Merge branch 'core-rcu-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip
Pull RCU updates from Ingo Molnar: "The main changes in this cycle are: - Documentation updates - RCU CPU stall-warning updates - Torture-test updates - Miscellaneous fixes Size wise the biggest updates are to documentation. Excluding documentation most of the code increase comes from a single commit which expands debugging" * 'core-rcu-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip: (24 commits) srcu: Add parameters to SRCU docbook comments doc: Rewrite confusing statement about memory barriers memory-barriers.txt: Fix typo in pairing example rcu/segcblist: Include rcupdate.h rcu: Add extended-quiescent-state testing advice rcu: Suppress lockdep false-positive ->boost_mtx complaints rcu: Do not include rtmutex_common.h unconditionally torture: Provide TMPDIR environment variable to specify tmpdir rcutorture: Dump writer stack if stalled rcutorture: Add interrupt-disable capability to stall-warning tests rcu: Suppress RCU CPU stall warnings while dumping trace rcu: Turn off tracing before dumping trace rcu: Make RCU CPU stall warnings check for irq-disabled CPUs sched,rcu: Make cond_resched() provide RCU quiescent state sched: Make resched_cpu() unconditional irq_work: Map irq_work_on_queue() to irq_work_on() in !SMP rcu: Create call_rcu_tasks() kthread at boot time rcu: Fix up pending cbs check in rcu_prepare_for_idle memory-barriers: Rework multicopy-atomicity section memory-barriers: Replace uses of "transitive" ...
This commit is contained in:
Linus Torvalds
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<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.01 Transitional//EN"
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"http://www.w3.org/TR/html4/loose.dtd">
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<html>
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<head><title>A Diagram of TREE_RCU's Grace-Period Memory Ordering</title>
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<meta HTTP-EQUIV="Content-Type" CONTENT="text/html; charset=iso-8859-1">
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<p><img src="TreeRCU-gp.svg" alt="TreeRCU-gp.svg">
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</body></html>
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<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.01 Transitional//EN"
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"http://www.w3.org/TR/html4/loose.dtd">
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<html>
|
||||
<head><title>A Tour Through TREE_RCU's Grace-Period Memory Ordering</title>
|
||||
<meta HTTP-EQUIV="Content-Type" CONTENT="text/html; charset=iso-8859-1">
|
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|
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<p>August 8, 2017</p>
|
||||
<p>This article was contributed by Paul E. McKenney</p>
|
||||
|
||||
<h3>Introduction</h3>
|
||||
|
||||
<p>This document gives a rough visual overview of how Tree RCU's
|
||||
grace-period memory ordering guarantee is provided.
|
||||
|
||||
<ol>
|
||||
<li> <a href="#What Is Tree RCU's Grace Period Memory Ordering Guarantee?">
|
||||
What Is Tree RCU's Grace Period Memory Ordering Guarantee?</a>
|
||||
<li> <a href="#Tree RCU Grace Period Memory Ordering Building Blocks">
|
||||
Tree RCU Grace Period Memory Ordering Building Blocks</a>
|
||||
<li> <a href="#Tree RCU Grace Period Memory Ordering Components">
|
||||
Tree RCU Grace Period Memory Ordering Components</a>
|
||||
<li> <a href="#Putting It All Together">Putting It All Together</a>
|
||||
</ol>
|
||||
|
||||
<h3><a name="What Is Tree RCU's Grace Period Memory Ordering Guarantee?">
|
||||
What Is Tree RCU's Grace Period Memory Ordering Guarantee?</a></h3>
|
||||
|
||||
<p>RCU grace periods provide extremely strong memory-ordering guarantees
|
||||
for non-idle non-offline code.
|
||||
Any code that happens after the end of a given RCU grace period is guaranteed
|
||||
to see the effects of all accesses prior to the beginning of that grace
|
||||
period that are within RCU read-side critical sections.
|
||||
Similarly, any code that happens before the beginning of a given RCU grace
|
||||
period is guaranteed to see the effects of all accesses following the end
|
||||
of that grace period that are within RCU read-side critical sections.
|
||||
|
||||
<p>This guarantee is particularly pervasive for <tt>synchronize_sched()</tt>,
|
||||
for which RCU-sched read-side critical sections include any region
|
||||
of code for which preemption is disabled.
|
||||
Given that each individual machine instruction can be thought of as
|
||||
an extremely small region of preemption-disabled code, one can think of
|
||||
<tt>synchronize_sched()</tt> as <tt>smp_mb()</tt> on steroids.
|
||||
|
||||
<p>RCU updaters use this guarantee by splitting their updates into
|
||||
two phases, one of which is executed before the grace period and
|
||||
the other of which is executed after the grace period.
|
||||
In the most common use case, phase one removes an element from
|
||||
a linked RCU-protected data structure, and phase two frees that element.
|
||||
For this to work, any readers that have witnessed state prior to the
|
||||
phase-one update (in the common case, removal) must not witness state
|
||||
following the phase-two update (in the common case, freeing).
|
||||
|
||||
<p>The RCU implementation provides this guarantee using a network
|
||||
of lock-based critical sections, memory barriers, and per-CPU
|
||||
processing, as is described in the following sections.
|
||||
|
||||
<h3><a name="Tree RCU Grace Period Memory Ordering Building Blocks">
|
||||
Tree RCU Grace Period Memory Ordering Building Blocks</a></h3>
|
||||
|
||||
<p>The workhorse for RCU's grace-period memory ordering is the
|
||||
critical section for the <tt>rcu_node</tt> structure's
|
||||
<tt>->lock</tt>.
|
||||
These critical sections use helper functions for lock acquisition, including
|
||||
<tt>raw_spin_lock_rcu_node()</tt>,
|
||||
<tt>raw_spin_lock_irq_rcu_node()</tt>, and
|
||||
<tt>raw_spin_lock_irqsave_rcu_node()</tt>.
|
||||
Their lock-release counterparts are
|
||||
<tt>raw_spin_unlock_rcu_node()</tt>,
|
||||
<tt>raw_spin_unlock_irq_rcu_node()</tt>, and
|
||||
<tt>raw_spin_unlock_irqrestore_rcu_node()</tt>,
|
||||
respectively.
|
||||
For completeness, a
|
||||
<tt>raw_spin_trylock_rcu_node()</tt>
|
||||
is also provided.
|
||||
The key point is that the lock-acquisition functions, including
|
||||
<tt>raw_spin_trylock_rcu_node()</tt>, all invoke
|
||||
<tt>smp_mb__after_unlock_lock()</tt> immediately after successful
|
||||
acquisition of the lock.
|
||||
|
||||
<p>Therefore, for any given <tt>rcu_node</tt> struction, any access
|
||||
happening before one of the above lock-release functions will be seen
|
||||
by all CPUs as happening before any access happening after a later
|
||||
one of the above lock-acquisition functions.
|
||||
Furthermore, any access happening before one of the
|
||||
above lock-release function on any given CPU will be seen by all
|
||||
CPUs as happening before any access happening after a later one
|
||||
of the above lock-acquisition functions executing on that same CPU,
|
||||
even if the lock-release and lock-acquisition functions are operating
|
||||
on different <tt>rcu_node</tt> structures.
|
||||
Tree RCU uses these two ordering guarantees to form an ordering
|
||||
network among all CPUs that were in any way involved in the grace
|
||||
period, including any CPUs that came online or went offline during
|
||||
the grace period in question.
|
||||
|
||||
<p>The following litmus test exhibits the ordering effects of these
|
||||
lock-acquisition and lock-release functions:
|
||||
|
||||
<pre>
|
||||
1 int x, y, z;
|
||||
2
|
||||
3 void task0(void)
|
||||
4 {
|
||||
5 raw_spin_lock_rcu_node(rnp);
|
||||
6 WRITE_ONCE(x, 1);
|
||||
7 r1 = READ_ONCE(y);
|
||||
8 raw_spin_unlock_rcu_node(rnp);
|
||||
9 }
|
||||
10
|
||||
11 void task1(void)
|
||||
12 {
|
||||
13 raw_spin_lock_rcu_node(rnp);
|
||||
14 WRITE_ONCE(y, 1);
|
||||
15 r2 = READ_ONCE(z);
|
||||
16 raw_spin_unlock_rcu_node(rnp);
|
||||
17 }
|
||||
18
|
||||
19 void task2(void)
|
||||
20 {
|
||||
21 WRITE_ONCE(z, 1);
|
||||
22 smp_mb();
|
||||
23 r3 = READ_ONCE(x);
|
||||
24 }
|
||||
25
|
||||
26 WARN_ON(r1 == 0 && r2 == 0 && r3 == 0);
|
||||
</pre>
|
||||
|
||||
<p>The <tt>WARN_ON()</tt> is evaluated at “the end of time”,
|
||||
after all changes have propagated throughout the system.
|
||||
Without the <tt>smp_mb__after_unlock_lock()</tt> provided by the
|
||||
acquisition functions, this <tt>WARN_ON()</tt> could trigger, for example
|
||||
on PowerPC.
|
||||
The <tt>smp_mb__after_unlock_lock()</tt> invocations prevent this
|
||||
<tt>WARN_ON()</tt> from triggering.
|
||||
|
||||
<p>This approach must be extended to include idle CPUs, which need
|
||||
RCU's grace-period memory ordering guarantee to extend to any
|
||||
RCU read-side critical sections preceding and following the current
|
||||
idle sojourn.
|
||||
This case is handled by calls to the strongly ordered
|
||||
<tt>atomic_add_return()</tt> read-modify-write atomic operation that
|
||||
is invoked within <tt>rcu_dynticks_eqs_enter()</tt> at idle-entry
|
||||
time and within <tt>rcu_dynticks_eqs_exit()</tt> at idle-exit time.
|
||||
The grace-period kthread invokes <tt>rcu_dynticks_snap()</tt> and
|
||||
<tt>rcu_dynticks_in_eqs_since()</tt> (both of which invoke
|
||||
an <tt>atomic_add_return()</tt> of zero) to detect idle CPUs.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
But what about CPUs that remain offline for the entire
|
||||
grace period?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
Such CPUs will be offline at the beginning of the grace period,
|
||||
so the grace period won't expect quiescent states from them.
|
||||
Races between grace-period start and CPU-hotplug operations
|
||||
are mediated by the CPU's leaf <tt>rcu_node</tt> structure's
|
||||
<tt>->lock</tt> as described above.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<p>The approach must be extended to handle one final case, that
|
||||
of waking a task blocked in <tt>synchronize_rcu()</tt>.
|
||||
This task might be affinitied to a CPU that is not yet aware that
|
||||
the grace period has ended, and thus might not yet be subject to
|
||||
the grace period's memory ordering.
|
||||
Therefore, there is an <tt>smp_mb()</tt> after the return from
|
||||
<tt>wait_for_completion()</tt> in the <tt>synchronize_rcu()</tt>
|
||||
code path.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
What? Where???
|
||||
I don't see any <tt>smp_mb()</tt> after the return from
|
||||
<tt>wait_for_completion()</tt>!!!
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
That would be because I spotted the need for that
|
||||
<tt>smp_mb()</tt> during the creation of this documentation,
|
||||
and it is therefore unlikely to hit mainline before v4.14.
|
||||
Kudos to Lance Roy, Will Deacon, Peter Zijlstra, and
|
||||
Jonathan Cameron for asking questions that sensitized me
|
||||
to the rather elaborate sequence of events that demonstrate
|
||||
the need for this memory barrier.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<p>Tree RCU's grace--period memory-ordering guarantees rely most
|
||||
heavily on the <tt>rcu_node</tt> structure's <tt>->lock</tt>
|
||||
field, so much so that it is necessary to abbreviate this pattern
|
||||
in the diagrams in the next section.
|
||||
For example, consider the <tt>rcu_prepare_for_idle()</tt> function
|
||||
shown below, which is one of several functions that enforce ordering
|
||||
of newly arrived RCU callbacks against future grace periods:
|
||||
|
||||
<pre>
|
||||
1 static void rcu_prepare_for_idle(void)
|
||||
2 {
|
||||
3 bool needwake;
|
||||
4 struct rcu_data *rdp;
|
||||
5 struct rcu_dynticks *rdtp = this_cpu_ptr(&rcu_dynticks);
|
||||
6 struct rcu_node *rnp;
|
||||
7 struct rcu_state *rsp;
|
||||
8 int tne;
|
||||
9
|
||||
10 if (IS_ENABLED(CONFIG_RCU_NOCB_CPU_ALL) ||
|
||||
11 rcu_is_nocb_cpu(smp_processor_id()))
|
||||
12 return;
|
||||
13 tne = READ_ONCE(tick_nohz_active);
|
||||
14 if (tne != rdtp->tick_nohz_enabled_snap) {
|
||||
15 if (rcu_cpu_has_callbacks(NULL))
|
||||
16 invoke_rcu_core();
|
||||
17 rdtp->tick_nohz_enabled_snap = tne;
|
||||
18 return;
|
||||
19 }
|
||||
20 if (!tne)
|
||||
21 return;
|
||||
22 if (rdtp->all_lazy &&
|
||||
23 rdtp->nonlazy_posted != rdtp->nonlazy_posted_snap) {
|
||||
24 rdtp->all_lazy = false;
|
||||
25 rdtp->nonlazy_posted_snap = rdtp->nonlazy_posted;
|
||||
26 invoke_rcu_core();
|
||||
27 return;
|
||||
28 }
|
||||
29 if (rdtp->last_accelerate == jiffies)
|
||||
30 return;
|
||||
31 rdtp->last_accelerate = jiffies;
|
||||
32 for_each_rcu_flavor(rsp) {
|
||||
33 rdp = this_cpu_ptr(rsp->rda);
|
||||
34 if (rcu_segcblist_pend_cbs(&rdp->cblist))
|
||||
35 continue;
|
||||
36 rnp = rdp->mynode;
|
||||
37 raw_spin_lock_rcu_node(rnp);
|
||||
38 needwake = rcu_accelerate_cbs(rsp, rnp, rdp);
|
||||
39 raw_spin_unlock_rcu_node(rnp);
|
||||
40 if (needwake)
|
||||
41 rcu_gp_kthread_wake(rsp);
|
||||
42 }
|
||||
43 }
|
||||
</pre>
|
||||
|
||||
<p>But the only part of <tt>rcu_prepare_for_idle()</tt> that really
|
||||
matters for this discussion are lines 37–39.
