|
2011-11-23 02:46:19 +01:00
|
|
|
local_irq_restore(flags);
|
2011-11-22 23:58:03 +01:00
|
|
|
trace_rcu_prep_idle("More callbacks");
|
2011-06-16 00:47:09 +02:00
|
|
|
invoke_rcu_core();
|
2011-11-23 02:46:19 +01:00
|
|
|
} else {
|
|
|
|
local_irq_restore(flags);
|
2011-11-22 23:58:03 +01:00
|
|
|
trace_rcu_prep_idle("Callbacks drained");
|
2011-11-23 02:46:19 +01:00
|
|
|
}
|
2010-02-23 02:04:59 +01:00
|
|
|
}
|
|
|
|
|
|
|
|
#endif /* #else #if !defined(CONFIG_RCU_FAST_NO_HZ) */
|