|
||||
We will therefore abbreviate this function as follows:
|
||||
|
||||
</p><p><img src="rcu_node-lock.svg" alt="rcu_node-lock.svg">
|
||||
|
||||
<p>The box represents the <tt>rcu_node</tt> structure's <tt>->lock</tt>
|
||||
critical section, with the double line on top representing the additional
|
||||
<tt>smp_mb__after_unlock_lock()</tt>.
|
||||
|
||||
<h3><a name="Tree RCU Grace Period Memory Ordering Components">
|
||||
Tree RCU Grace Period Memory Ordering Components</a></h3>
|
||||
|
||||
<p>Tree RCU's grace-period memory-ordering guarantee is provided by
|
||||
a number of RCU components:
|
||||
|
||||
<ol>
|
||||
<li> <a href="#Callback Registry">Callback Registry</a>
|
||||
<li> <a href="#Grace-Period Initialization">Grace-Period Initialization</a>
|
||||
<li> <a href="#Self-Reported Quiescent States">
|
||||
Self-Reported Quiescent States</a>
|
||||
<li> <a href="#Dynamic Tick Interface">Dynamic Tick Interface</a>
|
||||
<li> <a href="#CPU-Hotplug Interface">CPU-Hotplug Interface</a>
|
||||
<li> <a href="Forcing Quiescent States">Forcing Quiescent States</a>
|
||||
<li> <a href="Grace-Period Cleanup">Grace-Period Cleanup</a>
|
||||
<li> <a href="Callback Invocation">Callback Invocation</a>
|
||||
</ol>
|
||||
|
||||
<p>Each of the following section looks at the corresponding component
|
||||
in detail.
|
||||
|
||||
<h4><a name="Callback Registry">Callback Registry</a></h4>
|
||||
|
||||
<p>If RCU's grace-period guarantee is to mean anything at all, any
|
||||
access that happens before a given invocation of <tt>call_rcu()</tt>
|
||||
must also happen before the corresponding grace period.
|
||||
The implementation of this portion of RCU's grace period guarantee
|
||||
is shown in the following figure:
|
||||
|
||||
</p><p><img src="TreeRCU-callback-registry.svg" alt="TreeRCU-callback-registry.svg">
|
||||
|
||||
<p>Because <tt>call_rcu()</tt> normally acts only on CPU-local state,
|
||||
it provides no ordering guarantees, either for itself or for
|
||||
phase one of the update (which again will usually be removal of
|
||||
an element from an RCU-protected data structure).
|
||||
It simply enqueues the <tt>rcu_head</tt> structure on a per-CPU list,
|
||||
which cannot become associated with a grace period until a later
|
||||
call to <tt>rcu_accelerate_cbs()</tt>, as shown in the diagram above.
|
||||
|
||||
<p>One set of code paths shown on the left invokes
|
||||
<tt>rcu_accelerate_cbs()</tt> via
|
||||
<tt>note_gp_changes()</tt>, either directly from <tt>call_rcu()</tt> (if
|
||||
the current CPU is inundated with queued <tt>rcu_head</tt> structures)
|
||||
or more likely from an <tt>RCU_SOFTIRQ</tt> handler.
|
||||
Another code path in the middle is taken only in kernels built with
|
||||
<tt>CONFIG_RCU_FAST_NO_HZ=y</tt>, which invokes
|
||||
<tt>rcu_accelerate_cbs()</tt> via <tt>rcu_prepare_for_idle()</tt>.
|
||||
The final code path on the right is taken only in kernels built with
|
||||
<tt>CONFIG_HOTPLUG_CPU=y</tt>, which invokes
|
||||
<tt>rcu_accelerate_cbs()</tt> via
|
||||
<tt>rcu_advance_cbs()</tt>, <tt>rcu_migrate_callbacks</tt>,
|
||||
<tt>rcutree_migrate_callbacks()</tt>, and <tt>takedown_cpu()</tt>,
|
||||
which in turn is invoked on a surviving CPU after the outgoing
|
||||
CPU has been completely offlined.
|
||||
|
||||
<p>There are a few other code paths within grace-period processing
|
||||
that opportunistically invoke <tt>rcu_accelerate_cbs()</tt>.
|
||||
However, either way, all of the CPU's recently queued <tt>rcu_head</tt>
|
||||
structures are associated with a future grace-period number under
|
||||
the protection of the CPU's lead <tt>rcu_node</tt> structure's
|
||||
<tt>->lock</tt>.
|
||||
In all cases, there is full ordering against any prior critical section
|
||||
for that same <tt>rcu_node</tt> structure's <tt>->lock</tt>, and
|
||||
also full ordering against any of the current task's or CPU's prior critical
|
||||
sections for any <tt>rcu_node</tt> structure's <tt>->lock</tt>.
|
||||
|
||||
<p>The next section will show how this ordering ensures that any
|
||||
accesses prior to the <tt>call_rcu()</tt> (particularly including phase
|
||||
one of the update)
|
||||
happen before the start of the corresponding grace period.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
But what about <tt>synchronize_rcu()</tt>?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
The <tt>synchronize_rcu()</tt> passes <tt>call_rcu()</tt>
|
||||
to <tt>wait_rcu_gp()</tt>, which invokes it.
|
||||
So either way, it eventually comes down to <tt>call_rcu()</tt>.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<h4><a name="Grace-Period Initialization">Grace-Period Initialization</a></h4>
|
||||
|
||||
<p>Grace-period initialization is carried out by
|
||||
the grace-period kernel thread, which makes several passes over the
|
||||
<tt>rcu_node</tt> tree within the <tt>rcu_gp_init()</tt> function.
|
||||
This means that showing the full flow of ordering through the
|
||||
grace-period computation will require duplicating this tree.
|
||||
If you find this confusing, please note that the state of the
|
||||
<tt>rcu_node</tt> changes over time, just like Heraclitus's river.
|
||||
However, to keep the <tt>rcu_node</tt> river tractable, the
|
||||
grace-period kernel thread's traversals are presented in multiple
|
||||
parts, starting in this section with the various phases of
|
||||
grace-period initialization.
|
||||
|
||||
<p>The first ordering-related grace-period initialization action is to
|
||||
increment the <tt>rcu_state</tt> structure's <tt>->gpnum</tt>
|
||||
grace-period-number counter, as shown below:
|
||||
|
||||
</p><p><img src="TreeRCU-gp-init-1.svg" alt="TreeRCU-gp-init-1.svg" width="75%">
|
||||
|
||||
<p>The actual increment is carried out using <tt>smp_store_release()</tt>,
|
||||
which helps reject false-positive RCU CPU stall detection.
|
||||
Note that only the root <tt>rcu_node</tt> structure is touched.
|
||||
|
||||
<p>The first pass through the <tt>rcu_node</tt> tree updates bitmasks
|
||||
based on CPUs having come online or gone offline since the start of
|
||||
the previous grace period.
|
||||
In the common case where the number of online CPUs for this <tt>rcu_node</tt>
|
||||
structure has not transitioned to or from zero,
|
||||
this pass will scan only the leaf <tt>rcu_node</tt> structures.
|
||||
However, if the number of online CPUs for a given leaf <tt>rcu_node</tt>
|
||||
structure has transitioned from zero,
|
||||
<tt>rcu_init_new_rnp()</tt> will be invoked for the first incoming CPU.
|
||||
Similarly, if the number of online CPUs for a given leaf <tt>rcu_node</tt>
|
||||
structure has transitioned to zero,
|
||||
<tt>rcu_cleanup_dead_rnp()</tt> will be invoked for the last outgoing CPU.
|
||||
The diagram below shows the path of ordering if the leftmost
|
||||
<tt>rcu_node</tt> structure onlines its first CPU and if the next
|
||||
<tt>rcu_node</tt> structure has no online CPUs
|
||||
(or, alternatively if the leftmost <tt>rcu_node</tt> structure offlines
|
||||
its last CPU and if the next <tt>rcu_node</tt> structure has no online CPUs).
|
||||
|
||||
</p><p><img src="TreeRCU-gp-init-2.svg" alt="TreeRCU-gp-init-1.svg" width="75%">
|
||||
|
||||
<p>The final <tt>rcu_gp_init()</tt> pass through the <tt>rcu_node</tt>
|
||||
tree traverses breadth-first, setting each <tt>rcu_node</tt> structure's
|
||||
<tt>->gpnum</tt> field to the newly incremented value from the
|
||||
<tt>rcu_state</tt> structure, as shown in the following diagram.
|
||||
|
||||
</p><p><img src="TreeRCU-gp-init-3.svg" alt="TreeRCU-gp-init-1.svg" width="75%">
|
||||
|
||||
<p>This change will also cause each CPU's next call to
|
||||
<tt>__note_gp_changes()</tt>
|
||||
to notice that a new grace period has started, as described in the next
|
||||
section.
|
||||
But because the grace-period kthread started the grace period at the
|
||||
root (with the increment of the <tt>rcu_state</tt> structure's
|
||||
<tt>->gpnum</tt> field) before setting each leaf <tt>rcu_node</tt>
|
||||
structure's <tt>->gpnum</tt> field, each CPU's observation of
|
||||
the start of the grace period will happen after the actual start
|
||||
of the grace period.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
But what about the CPU that started the grace period?
|
||||
Why wouldn't it see the start of the grace period right when
|
||||
it started that grace period?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
In some deep philosophical and overly anthromorphized
|
||||
sense, yes, the CPU starting the grace period is immediately
|
||||
aware of having done so.
|
||||
However, if we instead assume that RCU is not self-aware,
|
||||
then even the CPU starting the grace period does not really
|
||||
become aware of the start of this grace period until its
|
||||
first call to <tt>__note_gp_changes()</tt>.
|
||||
On the other hand, this CPU potentially gets early notification
|
||||
because it invokes <tt>__note_gp_changes()</tt> during its
|
||||
last <tt>rcu_gp_init()</tt> pass through its leaf
|
||||
<tt>rcu_node</tt> structure.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<h4><a name="Self-Reported Quiescent States">
|
||||
Self-Reported Quiescent States</a></h4>
|
||||
|
||||
<p>When all entities that might block the grace period have reported
|
||||
quiescent states (or as described in a later section, had quiescent
|
||||
states reported on their behalf), the grace period can end.
|
||||
Online non-idle CPUs report their own quiescent states, as shown
|
||||
in the following diagram:
|
||||
|
||||
</p><p><img src="TreeRCU-qs.svg" alt="TreeRCU-qs.svg" width="75%">
|
||||
|
||||
<p>This is for the last CPU to report a quiescent state, which signals
|
||||
the end of the grace period.
|
||||
Earlier quiescent states would push up the <tt>rcu_node</tt> tree
|
||||
only until they encountered an <tt>rcu_node</tt> structure that
|
||||
is waiting for additional quiescent states.
|
||||
However, ordering is nevertheless preserved because some later quiescent
|
||||
state will acquire that <tt>rcu_node</tt> structure's <tt>->lock</tt>.
|
||||
|
||||
<p>Any number of events can lead up to a CPU invoking
|
||||
<tt>note_gp_changes</tt> (or alternatively, directly invoking
|
||||
<tt>__note_gp_changes()</tt>), at which point that CPU will notice
|
||||
the start of a new grace period while holding its leaf
|
||||
<tt>rcu_node</tt> lock.
|
||||
Therefore, all execution shown in this diagram happens after the
|
||||
start of the grace period.
|
||||
In addition, this CPU will consider any RCU read-side critical
|
||||
section that started before the invocation of <tt>__note_gp_changes()</tt>
|
||||
to have started before the grace period, and thus a critical
|
||||
section that the grace period must wait on.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
But a RCU read-side critical section might have started
|
||||
after the beginning of the grace period
|
||||
(the <tt>->gpnum++</tt> from earlier), so why should
|
||||
the grace period wait on such a critical section?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
It is indeed not necessary for the grace period to wait on such
|
||||
a critical section.
|
||||
However, it is permissible to wait on it.
|
||||
And it is furthermore important to wait on it, as this
|
||||
lazy approach is far more scalable than a “big bang”
|
||||
all-at-once grace-period start could possibly be.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<p>If the CPU does a context switch, a quiescent state will be
|
||||
noted by <tt>rcu_node_context_switch()</tt> on the left.
|
||||
On the other hand, if the CPU takes a scheduler-clock interrupt
|
||||
while executing in usermode, a quiescent state will be noted by
|
||||
<tt>rcu_check_callbacks()</tt> on the right.
|
||||
Either way, the passage through a quiescent state will be noted
|
||||
in a per-CPU variable.
|
||||
|
||||
<p>The next time an <tt>RCU_SOFTIRQ</tt> handler executes on
|
||||
this CPU (for example, after the next scheduler-clock
|
||||
interrupt), <tt>__rcu_process_callbacks()</tt> will invoke
|
||||
<tt>rcu_check_quiescent_state()</tt>, which will notice the
|
||||
recorded quiescent state, and invoke
|
||||
<tt>rcu_report_qs_rdp()</tt>.
|
||||
If <tt>rcu_report_qs_rdp()</tt> verifies that the quiescent state
|
||||
really does apply to the current grace period, it invokes
|
||||
<tt>rcu_report_rnp()</tt> which traverses up the <tt>rcu_node</tt>
|
||||
tree as shown at the bottom of the diagram, clearing bits from
|
||||
each <tt>rcu_node</tt> structure's <tt>->qsmask</tt> field,
|
||||
and propagating up the tree when the result is zero.
|
||||
|
||||
<p>Note that traversal passes upwards out of a given <tt>rcu_node</tt>
|
||||
structure only if the current CPU is reporting the last quiescent
|
||||
state for the subtree headed by that <tt>rcu_node</tt> structure.
|
||||
A key point is that if a CPU's traversal stops at a given <tt>rcu_node</tt>
|
||||
structure, then there will be a later traversal by another CPU
|
||||
(or perhaps the same one) that proceeds upwards
|
||||
from that point, and the <tt>rcu_node</tt> <tt>->lock</tt>
|
||||
guarantees that the first CPU's quiescent state happens before the
|
||||
remainder of the second CPU's traversal.
|
||||
Applying this line of thought repeatedly shows that all CPUs'
|
||||
quiescent states happen before the last CPU traverses through
|
||||
the root <tt>rcu_node</tt> structure, the “last CPU”
|
||||
being the one that clears the last bit in the root <tt>rcu_node</tt>
|
||||
structure's <tt>->qsmask</tt> field.
|
||||
|
||||
<h4><a name="Dynamic Tick Interface">Dynamic Tick Interface</a></h4>
|
||||
|
||||
<p>Due to energy-efficiency considerations, RCU is forbidden from
|
||||
disturbing idle CPUs.
|
||||
CPUs are therefore required to notify RCU when entering or leaving idle
|
||||
state, which they do via fully ordered value-returning atomic operations
|
||||
on a per-CPU variable.
|
||||
The ordering effects are as shown below:
|
||||
|
||||
</p><p><img src="TreeRCU-dyntick.svg" alt="TreeRCU-dyntick.svg" width="50%">
|
||||
|
||||
<p>The RCU grace-period kernel thread samples the per-CPU idleness
|
||||
variable while holding the corresponding CPU's leaf <tt>rcu_node</tt>
|
||||
structure's <tt>->lock</tt>.
|
||||
This means that any RCU read-side critical sections that precede the
|
||||
idle period (the oval near the top of the diagram above) will happen
|
||||
before the end of the current grace period.
|
||||
Similarly, the beginning of the current grace period will happen before
|
||||
any RCU read-side critical sections that follow the
|
||||
idle period (the oval near the bottom of the diagram above).
|
||||
|
||||
<p>Plumbing this into the full grace-period execution is described
|
||||
<a href="#Forcing Quiescent States">below</a>.
|
||||
|
||||
<h4><a name="CPU-Hotplug Interface">CPU-Hotplug Interface</a></h4>
|
||||
|
||||
<p>RCU is also forbidden from disturbing offline CPUs, which might well
|
||||
be powered off and removed from the system completely.
|
||||
CPUs are therefore required to notify RCU of their comings and goings
|
||||
as part of the corresponding CPU hotplug operations.
|
||||
The ordering effects are shown below:
|
||||
|
||||
</p><p><img src="TreeRCU-hotplug.svg" alt="TreeRCU-hotplug.svg" width="50%">
|
||||
|
||||
<p>Because CPU hotplug operations are much less frequent than idle transitions,
|
||||
they are heavier weight, and thus acquire the CPU's leaf <tt>rcu_node</tt>
|
||||
structure's <tt>->lock</tt> and update this structure's
|
||||
<tt>->qsmaskinitnext</tt>.
|
||||
The RCU grace-period kernel thread samples this mask to detect CPUs
|
||||
having gone offline since the beginning of this grace period.
|
||||
|
||||
<p>Plumbing this into the full grace-period execution is described
|
||||
<a href="#Forcing Quiescent States">below</a>.
|
||||
|
||||
<h4><a name="Forcing Quiescent States">Forcing Quiescent States</a></h4>
|
||||
|
||||
<p>As noted above, idle and offline CPUs cannot report their own
|
||||
quiescent states, and therefore the grace-period kernel thread
|
||||
must do the reporting on their behalf.
|
||||
This process is called “forcing quiescent states”, it is
|
||||
repeated every few jiffies, and its ordering effects are shown below:
|
||||
|
||||
</p><p><img src="TreeRCU-gp-fqs.svg" alt="TreeRCU-gp-fqs.svg" width="100%">
|
||||
|
||||
<p>Each pass of quiescent state forcing is guaranteed to traverse the
|
||||
leaf <tt>rcu_node</tt> structures, and if there are no new quiescent
|
||||
states due to recently idled and/or offlined CPUs, then only the
|
||||
leaves are traversed.
|
||||
However, if there is a newly offlined CPU as illustrated on the left
|
||||
or a newly idled CPU as illustrated on the right, the corresponding
|
||||
quiescent state will be driven up towards the root.
|
||||
As with self-reported quiescent states, the upwards driving stops
|
||||
once it reaches an <tt>rcu_node</tt> structure that has quiescent
|
||||
states outstanding from other CPUs.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
The leftmost drive to root stopped before it reached
|
||||
the root <tt>rcu_node</tt> structure, which means that
|
||||
there are still CPUs subordinate to that structure on
|
||||
which the current grace period is waiting.
|
||||
Given that, how is it possible that the rightmost drive
|
||||
to root ended the grace period?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
Good analysis!
|
||||
It is in fact impossible in the absence of bugs in RCU.
|
||||
But this diagram is complex enough as it is, so simplicity
|
||||
overrode accuracy.
|
||||
You can think of it as poetic license, or you can think of
|
||||
it as misdirection that is resolved in the
|
||||
<a href="#Putting It All Together">stitched-together diagram</a>.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
<h4><a name="Grace-Period Cleanup">Grace-Period Cleanup</a></h4>
|
||||
|
||||
<p>Grace-period cleanup first scans the <tt>rcu_node</tt> tree
|
||||
breadth-first setting all the <tt>->completed</tt> fields equal
|
||||
to the number of the newly completed grace period, then it sets
|
||||
the <tt>rcu_state</tt> structure's <tt>->completed</tt> field,
|
||||
again to the number of the newly completed grace period.
|
||||
The ordering effects are shown below:
|
||||
|
||||
</p><p><img src="TreeRCU-gp-cleanup.svg" alt="TreeRCU-gp-cleanup.svg" width="75%">
|
||||
|
||||
<p>As indicated by the oval at the bottom of the diagram, once
|
||||
grace-period cleanup is complete, the next grace period can begin.
|
||||
|
||||
<table>
|
||||
<tr><th> </th></tr>
|
||||
<tr><th align="left">Quick Quiz:</th></tr>
|
||||
<tr><td>
|
||||
But when precisely does the grace period end?
|
||||
</td></tr>
|
||||
<tr><th align="left">Answer:</th></tr>
|
||||
<tr><td bgcolor="#ffffff"><font color="ffffff">
|
||||
There is no useful single point at which the grace period
|
||||
can be said to end.
|
||||
The earliest reasonable candidate is as soon as the last
|
||||
CPU has reported its quiescent state, but it may be some
|
||||
milliseconds before RCU becomes aware of this.
|
||||
The latest reasonable candidate is once the <tt>rcu_state</tt>
|
||||
structure's <tt>->completed</tt> field has been updated,
|
||||
but it is quite possible that some CPUs have already completed
|
||||
phase two of their updates by that time.
|
||||
In short, if you are going to work with RCU, you need to
|
||||
learn to embrace uncertainty.
|
||||
</font></td></tr>
|
||||
<tr><td> </td></tr>
|
||||
</table>
|
||||
|
||||
|
||||
<h4><a name="Callback Invocation">Callback Invocation</a></h4>
|
||||
|
||||
<p>Once a given CPU's leaf <tt>rcu_node</tt> structure's
|
||||
<tt>->completed</tt> field has been updated, that CPU can begin
|
||||
invoking its RCU callbacks that were waiting for this grace period
|
||||
to end.
|
||||
These callbacks are identified by <tt>rcu_advance_cbs()</tt>,
|
||||
which is usually invoked by <tt>__note_gp_changes()</tt>.
|
||||
As shown in the diagram below, this invocation can be triggered by
|
||||
the scheduling-clock interrupt (<tt>rcu_check_callbacks()</tt> on
|
||||
the left) or by idle entry (<tt>rcu_cleanup_after_idle()</tt> on
|
||||
the right, but only for kernels build with
|
||||
<tt>CONFIG_RCU_FAST_NO_HZ=y</tt>).
|
||||
Either way, <tt>RCU_SOFTIRQ</tt> is raised, which results in
|
||||
<tt>rcu_do_batch()</tt> invoking the callbacks, which in turn
|
||||
allows those callbacks to carry out (either directly or indirectly
|
||||
via wakeup) the needed phase-two processing for each update.
|
||||
|
||||
</p><p><img src="TreeRCU-callback-invocation.svg" alt="TreeRCU-callback-invocation.svg" width="60%">
|
||||
|
||||
<p>Please note that callback invocation can also be prompted by any
|
||||
number of corner-case code paths, for example, when a CPU notes that
|
||||
it has excessive numbers of callbacks queued.
|
||||
In all cases, the CPU acquires its leaf <tt>rcu_node</tt> structure's
|
||||
<tt>->lock</tt> before invoking callbacks, which preserves the
|
||||
required ordering against the newly completed grace period.
|
||||
|
||||
<p>However, if the callback function communicates to other CPUs,
|
||||
for example, doing a wakeup, then it is that function's responsibility
|
||||
to maintain ordering.
|
||||
For example, if the callback function wakes up a task that runs on
|
||||
some other CPU, proper ordering must in place in both the callback
|
||||
function and the task being awakened.
|
||||
To see why this is important, consider the top half of the
|
||||
<a href="#Grace-Period Cleanup">grace-period cleanup</a> diagram.
|
||||
The callback might be running on a CPU corresponding to the leftmost
|
||||
leaf <tt>rcu_node</tt> structure, and awaken a task that is to run on
|
||||
a CPU corresponding to the rightmost leaf <tt>rcu_node</tt> structure,
|
||||
and the grace-period kernel thread might not yet have reached the
|
||||
rightmost leaf.
|
||||
In this case, the grace period's memory ordering might not yet have
|
||||
reached that CPU, so again the callback function and the awakened
|
||||
task must supply proper ordering.
|
||||
|
||||
<h3><a name="Putting It All Together">Putting It All Together</a></h3>
|
||||
|
||||
<p>A stitched-together diagram is
|
||||
<a href="Tree-RCU-Diagram.html">here</a>.
|
||||
|
||||
<h3><a name="Legal Statement">
|
||||
Legal Statement</a></h3>
|
||||
|
||||
<p>This work represents the view of the author and does not necessarily
|
||||
represent the view of IBM.
|
||||
|
||||
</p><p>Linux is a registered trademark of Linus Torvalds.
|
||||
|
||||
</p><p>Other company, product, and service names may be trademarks or
|
||||
service marks of others.
|
||||
|
||||
</body></html>
|
||||
|
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id="text202"
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style="font-size:192px;font-style:normal;font-weight:bold;text-anchor:start;fill:#000000;font-family:Courier">rcu_accelerate_cbs()</text>
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After Width: | Height: | Size: 6.4 KiB |
|
|
@ -40,7 +40,9 @@ o Booting Linux using a console connection that is too slow to
|
|||
o Anything that prevents RCU's grace-period kthreads from running.
|
||||
This can result in the "All QSes seen" console-log message.
|
||||
This message will include information on when the kthread last
|
||||
ran and how often it should be expected to run.
|
||||
ran and how often it should be expected to run. It can also
|
||||
result in the "rcu_.*kthread starved for" console-log message,
|
||||
which will include additional debugging information.
|
||||
|
||||
o A CPU-bound real-time task in a CONFIG_PREEMPT kernel, which might
|
||||
happen to preempt a low-priority task in the middle of an RCU
|
||||
|
|
@ -60,6 +62,20 @@ o A CPU-bound real-time task in a CONFIG_PREEMPT_RT kernel that
|
|||
CONFIG_PREEMPT_RCU case, you might see stall-warning
|
||||
messages.
|
||||
|
||||
o A periodic interrupt whose handler takes longer than the time
|
||||
interval between successive pairs of interrupts. This can
|
||||
prevent RCU's kthreads and softirq handlers from running.
|
||||
Note that certain high-overhead debugging options, for example
|
||||
the function_graph tracer, can result in interrupt handler taking
|
||||
considerably longer than normal, which can in turn result in
|
||||
RCU CPU stall warnings.
|
||||
|
||||
o Testing a workload on a fast system, tuning the stall-warning
|
||||
timeout down to just barely avoid RCU CPU stall warnings, and then
|
||||
running the same workload with the same stall-warning timeout on a
|
||||
slow system. Note that thermal throttling and on-demand governors
|
||||
can cause a single system to be sometimes fast and sometimes slow!
|
||||
|
||||
o A hardware or software issue shuts off the scheduler-clock
|
||||
interrupt on a CPU that is not in dyntick-idle mode. This
|
||||
problem really has happened, and seems to be most likely to
|
||||
|
|
@ -155,67 +171,32 @@ Interpreting RCU's CPU Stall-Detector "Splats"
|
|||
For non-RCU-tasks flavors of RCU, when a CPU detects that it is stalling,
|
||||
it will print a message similar to the following:
|
||||
|
||||
INFO: rcu_sched_state detected stall on CPU 5 (t=2500 jiffies)
|
||||
INFO: rcu_sched detected stalls on CPUs/tasks:
|
||||
2-...: (3 GPs behind) idle=06c/0/0 softirq=1453/1455 fqs=0
|
||||
16-...: (0 ticks this GP) idle=81c/0/0 softirq=764/764 fqs=0
|
||||
(detected by 32, t=2603 jiffies, g=7073, c=7072, q=625)
|
||||
|
||||
This message indicates that CPU 5 detected that it was causing a stall,
|
||||
and that the stall was affecting RCU-sched. This message will normally be
|
||||
followed by a stack dump of the offending CPU. On TREE_RCU kernel builds,
|
||||
RCU and RCU-sched are implemented by the same underlying mechanism,
|
||||
while on PREEMPT_RCU kernel builds, RCU is instead implemented
|
||||
by rcu_preempt_state.
|
||||
|
||||
On the other hand, if the offending CPU fails to print out a stall-warning
|
||||
message quickly enough, some other CPU will print a message similar to
|
||||
the following:
|
||||
|
||||
INFO: rcu_bh_state detected stalls on CPUs/tasks: { 3 5 } (detected by 2, 2502 jiffies)
|
||||
|
||||
This message indicates that CPU 2 detected that CPUs 3 and 5 were both
|
||||
causing stalls, and that the stall was affecting RCU-bh. This message
|
||||
This message indicates that CPU 32 detected that CPUs 2 and 16 were both
|
||||
causing stalls, and that the stall was affecting RCU-sched. This message
|
||||
will normally be followed by stack dumps for each CPU. Please note that
|
||||
PREEMPT_RCU builds can be stalled by tasks as well as by CPUs,
|
||||
and that the tasks will be indicated by PID, for example, "P3421".
|
||||
It is even possible for a rcu_preempt_state stall to be caused by both
|
||||
CPUs -and- tasks, in which case the offending CPUs and tasks will all
|
||||
be called out in the list.
|
||||
PREEMPT_RCU builds can be stalled by tasks as well as by CPUs, and that
|
||||
the tasks will be indicated by PID, for example, "P3421". It is even
|
||||
possible for a rcu_preempt_state stall to be caused by both CPUs -and-
|
||||
tasks, in which case the offending CPUs and tasks will all be called
|
||||
out in the list.
|
||||
|
||||
Finally, if the grace period ends just as the stall warning starts
|
||||
printing, there will be a spurious stall-warning message:
|
||||
|
||||
INFO: rcu_bh_state detected stalls on CPUs/tasks: { } (detected by 4, 2502 jiffies)
|
||||
|
||||
This is rare, but does happen from time to time in real life. It is also
|
||||
possible for a zero-jiffy stall to be flagged in this case, depending
|
||||
on how the stall warning and the grace-period initialization happen to
|
||||
interact. Please note that it is not possible to entirely eliminate this
|
||||
sort of false positive without resorting to things like stop_machine(),
|
||||
which is overkill for this sort of problem.
|
||||
|
||||
Recent kernels will print a long form of the stall-warning message:
|
||||
|
||||
INFO: rcu_preempt detected stall on CPU
|
||||
0: (63959 ticks this GP) idle=241/3fffffffffffffff/0 softirq=82/543
|
||||
(t=65000 jiffies)
|
||||
|
||||
In kernels with CONFIG_RCU_FAST_NO_HZ, more information is printed:
|
||||
|
||||
INFO: rcu_preempt detected stall on CPU
|
||||
0: (64628 ticks this GP) idle=dd5/3fffffffffffffff/0 softirq=82/543 last_accelerate: a345/d342 nonlazy_posted: 25 .D
|
||||
(t=65000 jiffies)
|
||||
|
||||
The "(64628 ticks this GP)" indicates that this CPU has taken more
|
||||
than 64,000 scheduling-clock interrupts during the current stalled
|
||||
grace period. If the CPU was not yet aware of the current grace
|
||||
period (for example, if it was offline), then this part of the message
|
||||
indicates how many grace periods behind the CPU is.
|
||||
CPU 2's "(3 GPs behind)" indicates that this CPU has not interacted with
|
||||
the RCU core for the past three grace periods. In contrast, CPU 16's "(0
|
||||
ticks this GP)" indicates that this CPU has not taken any scheduling-clock
|
||||
interrupts during the current stalled grace period.
|
||||
|
||||
The "idle=" portion of the message prints the dyntick-idle state.
|
||||
The hex number before the first "/" is the low-order 12 bits of the
|
||||
dynticks counter, which will have an even-numbered value if the CPU is
|
||||
in dyntick-idle mode and an odd-numbered value otherwise. The hex
|
||||
number between the two "/"s is the value of the nesting, which will
|
||||
be a small positive number if in the idle loop and a very large positive
|
||||
number (as shown above) otherwise.
|
||||
dynticks counter, which will have an even-numbered value if the CPU
|
||||
is in dyntick-idle mode and an odd-numbered value otherwise. The hex
|
||||
number between the two "/"s is the value of the nesting, which will be
|
||||
a small non-negative number if in the idle loop (as shown above) and a
|
||||
very large positive number otherwise.
|
||||
|
||||
The "softirq=" portion of the message tracks the number of RCU softirq
|
||||
handlers that the stalled CPU has executed. The number before the "/"
|
||||
|
|
@ -230,24 +211,72 @@ handlers are no longer able to execute on this CPU. This can happen if
|
|||
the stalled CPU is spinning with interrupts are disabled, or, in -rt
|
||||
kernels, if a high-priority process is starving RCU's softirq handler.
|
||||
|
||||
For CONFIG_RCU_FAST_NO_HZ kernels, the "last_accelerate:" prints the
|
||||
low-order 16 bits (in hex) of the jiffies counter when this CPU last
|
||||
invoked rcu_try_advance_all_cbs() from rcu_needs_cpu() or last invoked
|
||||
rcu_accelerate_cbs() from rcu_prepare_for_idle(). The "nonlazy_posted:"
|
||||
prints the number of non-lazy callbacks posted since the last call to
|
||||
rcu_needs_cpu(). Finally, an "L" indicates that there are currently
|
||||
no non-lazy callbacks ("." is printed otherwise, as shown above) and
|
||||
"D" indicates that dyntick-idle processing is enabled ("." is printed
|
||||
otherwise, for example, if disabled via the "nohz=" kernel boot parameter).
|
||||
The "fps=" shows the number of force-quiescent-state idle/offline
|
||||
detection passes that the grace-period kthread has made across this
|
||||
CPU since the last time that this CPU noted the beginning of a grace
|
||||
period.
|
||||
|
||||
The "detected by" line indicates which CPU detected the stall (in this
|
||||
case, CPU 32), how many jiffies have elapsed since the start of the
|
||||
grace period (in this case 2603), the number of the last grace period
|
||||
to start and to complete (7073 and 7072, respectively), and an estimate
|
||||
of the total number of RCU callbacks queued across all CPUs (625 in
|
||||
this case).
|
||||
|
||||
In kernels with CONFIG_RCU_FAST_NO_HZ, more information is printed
|
||||
for each CPU:
|
||||
|
||||
0: (64628 ticks this GP) idle=dd5/3fffffffffffffff/0 softirq=82/543 last_accelerate: a345/d342 nonlazy_posted: 25 .D
|
||||
|
||||
The "last_accelerate:" prints the low-order 16 bits (in hex) of the
|
||||
jiffies counter when this CPU last invoked rcu_try_advance_all_cbs()
|
||||
from rcu_needs_cpu() or last invoked rcu_accelerate_cbs() from
|
||||
rcu_prepare_for_idle(). The "nonlazy_posted:" prints the number
|
||||
of non-lazy callbacks posted since the last call to rcu_needs_cpu().
|
||||
Finally, an "L" indicates that there are currently no non-lazy callbacks
|
||||
("." is printed otherwise, as shown above) and "D" indicates that
|
||||
dyntick-idle processing is enabled ("." is printed otherwise, for example,
|
||||
if disabled via the "nohz=" kernel boot parameter).
|
||||
|
||||
If the grace period ends just as the stall warning starts printing,
|
||||
there will be a spurious stall-warning message, which will include
|
||||
the following:
|
||||
|
||||
INFO: Stall ended before state dump start
|
||||
|
||||
This is rare, but does happen from time to time in real life. It is also
|
||||
possible for a zero-jiffy stall to be flagged in this case, depending
|
||||
on how the stall warning and the grace-period initialization happen to
|
||||
interact. Please note that it is not possible to entirely eliminate this
|
||||
sort of false positive without resorting to things like stop_machine(),
|
||||
which is overkill for this sort of problem.
|
||||
|
||||
If all CPUs and tasks have passed through quiescent states, but the
|
||||
grace period has nevertheless failed to end, the stall-warning splat
|
||||
will include something like the following:
|
||||
|
||||
All QSes seen, last rcu_preempt kthread activity 23807 (4297905177-4297881370), jiffies_till_next_fqs=3, root ->qsmask 0x0
|
||||
|
||||
The "23807" indicates that it has been more than 23 thousand jiffies
|
||||
since the grace-period kthread ran. The "jiffies_till_next_fqs"
|
||||
indicates how frequently that kthread should run, giving the number
|
||||
of jiffies between force-quiescent-state scans, in this case three,
|
||||
which is way less than 23807. Finally, the root rcu_node structure's
|
||||
->qsmask field is printed, which will normally be zero.
|
||||
|
||||
If the relevant grace-period kthread has been unable to run prior to
|
||||
the stall warning, the following additional line is printed:
|
||||
the stall warning, as was the case in the "All QSes seen" line above,
|
||||
the following additional line is printed:
|
||||
|
||||
rcu_preempt kthread starved for 2023 jiffies!
|
||||
kthread starved for 23807 jiffies! g7073 c7072 f0x0 RCU_GP_WAIT_FQS(3) ->state=0x1
|
||||
|
||||
Starving the grace-period kthreads of CPU time can of course result in
|
||||
RCU CPU stall warnings even when all CPUs and tasks have passed through
|
||||
the required quiescent states.
|
||||
Starving the grace-period kthreads of CPU time can of course result
|
||||
in RCU CPU stall warnings even when all CPUs and tasks have passed
|
||||
through the required quiescent states. The "g" and "c" numbers flag the
|
||||
number of the last grace period started and completed, respectively,
|
||||
the "f" precedes the ->gp_flags command to the grace-period kthread,
|
||||
the "RCU_GP_WAIT_FQS" indicates that the kthread is waiting for a short
|
||||
timeout, and the "state" precedes value of the task_struct ->state field.
|
||||
|
||||
|
||||
Multiple Warnings From One Stall
|
||||
|
|
@ -264,13 +293,28 @@ Stall Warnings for Expedited Grace Periods
|
|||
If an expedited grace period detects a stall, it will place a message
|
||||
like the following in dmesg:
|
||||
|
||||
INFO: rcu_sched detected expedited stalls on CPUs: { 1 2 6 } 26009 jiffies s: 1043
|
||||
INFO: rcu_sched detected expedited stalls on CPUs/tasks: { 7-... } 21119 jiffies s: 73 root: 0x2/.
|
||||
|
||||
This indicates that CPUs 1, 2, and 6 have failed to respond to a
|
||||
reschedule IPI, that the expedited grace period has been going on for
|
||||
26,009 jiffies, and that the expedited grace-period sequence counter is
|
||||
1043. The fact that this last value is odd indicates that an expedited
|
||||
grace period is in flight.
|
||||
This indicates that CPU 7 has failed to respond to a reschedule IPI.
|
||||
The three periods (".") following the CPU number indicate that the CPU
|
||||
is online (otherwise the first period would instead have been "O"),
|
||||
that the CPU was online at the beginning of the expedited grace period
|
||||
(otherwise the second period would have instead been "o"), and that
|
||||
the CPU has been online at least once since boot (otherwise, the third
|
||||
period would instead have been "N"). The number before the "jiffies"
|
||||
indicates that the expedited grace period has been going on for 21,119
|
||||
jiffies. The number following the "s:" indicates that the expedited
|
||||
grace-period sequence counter is 73. The fact that this last value is
|
||||
odd indicates that an expedited grace period is in flight. The number
|
||||
following "root:" is a bitmask that indicates which children of the root
|
||||
rcu_node structure correspond to CPUs and/or tasks that are blocking the
|
||||
current expedited grace period. If the tree had more than one level,
|
||||
additional hex numbers would be printed for the states of the other
|
||||
rcu_node structures in the tree.
|
||||
|
||||
As with normal grace periods, PREEMPT_RCU builds can be stalled by
|
||||
tasks as well as by CPUs, and that the tasks will be indicated by PID,
|
||||
for example, "P3421".
|
||||
|
||||
It is entirely possible to see stall warnings from normal and from
|
||||
expedited grace periods at about the same time from the same run.
|
||||
expedited grace periods at about the same time during the same run.
|
||||
|
|
|
|||
|
|
@ -3542,6 +3542,9 @@
|
|||
rcutorture.stall_cpu_holdoff= [KNL]
|
||||
Time to wait (s) after boot before inducing stall.
|
||||
|
||||
rcutorture.stall_cpu_irqsoff= [KNL]
|
||||
Disable interrupts while stalling if set.
|
||||
|
||||
rcutorture.stat_interval= [KNL]
|
||||
Time (s) between statistics printk()s.
|
||||
|
||||
|
|
|
|||
|
|
@ -53,7 +53,7 @@ CONTENTS
|
|||
- SMP barrier pairing.
|
||||
- Examples of memory barrier sequences.
|
||||
- Read memory barriers vs load speculation.
|
||||
- Transitivity
|
||||
- Multicopy atomicity.
|
||||
|
||||
(*) Explicit kernel barriers.
|
||||
|
||||
|
|
@ -383,8 +383,8 @@ Memory barriers come in four basic varieties:
|
|||
to have any effect on loads.
|
||||
|
||||
A CPU can be viewed as committing a sequence of store operations to the
|
||||
memory system as time progresses. All stores before a write barrier will
|
||||
occur in the sequence _before_ all the stores after the write barrier.
|
||||
memory system as time progresses. All stores _before_ a write barrier
|
||||
will occur _before_ all the stores after the write barrier.
|
||||
|
||||
[!] Note that write barriers should normally be paired with read or data
|
||||
dependency barriers; see the "SMP barrier pairing" subsection.
|
||||
|
|
@ -635,6 +635,11 @@ can be used to record rare error conditions and the like, and the CPUs'
|
|||
naturally occurring ordering prevents such records from being lost.
|
||||
|
||||
|
||||
Note well that the ordering provided by a data dependency is local to
|
||||
the CPU containing it. See the section on "Multicopy atomicity" for
|
||||
more information.
|
||||
|
||||
|
||||
The data dependency barrier is very important to the RCU system,
|
||||
for example. See rcu_assign_pointer() and rcu_dereference() in
|
||||
include/linux/rcupdate.h. This permits the current target of an RCU'd
|
||||
|
|
@ -851,38 +856,11 @@ In short, control dependencies apply only to the stores in the then-clause
|
|||
and else-clause of the if-statement in question (including functions
|
||||
invoked by those two clauses), not to code following that if-statement.
|
||||
|
||||
Finally, control dependencies do -not- provide transitivity. This is
|
||||
demonstrated by two related examples, with the initial values of
|
||||
'x' and 'y' both being zero:
|
||||
|
||||
CPU 0 CPU 1
|
||||
======================= =======================
|
||||
r1 = READ_ONCE(x); r2 = READ_ONCE(y);
|
||||
if (r1 > 0) if (r2 > 0)
|
||||
WRITE_ONCE(y, 1); WRITE_ONCE(x, 1);
|
||||
Note well that the ordering provided by a control dependency is local
|
||||
to the CPU containing it. See the section on "Multicopy atomicity"
|
||||
for more information.
|
||||
|
||||
assert(!(r1 == 1 && r2 == 1));
|
||||
|
||||
The above two-CPU example will never trigger the assert(). However,
|
||||
if control dependencies guaranteed transitivity (which they do not),
|
||||
then adding the following CPU would guarantee a related assertion:
|
||||
|
||||
CPU 2
|
||||
=====================
|
||||
WRITE_ONCE(x, 2);
|
||||
|
||||
assert(!(r1 == 2 && r2 == 1 && x == 2)); /* FAILS!!! */
|
||||
|
||||
But because control dependencies do -not- provide transitivity, the above
|
||||
assertion can fail after the combined three-CPU example completes. If you
|
||||
need the three-CPU example to provide ordering, you will need smp_mb()
|
||||
between the loads and stores in the CPU 0 and CPU 1 code fragments,
|
||||
that is, just before or just after the "if" statements. Furthermore,
|
||||
the original two-CPU example is very fragile and should be avoided.
|
||||
|
||||
These two examples are the LB and WWC litmus tests from this paper:
|
||||
http://www.cl.cam.ac.uk/users/pes20/ppc-supplemental/test6.pdf and this
|
||||
site: https://www.cl.cam.ac.uk/~pes20/ppcmem/index.html.
|
||||
|
||||
In summary:
|
||||
|
||||
|
|
@ -922,8 +900,8 @@ In summary:
|
|||
|
||||
(*) Control dependencies pair normally with other types of barriers.
|
||||
|
||||
(*) Control dependencies do -not- provide transitivity. If you
|
||||
need transitivity, use smp_mb().
|
||||
(*) Control dependencies do -not- provide multicopy atomicity. If you
|
||||
need all the CPUs to see a given store at the same time, use smp_mb().
|
||||
|
||||
(*) Compilers do not understand control dependencies. It is therefore
|
||||
your job to ensure that they do not break your code.
|
||||
|
|
@ -936,13 +914,14 @@ When dealing with CPU-CPU interactions, certain types of memory barrier should
|
|||
always be paired. A lack of appropriate pairing is almost certainly an error.
|
||||
|
||||
General barriers pair with each other, though they also pair with most
|
||||
other types of barriers, albeit without transitivity. An acquire barrier
|
||||
pairs with a release barrier, but both may also pair with other barriers,
|
||||
including of course general barriers. A write barrier pairs with a data
|
||||
dependency barrier, a control dependency, an acquire barrier, a release
|
||||
barrier, a read barrier, or a general barrier. Similarly a read barrier,
|
||||
control dependency, or a data dependency barrier pairs with a write
|
||||
barrier, an acquire barrier, a release barrier, or a general barrier:
|
||||
other types of barriers, albeit without multicopy atomicity. An acquire
|
||||
barrier pairs with a release barrier, but both may also pair with other
|
||||
barriers, including of course general barriers. A write barrier pairs
|
||||
with a data dependency barrier, a control dependency, an acquire barrier,
|
||||
a release barrier, a read barrier, or a general barrier. Similarly a
|
||||
read barrier, control dependency, or a data dependency barrier pairs
|
||||
with a write barrier, an acquire barrier, a release barrier, or a
|
||||
general barrier:
|
||||
|
||||
CPU 1 CPU 2
|
||||
=============== ===============
|
||||
|
|
@ -968,7 +947,7 @@ Or even:
|
|||
=============== ===============================
|
||||
r1 = READ_ONCE(y);
|
||||
<general barrier>
|
||||
WRITE_ONCE(y, 1); if (r2 = READ_ONCE(x)) {
|
||||
WRITE_ONCE(x, 1); if (r2 = READ_ONCE(x)) {
|
||||
<implicit control dependency>
|
||||
WRITE_ONCE(y, 1);
|
||||
}
|
||||
|
|
@ -1359,64 +1338,79 @@ the speculation will be cancelled and the value reloaded:
|
|||
retrieved : : +-------+
|
||||
|
||||
|
||||
TRANSITIVITY
|
||||
------------
|
||||
MULTICOPY ATOMICITY
|
||||
--------------------
|
||||
|
||||
Transitivity is a deeply intuitive notion about ordering that is not
|
||||
always provided by real computer systems. The following example
|
||||
demonstrates transitivity:
|
||||
Multicopy atomicity is a deeply intuitive notion about ordering that is
|
||||
not always provided by real computer systems, namely that a given store
|
||||
becomes visible at the same time to all CPUs, or, alternatively, that all
|
||||
CPUs agree on the order in which all stores become visible. However,
|
||||
support of full multicopy atomicity would rule out valuable hardware
|
||||
optimizations, so a weaker form called ``other multicopy atomicity''
|
||||
instead guarantees only that a given store becomes visible at the same
|
||||
time to all -other- CPUs. The remainder of this document discusses this
|
||||
weaker form, but for brevity will call it simply ``multicopy atomicity''.
|
||||
|
||||
The following example demonstrates multicopy atomicity:
|
||||
|
||||
CPU 1 CPU 2 CPU 3
|
||||
======================= ======================= =======================
|
||||
{ X = 0, Y = 0 }
|
||||
STORE X=1 LOAD X STORE Y=1
|
||||
<general barrier> <general barrier>
|
||||
LOAD Y LOAD X
|
||||
STORE X=1 r1=LOAD X (reads 1) LOAD Y (reads 1)
|
||||
<general barrier> <read barrier>
|
||||
STORE Y=r1 LOAD X
|
||||
|
||||
Suppose that CPU 2's load from X returns 1 and its load from Y returns 0.
|
||||
This indicates that CPU 2's load from X in some sense follows CPU 1's
|
||||
store to X and that CPU 2's load from Y in some sense preceded CPU 3's
|
||||
store to Y. The question is then "Can CPU 3's load from X return 0?"
|
||||
Suppose that CPU 2's load from X returns 1, which it then stores to Y,
|
||||
and CPU 3's load from Y returns 1. This indicates that CPU 1's store
|
||||
to X precedes CPU 2's load from X and that CPU 2's store to Y precedes
|
||||
CPU 3's load from Y. In addition, the memory barriers guarantee that
|
||||
CPU 2 executes its load before its store, and CPU 3 loads from Y before
|
||||
it loads from X. The question is then "Can CPU 3's load from X return 0?"
|
||||
|
||||
Because CPU 2's load from X in some sense came after CPU 1's store, it
|
||||
Because CPU 3's load from X in some sense comes after CPU 2's load, it
|
||||
is natural to expect that CPU 3's load from X must therefore return 1.
|
||||
This expectation is an example of transitivity: if a load executing on
|
||||
CPU A follows a load from the same variable executing on CPU B, then
|
||||
CPU A's load must either return the same value that CPU B's load did,
|
||||
or must return some later value.
|
||||
This expectation follows from multicopy atomicity: if a load executing
|
||||
on CPU B follows a load from the same variable executing on CPU A (and
|
||||
CPU A did not originally store the value which it read), then on
|
||||
multicopy-atomic systems, CPU B's load must return either the same value
|
||||
that CPU A's load did or some later value. However, the Linux kernel
|
||||
does not require systems to be multicopy atomic.
|
||||
|
||||
In the Linux kernel, use of general memory barriers guarantees
|
||||
transitivity. Therefore, in the above example, if CPU 2's load from X
|
||||
returns 1 and its load from Y returns 0, then CPU 3's load from X must
|
||||
also return 1.
|
||||
The use of a general memory barrier in the example above compensates
|
||||
for any lack of multicopy atomicity. In the example, if CPU 2's load
|
||||
from X returns 1 and CPU 3's load from Y returns 1, then CPU 3's load
|
||||
from X must indeed also return 1.
|
||||
|
||||
However, transitivity is -not- guaranteed for read or write barriers.
|
||||
For example, suppose that CPU 2's general barrier in the above example
|
||||
is changed to a read barrier as shown below:
|
||||
However, dependencies, read barriers, and write barriers are not always
|
||||
able to compensate for non-multicopy atomicity. For example, suppose
|
||||
that CPU 2's general barrier is removed from the above example, leaving
|
||||
only the data dependency shown below:
|
||||
|
||||
CPU 1 CPU 2 CPU 3
|
||||
======================= ======================= =======================
|
||||
{ X = 0, Y = 0 }
|
||||
STORE X=1 LOAD X STORE Y=1
|
||||
<read barrier> <general barrier>
|
||||
LOAD Y LOAD X
|
||||
STORE X=1 r1=LOAD X (reads 1) LOAD Y (reads 1)
|
||||
<data dependency> <read barrier>
|
||||
STORE Y=r1 LOAD X (reads 0)
|
||||
|
||||
This substitution destroys transitivity: in this example, it is perfectly
|
||||
legal for CPU 2's load from X to return 1, its load from Y to return 0,
|
||||
and CPU 3's load from X to return 0.
|
||||
This substitution allows non-multicopy atomicity to run rampant: in
|
||||
this example, it is perfectly legal for CPU 2's load from X to return 1,
|
||||
CPU 3's load from Y to return 1, and its load from X to return 0.
|
||||
|
||||
The key point is that although CPU 2's read barrier orders its pair
|
||||
of loads, it does not guarantee to order CPU 1's store. Therefore, if
|
||||
this example runs on a system where CPUs 1 and 2 share a store buffer
|
||||
or a level of cache, CPU 2 might have early access to CPU 1's writes.
|
||||
General barriers are therefore required to ensure that all CPUs agree
|
||||
on the combined order of CPU 1's and CPU 2's accesses.
|
||||
The key point is that although CPU 2's data dependency orders its load
|
||||
and store, it does not guarantee to order CPU 1's store. Thus, if this
|
||||
example runs on a non-multicopy-atomic system where CPUs 1 and 2 share a
|
||||
store buffer or a level of cache, CPU 2 might have early access to CPU 1's
|
||||
writes. General barriers are therefore required to ensure that all CPUs
|
||||
agree on the combined order of multiple accesses.
|
||||
|
||||
General barriers provide "global transitivity", so that all CPUs will
|
||||
agree on the order of operations. In contrast, a chain of release-acquire
|
||||
pairs provides only "local transitivity", so that only those CPUs on
|
||||
the chain are guaranteed to agree on the combined order of the accesses.
|
||||
For example, switching to C code in deference to Herman Hollerith:
|
||||
General barriers can compensate not only for non-multicopy atomicity,
|
||||
but can also generate additional ordering that can ensure that -all-
|
||||
CPUs will perceive the same order of -all- operations. In contrast, a
|
||||
chain of release-acquire pairs do not provide this additional ordering,
|
||||
which means that only those CPUs on the chain are guaranteed to agree
|
||||
on the combined order of the accesses. For example, switching to C code
|
||||
in deference to the ghost of Herman Hollerith:
|
||||
|
||||
int u, v, x, y, z;
|
||||
|
||||
|
|
@ -1448,9 +1442,9 @@ For example, switching to C code in deference to Herman Hollerith:
|
|||
r3 = READ_ONCE(u);
|
||||
}
|
||||
|
||||
Because cpu0(), cpu1(), and cpu2() participate in a local transitive
|
||||
chain of smp_store_release()/smp_load_acquire() pairs, the following
|
||||
outcome is prohibited:
|
||||
Because cpu0(), cpu1(), and cpu2() participate in a chain of
|
||||
smp_store_release()/smp_load_acquire() pairs, the following outcome
|
||||
is prohibited:
|
||||
|
||||
r0 == 1 && r1 == 1 && r2 == 1
|
||||
|
||||
|
|
@ -1460,9 +1454,9 @@ outcome is prohibited:
|
|||
|
||||
r1 == 1 && r5 == 0
|
||||
|
||||
However, the transitivity of release-acquire is local to the participating
|
||||
CPUs and does not apply to cpu3(). Therefore, the following outcome
|
||||
is possible:
|
||||
However, the ordering provided by a release-acquire chain is local
|
||||
to the CPUs participating in that chain and does not apply to cpu3(),
|
||||
at least aside from stores. Therefore, the following outcome is possible:
|
||||
|
||||
r0 == 0 && r1 == 1 && r2 == 1 && r3 == 0 && r4 == 0
|
||||
|
||||
|
|
@ -1490,8 +1484,8 @@ following outcome is possible:
|
|||
Note that this outcome can happen even on a mythical sequentially
|
||||
consistent system where nothing is ever reordered.
|
||||
|
||||
To reiterate, if your code requires global transitivity, use general
|
||||
barriers throughout.
|
||||
To reiterate, if your code requires full ordering of all operations,
|
||||
use general barriers throughout.
|
||||
|
||||
|
||||
========================
|
||||
|
|
@ -3101,6 +3095,9 @@ AMD64 Architecture Programmer's Manual Volume 2: System Programming
|
|||
Chapter 7.1: Memory-Access Ordering
|
||||
Chapter 7.4: Buffering and Combining Memory Writes
|
||||
|
||||
ARM Architecture Reference Manual (ARMv8, for ARMv8-A architecture profile)
|
||||
Chapter B2: The AArch64 Application Level Memory Model
|
||||
|
||||
IA-32 Intel Architecture Software Developer's Manual, Volume 3:
|
||||
System Programming Guide
|
||||
Chapter 7.1: Locked Atomic Operations
|
||||
|
|
@ -3112,6 +3109,8 @@ The SPARC Architecture Manual, Version 9
|
|||
Appendix D: Formal Specification of the Memory Models
|
||||
Appendix J: Programming with the Memory Models
|
||||
|
||||
Storage in the PowerPC (Stone and Fitzgerald)
|
||||
|
||||
UltraSPARC Programmer Reference Manual
|
||||
Chapter 5: Memory Accesses and Cacheability
|
||||
Chapter 15: Sparc-V9 Memory Models
|
||||
|
|
|
|||
|
|
@ -34,10 +34,7 @@ void init_irq_work(struct irq_work *work, void (*func)(struct irq_work *))
|
|||
#define DEFINE_IRQ_WORK(name, _f) struct irq_work name = { .func = (_f), }
|
||||
|
||||
bool irq_work_queue(struct irq_work *work);
|
||||
|
||||
#ifdef CONFIG_SMP
|
||||
bool irq_work_queue_on(struct irq_work *work, int cpu);
|
||||
#endif
|
||||
|
||||
void irq_work_tick(void);
|
||||
void irq_work_sync(struct irq_work *work);
|
||||
|
|
|
|||
|
|
@ -56,7 +56,6 @@ void __weak arch_irq_work_raise(void)
|
|||
*/
|
||||
}
|
||||
|
||||
#ifdef CONFIG_SMP
|
||||
/*
|
||||
* Enqueue the irq_work @work on @cpu unless it's already pending
|
||||
* somewhere.
|
||||
|
|
@ -68,6 +67,8 @@ bool irq_work_queue_on(struct irq_work *work, int cpu)
|
|||
/* All work should have been flushed before going offline */
|
||||
WARN_ON_ONCE(cpu_is_offline(cpu));
|
||||
|
||||
#ifdef CONFIG_SMP
|
||||
|
||||
/* Arch remote IPI send/receive backend aren't NMI safe */
|
||||
WARN_ON_ONCE(in_nmi());
|
||||
|
||||
|
|
@ -78,10 +79,12 @@ bool irq_work_queue_on(struct irq_work *work, int cpu)
|
|||
if (llist_add(&work->llnode, &per_cpu(raised_list, cpu)))
|
||||
arch_send_call_function_single_ipi(cpu);
|
||||
|
||||
#else /* #ifdef CONFIG_SMP */
|
||||
irq_work_queue(work);
|
||||
#endif /* #else #ifdef CONFIG_SMP */
|
||||
|
||||
return true;
|
||||
}
|
||||
EXPORT_SYMBOL_GPL(irq_work_queue_on);
|
||||
#endif
|
||||
|
||||
/* Enqueue the irq work @work on the current CPU */
|
||||
bool irq_work_queue(struct irq_work *work)
|
||||
|
|
|
|||
|
|
@ -203,6 +203,21 @@ static inline bool __rcu_reclaim(const char *rn, struct rcu_head *head)
|
|||
extern int rcu_cpu_stall_suppress;
|
||||
int rcu_jiffies_till_stall_check(void);
|
||||
|
||||
#define rcu_ftrace_dump_stall_suppress() \
|
||||
do { \
|
||||
if (!rcu_cpu_stall_suppress) \
|
||||
rcu_cpu_stall_suppress = 3; \
|
||||
} while (0)
|
||||
|
||||
#define rcu_ftrace_dump_stall_unsuppress() \
|
||||
do { \
|
||||
if (rcu_cpu_stall_suppress == 3) \
|
||||
rcu_cpu_stall_suppress = 0; \
|
||||
} while (0)
|
||||
|
||||
#else /* #endif #ifdef CONFIG_RCU_STALL_COMMON */
|
||||
#define rcu_ftrace_dump_stall_suppress()
|
||||
#define rcu_ftrace_dump_stall_unsuppress()
|
||||
#endif /* #ifdef CONFIG_RCU_STALL_COMMON */
|
||||
|
||||
/*
|
||||
|
|
@ -220,8 +235,12 @@ do { \
|
|||
static atomic_t ___rfd_beenhere = ATOMIC_INIT(0); \
|
||||
\
|
||||
if (!atomic_read(&___rfd_beenhere) && \
|
||||
!atomic_xchg(&___rfd_beenhere, 1)) \
|
||||
!atomic_xchg(&___rfd_beenhere, 1)) { \
|
||||
tracing_off(); \
|
||||
rcu_ftrace_dump_stall_suppress(); \
|
||||
ftrace_dump(oops_dump_mode); \
|
||||
rcu_ftrace_dump_stall_unsuppress(); \
|
||||
} \
|
||||
} while (0)
|
||||
|
||||
void rcu_early_boot_tests(void);
|
||||
|
|
|
|||
|
|
@ -23,6 +23,7 @@
|
|||
#include <linux/types.h>
|
||||
#include <linux/kernel.h>
|
||||
#include <linux/interrupt.h>
|
||||
#include <linux/rcupdate.h>
|
||||
|
||||
#include "rcu_segcblist.h"
|
||||
|
||||
|
|
|
|||
|
|
@ -51,6 +51,7 @@
|
|||
#include <asm/byteorder.h>
|
||||
#include <linux/torture.h>
|
||||
#include <linux/vmalloc.h>
|
||||
#include <linux/sched/debug.h>
|
||||
|
||||
#include "rcu.h"
|
||||
|
||||
|
|
@ -89,6 +90,7 @@ torture_param(int, shutdown_secs, 0, "Shutdown time (s), <= zero to disable.");
|
|||
torture_param(int, stall_cpu, 0, "Stall duration (s), zero to disable.");
|
||||
torture_param(int, stall_cpu_holdoff, 10,
|
||||
"Time to wait before starting stall (s).");
|
||||
torture_param(int, stall_cpu_irqsoff, 0, "Disable interrupts while stalling.");
|
||||
torture_param(int, stat_interval, 60,
|
||||
"Number of seconds between stats printk()s");
|
||||
torture_param(int, stutter, 5, "Number of seconds to run/halt test");
|
||||
|
|
@ -1239,6 +1241,7 @@ rcu_torture_stats_print(void)
|
|||
long pipesummary[RCU_TORTURE_PIPE_LEN + 1] = { 0 };
|
||||
long batchsummary[RCU_TORTURE_PIPE_LEN + 1] = { 0 };
|
||||
static unsigned long rtcv_snap = ULONG_MAX;
|
||||
static bool splatted;
|
||||
struct task_struct *wtp;
|
||||
|
||||
for_each_possible_cpu(cpu) {
|
||||
|
|
@ -1324,6 +1327,10 @@ rcu_torture_stats_print(void)
|
|||
gpnum, completed, flags,
|
||||
wtp == NULL ? ~0UL : wtp->state,
|
||||
wtp == NULL ? -1 : (int)task_cpu(wtp));
|
||||
if (!splatted && wtp) {
|
||||
sched_show_task(wtp);
|
||||
splatted = true;
|
||||
}
|
||||
show_rcu_gp_kthreads();
|
||||
rcu_ftrace_dump(DUMP_ALL);
|
||||
}
|
||||
|
|
@ -1357,7 +1364,7 @@ rcu_torture_print_module_parms(struct rcu_torture_ops *cur_ops, const char *tag)
|
|||
"fqs_duration=%d fqs_holdoff=%d fqs_stutter=%d "
|
||||
"test_boost=%d/%d test_boost_interval=%d "
|
||||
"test_boost_duration=%d shutdown_secs=%d "
|
||||
"stall_cpu=%d stall_cpu_holdoff=%d "
|
||||
"stall_cpu=%d stall_cpu_holdoff=%d stall_cpu_irqsoff=%d "
|
||||
"n_barrier_cbs=%d "
|
||||
"onoff_interval=%d onoff_holdoff=%d\n",
|
||||
torture_type, tag, nrealreaders, nfakewriters,
|
||||
|
|
@ -1365,7 +1372,7 @@ rcu_torture_print_module_parms(struct rcu_torture_ops *cur_ops, const char *tag)
|
|||
stutter, irqreader, fqs_duration, fqs_holdoff, fqs_stutter,
|
||||
test_boost, cur_ops->can_boost,
|
||||
test_boost_interval, test_boost_duration, shutdown_secs,
|
||||
stall_cpu, stall_cpu_holdoff,
|
||||
stall_cpu, stall_cpu_holdoff, stall_cpu_irqsoff,
|
||||
n_barrier_cbs,
|
||||
onoff_interval, onoff_holdoff);
|
||||
}
|
||||
|
|
@ -1430,12 +1437,19 @@ static int rcu_torture_stall(void *args)
|
|||
if (!kthread_should_stop()) {
|
||||
stop_at = get_seconds() + stall_cpu;
|
||||
/* RCU CPU stall is expected behavior in following code. */
|
||||
pr_alert("rcu_torture_stall start.\n");
|
||||
rcu_read_lock();
|
||||
preempt_disable();
|
||||
if (stall_cpu_irqsoff)
|
||||
local_irq_disable();
|
||||
else
|
||||
preempt_disable();
|
||||
pr_alert("rcu_torture_stall start on CPU %d.\n",
|
||||
smp_processor_id());
|
||||
while (ULONG_CMP_LT(get_seconds(), stop_at))
|
||||
continue; /* Induce RCU CPU stall warning. */
|
||||
preempt_enable();
|
||||
if (stall_cpu_irqsoff)
|
||||
local_irq_enable();
|
||||
else
|
||||
preempt_enable();
|
||||
rcu_read_unlock();
|
||||
pr_alert("rcu_torture_stall end.\n");
|
||||
}
|
||||
|
|
|
|||
|
|
@ -534,8 +534,8 @@ module_param(rcu_kick_kthreads, bool, 0644);
|
|||
* How long the grace period must be before we start recruiting
|
||||
* quiescent-state help from rcu_note_context_switch().
|
||||
*/
|
||||
static ulong jiffies_till_sched_qs = HZ / 20;
|
||||
module_param(jiffies_till_sched_qs, ulong, 0644);
|
||||
static ulong jiffies_till_sched_qs = HZ / 10;
|
||||
module_param(jiffies_till_sched_qs, ulong, 0444);
|
||||
|
||||
static bool rcu_start_gp_advanced(struct rcu_state *rsp, struct rcu_node *rnp,
|
||||
struct rcu_data *rdp);
|
||||
|
|
@ -837,6 +837,9 @@ static void rcu_eqs_enter(bool user)
|
|||
* We crowbar the ->dynticks_nesting field to zero to allow for
|
||||
* the possibility of usermode upcalls having messed up our count
|
||||
* of interrupt nesting level during the prior busy period.
|
||||
*
|
||||
* If you add or remove a call to rcu_idle_enter(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_idle_enter(void)
|
||||
{
|
||||
|
|
@ -852,6 +855,9 @@ void rcu_idle_enter(void)
|
|||
* is permitted between this call and rcu_user_exit(). This way the
|
||||
* CPU doesn't need to maintain the tick for RCU maintenance purposes
|
||||
* when the CPU runs in userspace.
|
||||
*
|
||||
* If you add or remove a call to rcu_user_enter(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_user_enter(void)
|
||||
{
|
||||
|
|
@ -875,6 +881,9 @@ void rcu_user_enter(void)
|
|||
* Use things like work queues to work around this limitation.
|
||||
*
|
||||
* You have been warned.
|
||||
*
|
||||
* If you add or remove a call to rcu_irq_exit(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_irq_exit(void)
|
||||
{
|
||||
|
|
@ -899,6 +908,9 @@ void rcu_irq_exit(void)
|
|||
|
||||
/*
|
||||
* Wrapper for rcu_irq_exit() where interrupts are enabled.
|
||||
*
|
||||
* If you add or remove a call to rcu_irq_exit_irqson(), be sure to test
|
||||
* with CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_irq_exit_irqson(void)
|
||||
{
|
||||
|
|
@ -971,6 +983,9 @@ static void rcu_eqs_exit(bool user)
|
|||
* allow for the possibility of usermode upcalls messing up our count
|
||||
* of interrupt nesting level during the busy period that is just
|
||||
* now starting.
|
||||
*
|
||||
* If you add or remove a call to rcu_idle_exit(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_idle_exit(void)
|
||||
{
|
||||
|
|
@ -987,6 +1002,9 @@ void rcu_idle_exit(void)
|
|||
*
|
||||
* Exit RCU idle mode while entering the kernel because it can
|
||||
* run a RCU read side critical section anytime.
|
||||
*
|
||||
* If you add or remove a call to rcu_user_exit(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_user_exit(void)
|
||||
{
|
||||
|
|
@ -1012,6 +1030,9 @@ void rcu_user_exit(void)
|
|||
* Use things like work queues to work around this limitation.
|
||||
*
|
||||
* You have been warned.
|
||||
*
|
||||
* If you add or remove a call to rcu_irq_enter(), be sure to test with
|
||||
* CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_irq_enter(void)
|
||||
{
|
||||
|
|
@ -1037,6 +1058,9 @@ void rcu_irq_enter(void)
|
|||
|
||||
/*
|
||||
* Wrapper for rcu_irq_enter() where interrupts are enabled.
|
||||
*
|
||||
* If you add or remove a call to rcu_irq_enter_irqson(), be sure to test
|
||||
* with CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_irq_enter_irqson(void)
|
||||
{
|
||||
|
|
@ -1055,6 +1079,9 @@ void rcu_irq_enter_irqson(void)
|
|||
* that the CPU is active. This implementation permits nested NMIs, as
|
||||
* long as the nesting level does not overflow an int. (You will probably
|
||||
* run out of stack space first.)
|
||||
*
|
||||
* If you add or remove a call to rcu_nmi_enter(), be sure to test
|
||||
* with CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_nmi_enter(void)
|
||||
{
|
||||
|
|
@ -1087,6 +1114,9 @@ void rcu_nmi_enter(void)
|
|||
* RCU-idle period, update rdtp->dynticks and rdtp->dynticks_nmi_nesting
|
||||
* to let the RCU grace-period handling know that the CPU is back to
|
||||
* being RCU-idle.
|
||||
*
|
||||
* If you add or remove a call to rcu_nmi_exit(), be sure to test
|
||||
* with CONFIG_RCU_EQS_DEBUG=y.
|
||||
*/
|
||||
void rcu_nmi_exit(void)
|
||||
{
|
||||
|
|
@ -1206,6 +1236,22 @@ static int rcu_is_cpu_rrupt_from_idle(void)
|
|||
return __this_cpu_read(rcu_dynticks.dynticks_nesting) <= 1;
|
||||
}
|
||||
|
||||
/*
|
||||
* We are reporting a quiescent state on behalf of some other CPU, so
|
||||
* it is our responsibility to check for and handle potential overflow
|
||||
* of the rcu_node ->gpnum counter with respect to the rcu_data counters.
|
||||
* After all, the CPU might be in deep idle state, and thus executing no
|
||||
* code whatsoever.
|
||||
*/
|
||||
static void rcu_gpnum_ovf(struct rcu_node *rnp, struct rcu_data *rdp)
|
||||
{
|
||||
lockdep_assert_held(&rnp->lock);
|
||||
if (ULONG_CMP_LT(READ_ONCE(rdp->gpnum) + ULONG_MAX / 4, rnp->gpnum))
|
||||
WRITE_ONCE(rdp->gpwrap, true);
|
||||
if (ULONG_CMP_LT(rdp->rcu_iw_gpnum + ULONG_MAX / 4, rnp->gpnum))
|
||||
rdp->rcu_iw_gpnum = rnp->gpnum + ULONG_MAX / 4;
|
||||
}
|
||||
|
||||
/*
|
||||
* Snapshot the specified CPU's dynticks counter so that we can later
|
||||
* credit them with an implicit quiescent state. Return 1 if this CPU
|
||||
|
|
@ -1216,14 +1262,33 @@ static int dyntick_save_progress_counter(struct rcu_data *rdp)
|
|||
rdp->dynticks_snap = rcu_dynticks_snap(rdp->dynticks);
|
||||
if (rcu_dynticks_in_eqs(rdp->dynticks_snap)) {
|
||||
trace_rcu_fqs(rdp->rsp->name, rdp->gpnum, rdp->cpu, TPS("dti"));
|
||||
if (ULONG_CMP_LT(READ_ONCE(rdp->gpnum) + ULONG_MAX / 4,
|
||||
rdp->mynode->gpnum))
|
||||
WRITE_ONCE(rdp->gpwrap, true);
|
||||
rcu_gpnum_ovf(rdp->mynode, rdp);
|
||||
return 1;
|
||||
}
|
||||
return 0;
|
||||
}
|
||||
|
||||
/*
|
||||
* Handler for the irq_work request posted when a grace period has
|
||||
* gone on for too long, but not yet long enough for an RCU CPU
|
||||
* stall warning. Set state appropriately, but just complain if
|
||||
* there is unexpected state on entry.
|
||||
*/
|
||||
static void rcu_iw_handler(struct irq_work *iwp)
|
||||
{
|
||||
struct rcu_data *rdp;
|
||||
struct rcu_node *rnp;
|
||||
|
||||
rdp = container_of(iwp, struct rcu_data, rcu_iw);
|
||||
rnp = rdp->mynode;
|
||||
raw_spin_lock_rcu_node(rnp);
|
||||
if (!WARN_ON_ONCE(!rdp->rcu_iw_pending)) {
|
||||
rdp->rcu_iw_gpnum = rnp->gpnum;
|
||||
rdp->rcu_iw_pending = false;
|
||||
}
|
||||
raw_spin_unlock_rcu_node(rnp);
|
||||
}
|
||||
|
||||
/*
|
||||
* Return true if the specified CPU has passed through a quiescent
|
||||
* state by virtue of being in or having passed through an dynticks
|
||||
|
|
@ -1235,8 +1300,7 @@ static int rcu_implicit_dynticks_qs(struct rcu_data *rdp)
|
|||
unsigned long jtsq;
|
||||
bool *rnhqp;
|
||||
bool *ruqp;
|
||||
unsigned long rjtsc;
|
||||
struct rcu_node *rnp;
|
||||
struct rcu_node *rnp = rdp->mynode;
|
||||
|
||||
/*
|
||||
* If the CPU passed through or entered a dynticks idle phase with
|
||||
|
|
@ -1249,34 +1313,25 @@ static int rcu_implicit_dynticks_qs(struct rcu_data *rdp)
|
|||
if (rcu_dynticks_in_eqs_since(rdp->dynticks, rdp->dynticks_snap)) {
|
||||
trace_rcu_fqs(rdp->rsp->name, rdp->gpnum, rdp->cpu, TPS("dti"));
|
||||
rdp->dynticks_fqs++;
|
||||
rcu_gpnum_ovf(rnp, rdp);
|
||||
return 1;
|
||||
}
|
||||
|
||||
/* Compute and saturate jiffies_till_sched_qs. */
|
||||
jtsq = jiffies_till_sched_qs;
|
||||
rjtsc = rcu_jiffies_till_stall_check();
|
||||
if (jtsq > rjtsc / 2) {
|
||||
WRITE_ONCE(jiffies_till_sched_qs, rjtsc);
|
||||
jtsq = rjtsc / 2;
|
||||
} else if (jtsq < 1) {
|
||||
WRITE_ONCE(jiffies_till_sched_qs, 1);
|
||||
jtsq = 1;
|
||||
}
|
||||
|
||||
/*
|
||||
* Has this CPU encountered a cond_resched_rcu_qs() since the
|
||||
* beginning of the grace period? For this to be the case,
|
||||
* the CPU has to have noticed the current grace period. This
|
||||
* might not be the case for nohz_full CPUs looping in the kernel.
|
||||
*/
|
||||
rnp = rdp->mynode;
|
||||
jtsq = jiffies_till_sched_qs;
|
||||
ruqp = per_cpu_ptr(&rcu_dynticks.rcu_urgent_qs, rdp->cpu);
|
||||
if (time_after(jiffies, rdp->rsp->gp_start + jtsq) &&
|
||||
READ_ONCE(rdp->rcu_qs_ctr_snap) != per_cpu(rcu_dynticks.rcu_qs_ctr, rdp->cpu) &&
|
||||
READ_ONCE(rdp->gpnum) == rnp->gpnum && !rdp->gpwrap) {
|
||||
trace_rcu_fqs(rdp->rsp->name, rdp->gpnum, rdp->cpu, TPS("rqc"));
|
||||
rcu_gpnum_ovf(rnp, rdp);
|
||||
return 1;
|
||||
} else {
|
||||
} else if (time_after(jiffies, rdp->rsp->gp_start + jtsq)) {
|
||||
/* Load rcu_qs_ctr before store to rcu_urgent_qs. */
|
||||
smp_store_release(ruqp, true);
|
||||
}
|
||||
|
|
@ -1285,6 +1340,7 @@ static int rcu_implicit_dynticks_qs(struct rcu_data *rdp)
|
|||
if (!(rdp->grpmask & rcu_rnp_online_cpus(rnp))) {
|
||||
trace_rcu_fqs(rdp->rsp->name, rdp->gpnum, rdp->cpu, TPS("ofl"));
|
||||
rdp->offline_fqs++;
|
||||
rcu_gpnum_ovf(rnp, rdp);
|
||||
return 1;
|
||||
}
|
||||
|
||||
|
|
@ -1304,10 +1360,6 @@ static int rcu_implicit_dynticks_qs(struct rcu_data *rdp)
|
|||
* updates are only once every few jiffies, the probability of
|
||||
* lossage (and thus of slight grace-period extension) is
|
||||
* quite low.
|
||||
*
|
||||
* Note that if the jiffies_till_sched_qs boot/sysfs parameter
|
||||
* is set too high, we override with half of the RCU CPU stall
|
||||
* warning delay.
|
||||
*/
|
||||
rnhqp = &per_cpu(rcu_dynticks.rcu_need_heavy_qs, rdp->cpu);
|
||||
if (!READ_ONCE(*rnhqp) &&
|
||||
|
|
@ -1316,15 +1368,26 @@ static int rcu_implicit_dynticks_qs(struct rcu_data *rdp)
|
|||
WRITE_ONCE(*rnhqp, true);
|
||||
/* Store rcu_need_heavy_qs before rcu_urgent_qs. */
|
||||
smp_store_release(ruqp, true);
|
||||
rdp->rsp->jiffies_resched += 5; /* Re-enable beating. */
|
||||
rdp->rsp->jiffies_resched += jtsq; /* Re-enable beating. */
|
||||
}
|
||||
|
||||
/*
|
||||
* If more than halfway to RCU CPU stall-warning time, do
|
||||
* a resched_cpu() to try to loosen things up a bit.
|
||||
* If more than halfway to RCU CPU stall-warning time, do a
|
||||
* resched_cpu() to try to loosen things up a bit. Also check to
|
||||
* see if the CPU is getting hammered with interrupts, but only
|
||||
* once per grace period, just to keep the IPIs down to a dull roar.
|
||||
*/
|
||||
if (jiffies - rdp->rsp->gp_start > rcu_jiffies_till_stall_check() / 2)
|
||||
if (jiffies - rdp->rsp->gp_start > rcu_jiffies_till_stall_check() / 2) {
|
||||
resched_cpu(rdp->cpu);
|
||||
if (IS_ENABLED(CONFIG_IRQ_WORK) &&
|
||||
!rdp->rcu_iw_pending && rdp->rcu_iw_gpnum != rnp->gpnum &&
|
||||
(rnp->ffmask & rdp->grpmask)) {
|
||||
init_irq_work(&rdp->rcu_iw, rcu_iw_handler);
|
||||
rdp->rcu_iw_pending = true;
|
||||
rdp->rcu_iw_gpnum = rnp->gpnum;
|
||||
irq_work_queue_on(&rdp->rcu_iw, rdp->cpu);
|
||||
}
|
||||
}
|
||||
|
||||
return 0;
|
||||
}
|
||||
|
|
@ -1513,6 +1576,7 @@ static void print_cpu_stall(struct rcu_state *rsp)
|
|||
{
|
||||
int cpu;
|
||||
unsigned long flags;
|
||||
struct rcu_data *rdp = this_cpu_ptr(rsp->rda);
|
||||
struct rcu_node *rnp = rcu_get_root(rsp);
|
||||
long totqlen = 0;
|
||||
|
||||
|
|
@ -1528,7 +1592,9 @@ static void print_cpu_stall(struct rcu_state *rsp)
|
|||
*/
|
||||
pr_err("INFO: %s self-detected stall on CPU", rsp->name);
|
||||
print_cpu_stall_info_begin();
|
||||
raw_spin_lock_irqsave_rcu_node(rdp->mynode, flags);
|
||||
print_cpu_stall_info(rsp, smp_processor_id());
|
||||
raw_spin_unlock_irqrestore_rcu_node(rdp->mynode, flags);
|
||||
print_cpu_stall_info_end();
|
||||
for_each_possible_cpu(cpu)
|
||||
totqlen += rcu_segcblist_n_cbs(&per_cpu_ptr(rsp->rda,
|
||||
|
|
@ -1922,6 +1988,7 @@ static bool __note_gp_changes(struct rcu_state *rsp, struct rcu_node *rnp,
|
|||
rdp->core_needs_qs = need_gp;
|
||||
zero_cpu_stall_ticks(rdp);
|
||||
WRITE_ONCE(rdp->gpwrap, false);
|
||||
rcu_gpnum_ovf(rnp, rdp);
|
||||
}
|
||||
return ret;
|
||||
}
|
||||
|
|
@ -3702,6 +3769,8 @@ rcu_init_percpu_data(int cpu, struct rcu_state *rsp)
|
|||
rdp->cpu_no_qs.b.norm = true;
|
||||
rdp->rcu_qs_ctr_snap = per_cpu(rcu_dynticks.rcu_qs_ctr, cpu);
|
||||
rdp->core_needs_qs = false;
|
||||
rdp->rcu_iw_pending = false;
|
||||
rdp->rcu_iw_gpnum = rnp->gpnum - 1;
|
||||
trace_rcu_grace_period(rsp->name, rdp->gpnum, TPS("cpuonl"));
|
||||
raw_spin_unlock_irqrestore_rcu_node(rnp, flags);
|
||||
}
|
||||
|
|
@ -3739,10 +3808,24 @@ static void rcutree_affinity_setting(unsigned int cpu, int outgoing)
|
|||
*/
|
||||
int rcutree_online_cpu(unsigned int cpu)
|
||||
{
|
||||
sync_sched_exp_online_cleanup(cpu);
|
||||
rcutree_affinity_setting(cpu, -1);
|
||||
unsigned long flags;
|
||||
struct rcu_data *rdp;
|
||||
struct rcu_node *rnp;
|
||||
struct rcu_state *rsp;
|
||||
|
||||
for_each_rcu_flavor(rsp) {
|
||||
rdp = per_cpu_ptr(rsp->rda, cpu);
|
||||
rnp = rdp->mynode;
|
||||
raw_spin_lock_irqsave_rcu_node(rnp, flags);
|
||||
rnp->ffmask |= rdp->grpmask;
|
||||
raw_spin_unlock_irqrestore_rcu_node(rnp, flags);
|
||||
}
|
||||
if (IS_ENABLED(CONFIG_TREE_SRCU))
|
||||
srcu_online_cpu(cpu);
|
||||
if (rcu_scheduler_active == RCU_SCHEDULER_INACTIVE)
|
||||
return 0; /* Too early in boot for scheduler work. */
|
||||
sync_sched_exp_online_cleanup(cpu);
|
||||
rcutree_affinity_setting(cpu, -1);
|
||||
return 0;
|
||||
}
|
||||
|
||||
|
|
@ -3752,6 +3835,19 @@ int rcutree_online_cpu(unsigned int cpu)
|
|||
*/
|
||||
int rcutree_offline_cpu(unsigned int cpu)
|
||||
{
|
||||
unsigned long flags;
|
||||
struct rcu_data *rdp;
|
||||
struct rcu_node *rnp;
|
||||
struct rcu_state *rsp;
|
||||
|
||||
for_each_rcu_flavor(rsp) {
|
||||
rdp = per_cpu_ptr(rsp->rda, cpu);
|
||||
rnp = rdp->mynode;
|
||||
raw_spin_lock_irqsave_rcu_node(rnp, flags);
|
||||
rnp->ffmask &= ~rdp->grpmask;
|
||||
raw_spin_unlock_irqrestore_rcu_node(rnp, flags);
|
||||
}
|
||||
|
||||
rcutree_affinity_setting(cpu, cpu);
|
||||
if (IS_ENABLED(CONFIG_TREE_SRCU))
|
||||
srcu_offline_cpu(cpu);
|
||||
|
|
@ -4200,8 +4296,7 @@ void __init rcu_init(void)
|
|||
for_each_online_cpu(cpu) {
|
||||
rcutree_prepare_cpu(cpu);
|
||||
rcu_cpu_starting(cpu);
|
||||
if (IS_ENABLED(CONFIG_TREE_SRCU))
|
||||
srcu_online_cpu(cpu);
|
||||
rcutree_online_cpu(cpu);
|
||||
}
|
||||
}
|
||||
|
||||
|
|
|
|||
|
|
@ -103,6 +103,7 @@ struct rcu_node {
|
|||
/* Online CPUs for next expedited GP. */
|
||||
/* Any CPU that has ever been online will */
|
||||
/* have its bit set. */
|
||||
unsigned long ffmask; /* Fully functional CPUs. */
|
||||
unsigned long grpmask; /* Mask to apply to parent qsmask. */
|
||||
/* Only one bit will be set in this mask. */
|
||||
int grplo; /* lowest-numbered CPU or group here. */
|
||||
|
|
@ -285,6 +286,10 @@ struct rcu_data {
|
|||
|
||||
/* 8) RCU CPU stall data. */
|
||||
unsigned int softirq_snap; /* Snapshot of softirq activity. */
|
||||
/* ->rcu_iw* fields protected by leaf rcu_node ->lock. */
|
||||
struct irq_work rcu_iw; /* Check for non-irq activity. */
|
||||
bool rcu_iw_pending; /* Is ->rcu_iw pending? */
|
||||
unsigned long rcu_iw_gpnum; /* ->gpnum associated with ->rcu_iw. */
|
||||
|
||||
int cpu;
|
||||
struct rcu_state *rsp;
|
||||
|
|
|
|||
|
|
@ -54,6 +54,7 @@ DEFINE_PER_CPU(char, rcu_cpu_has_work);
|
|||
* This probably needs to be excluded from -rt builds.
|
||||
*/
|
||||
#define rt_mutex_owner(a) ({ WARN_ON_ONCE(1); NULL; })
|
||||
#define rt_mutex_futex_unlock(x) WARN_ON_ONCE(1)
|
||||
|
||||
#endif /* #else #ifdef CONFIG_RCU_BOOST */
|
||||
|
||||
|
|
@ -530,7 +531,7 @@ void rcu_read_unlock_special(struct task_struct *t)
|
|||
|
||||
/* Unboost if we were boosted. */
|
||||
if (IS_ENABLED(CONFIG_RCU_BOOST) && drop_boost_mutex)
|
||||
rt_mutex_unlock(&rnp->boost_mtx);
|
||||
rt_mutex_futex_unlock(&rnp->boost_mtx);
|
||||
|
||||
/*
|
||||
* If this was the last task on the expedited lists,
|
||||
|
|
@ -911,8 +912,6 @@ void exit_rcu(void)
|
|||
|
||||
#ifdef CONFIG_RCU_BOOST
|
||||
|
||||
#include "../locking/rtmutex_common.h"
|
||||
|
||||
static void rcu_wake_cond(struct task_struct *t, int status)
|
||||
{
|
||||
/*
|
||||
|
|
@ -1507,7 +1506,7 @@ static void rcu_prepare_for_idle(void)
|
|||
rdtp->last_accelerate = jiffies;
|
||||
for_each_rcu_flavor(rsp) {
|
||||
rdp = this_cpu_ptr(rsp->rda);
|
||||
if (rcu_segcblist_pend_cbs(&rdp->cblist))
|
||||
if (!rcu_segcblist_pend_cbs(&rdp->cblist))
|
||||
continue;
|
||||
rnp = rdp->mynode;
|
||||
raw_spin_lock_rcu_node(rnp); /* irqs already disabled. */
|
||||
|
|
@ -1671,6 +1670,7 @@ static void print_cpu_stall_info_begin(void)
|
|||
*/
|
||||
static void print_cpu_stall_info(struct rcu_state *rsp, int cpu)
|
||||
{
|
||||
unsigned long delta;
|
||||
char fast_no_hz[72];
|
||||
struct rcu_data *rdp = per_cpu_ptr(rsp->rda, cpu);
|
||||
struct rcu_dynticks *rdtp = rdp->dynticks;
|
||||
|
|
@ -1685,11 +1685,15 @@ static void print_cpu_stall_info(struct rcu_state *rsp, int cpu)
|
|||
ticks_value = rsp->gpnum - rdp->gpnum;
|
||||
}
|
||||
print_cpu_stall_fast_no_hz(fast_no_hz, cpu);
|
||||
pr_err("\t%d-%c%c%c: (%lu %s) idle=%03x/%llx/%d softirq=%u/%u fqs=%ld %s\n",
|
||||
delta = rdp->mynode->gpnum - rdp->rcu_iw_gpnum;
|
||||
pr_err("\t%d-%c%c%c%c: (%lu %s) idle=%03x/%llx/%d softirq=%u/%u fqs=%ld %s\n",
|
||||
cpu,
|
||||
"O."[!!cpu_online(cpu)],
|
||||
"o."[!!(rdp->grpmask & rdp->mynode->qsmaskinit)],
|
||||
"N."[!!(rdp->grpmask & rdp->mynode->qsmaskinitnext)],
|
||||
!IS_ENABLED(CONFIG_IRQ_WORK) ? '?' :
|
||||
rdp->rcu_iw_pending ? (int)min(delta, 9UL) + '0' :
|
||||
"!."[!delta],
|
||||
ticks_value, ticks_title,
|
||||
rcu_dynticks_snap(rdtp) & 0xfff,
|
||||
rdtp->dynticks_nesting, rdtp->dynticks_nmi_nesting,
|
||||
|
|
|
|||
|
|
@ -494,6 +494,7 @@ EXPORT_SYMBOL_GPL(do_trace_rcu_torture_read);
|
|||
#endif
|
||||
|
||||
int rcu_cpu_stall_suppress __read_mostly; /* 1 = suppress stall warnings. */
|
||||
EXPORT_SYMBOL_GPL(rcu_cpu_stall_suppress);
|
||||
static int rcu_cpu_stall_timeout __read_mostly = CONFIG_RCU_CPU_STALL_TIMEOUT;
|
||||
|
||||
module_param(rcu_cpu_stall_suppress, int, 0644);
|
||||
|
|
@ -575,7 +576,6 @@ DEFINE_STATIC_SRCU(tasks_rcu_exit_srcu);
|
|||
static int rcu_task_stall_timeout __read_mostly = RCU_TASK_STALL_TIMEOUT;
|
||||
module_param(rcu_task_stall_timeout, int, 0644);
|
||||
|
||||
static void rcu_spawn_tasks_kthread(void);
|
||||
static struct task_struct *rcu_tasks_kthread_ptr;
|
||||
|
||||
/**
|
||||
|
|
@ -600,7 +600,6 @@ void call_rcu_tasks(struct rcu_head *rhp, rcu_callback_t func)
|
|||
{
|
||||
unsigned long flags;
|
||||
bool needwake;
|
||||
bool havetask = READ_ONCE(rcu_tasks_kthread_ptr);
|
||||
|
||||
rhp->next = NULL;
|
||||
rhp->func = func;
|
||||
|
|
@ -610,11 +609,8 @@ void call_rcu_tasks(struct rcu_head *rhp, rcu_callback_t func)
|
|||
rcu_tasks_cbs_tail = &rhp->next;
|
||||
raw_spin_unlock_irqrestore(&rcu_tasks_cbs_lock, flags);
|
||||
/* We can't create the thread unless interrupts are enabled. */
|
||||
if ((needwake && havetask) ||
|
||||
(!havetask && !irqs_disabled_flags(flags))) {
|
||||
rcu_spawn_tasks_kthread();
|
||||
if (needwake && READ_ONCE(rcu_tasks_kthread_ptr))
|
||||
wake_up(&rcu_tasks_cbs_wq);
|
||||
}
|
||||
}
|
||||
EXPORT_SYMBOL_GPL(call_rcu_tasks);
|
||||
|
||||
|
|
@ -853,27 +849,18 @@ static int __noreturn rcu_tasks_kthread(void *arg)
|
|||
}
|
||||
}
|
||||
|
||||
/* Spawn rcu_tasks_kthread() at first call to call_rcu_tasks(). */
|
||||
static void rcu_spawn_tasks_kthread(void)
|
||||
/* Spawn rcu_tasks_kthread() at core_initcall() time. */
|
||||
static int __init rcu_spawn_tasks_kthread(void)
|
||||
{
|
||||
static DEFINE_MUTEX(rcu_tasks_kthread_mutex);
|
||||
struct task_struct *t;
|
||||
|
||||
if (READ_ONCE(rcu_tasks_kthread_ptr)) {
|
||||
smp_mb(); /* Ensure caller sees full kthread. */
|
||||
return;
|
||||
}
|
||||
mutex_lock(&rcu_tasks_kthread_mutex);
|
||||
if (rcu_tasks_kthread_ptr) {
|
||||
mutex_unlock(&rcu_tasks_kthread_mutex);
|
||||
return;
|
||||
}
|
||||
t = kthread_run(rcu_tasks_kthread, NULL, "rcu_tasks_kthread");
|
||||
BUG_ON(IS_ERR(t));
|
||||
smp_mb(); /* Ensure others see full kthread. */
|
||||
WRITE_ONCE(rcu_tasks_kthread_ptr, t);
|
||||
mutex_unlock(&rcu_tasks_kthread_mutex);
|
||||
return 0;
|
||||
}
|
||||
core_initcall(rcu_spawn_tasks_kthread);
|
||||
|
||||
/* Do the srcu_read_lock() for the above synchronize_srcu(). */
|
||||
void exit_tasks_rcu_start(void)
|
||||
|
|
|
|||
|
|
@ -505,8 +505,7 @@ void resched_cpu(int cpu)
|
|||
struct rq *rq = cpu_rq(cpu);
|
||||
unsigned long flags;
|
||||
|
||||
if (!raw_spin_trylock_irqsave(&rq->lock, flags))
|
||||
return;
|
||||
raw_spin_lock_irqsave(&rq->lock, flags);
|
||||
resched_curr(rq);
|
||||
raw_spin_unlock_irqrestore(&rq->lock, flags);
|
||||
}
|
||||
|
|
@ -4842,6 +4841,7 @@ int __sched _cond_resched(void)
|
|||
preempt_schedule_common();
|
||||
return 1;
|
||||
}
|
||||
rcu_all_qs();
|
||||
return 0;
|
||||
}
|
||||
EXPORT_SYMBOL(_cond_resched);
|
||||
|
|
@ -5165,6 +5165,7 @@ void sched_show_task(struct task_struct *p)
|
|||
show_stack(p, NULL);
|
||||
put_task_stack(p);
|
||||
}
|
||||
EXPORT_SYMBOL_GPL(sched_show_task);
|
||||
|
||||
static inline bool
|
||||
state_filter_match(unsigned long state_filter, struct task_struct *p)
|
||||
|
|
|
|||
|
|
@ -42,7 +42,7 @@ else
|
|||
exit 1
|
||||
fi
|
||||
|
||||
T=/tmp/config_override.sh.$$
|
||||
T=${TMPDIR-/tmp}/config_override.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -19,7 +19,7 @@
|
|||
#
|
||||
# Authors: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
|
||||
|
||||
T=/tmp/abat-chk-config.sh.$$
|
||||
T=${TMPDIR-/tmp}/abat-chk-config.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -32,7 +32,7 @@
|
|||
#
|
||||
# Authors: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
|
||||
|
||||
T=/tmp/configinit.sh.$$
|
||||
T=${TMPDIR-/tmp}/configinit.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -35,7 +35,7 @@ then
|
|||
exit 1
|
||||
fi
|
||||
|
||||
T=/tmp/test-linux.sh.$$
|
||||
T=${TMPDIR-/tmp}/test-linux.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -38,7 +38,7 @@
|
|||
#
|
||||
# Authors: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
|
||||
|
||||
T=/tmp/kvm-test-1-run.sh.$$
|
||||
T=${TMPDIR-/tmp}/kvm-test-1-run.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -30,7 +30,7 @@
|
|||
scriptname=$0
|
||||
args="$*"
|
||||
|
||||
T=/tmp/kvm.sh.$$
|
||||
T=${TMPDIR-/tmp}/kvm.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
@ -222,7 +222,7 @@ do
|
|||
exit 1
|
||||
fi
|
||||
done
|
||||
sort -k2nr $T/cfgcpu > $T/cfgcpu.sort
|
||||
sort -k2nr $T/cfgcpu -T="$T" > $T/cfgcpu.sort
|
||||
|
||||
# Use a greedy bin-packing algorithm, sorting the list accordingly.
|
||||
awk < $T/cfgcpu.sort > $T/cfgcpu.pack -v ncpus=$cpus '
|
||||
|
|
|
|||
|
|
@ -28,7 +28,7 @@
|
|||
|
||||
F=$1
|
||||
title=$2
|
||||
T=/tmp/parse-build.sh.$$
|
||||
T=${TMPDIR-/tmp}/parse-build.sh.$$
|
||||
trap 'rm -rf $T' 0
|
||||
mkdir $T
|
||||
|
||||
|
|
|
|||
|
|
@ -27,7 +27,7 @@
|
|||
#
|
||||
# Authors: Paul E. McKenney <paulmck@linux.vnet.ibm.com>
|
||||
|
||||
T=/tmp/parse-torture.sh.$$
|
||||
T=${TMPDIR-/tmp}/parse-torture.sh.$$
|
||||
file="$1"
|
||||
title="$2"
|
||||
|
||||
|
|
|
|||
Loading…
Reference in New Issue