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Merge branch 'for-mingo' of git://git.kernel.org/pub/scm/linux/kernel/git/paulmck/linux-rcu into core/rcu

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Pull RCU updates from Paul E. McKenney:

 - Documentation updates
 - Miscellaneous fixes
 - RCU CPU stall-warning updates
 - Torture-test updates

Signed-off-by: Ingo Molnar <mingo@kernel.org>
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Ingo Molnar 2017-10-24 10:49:44 +02:00
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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">
<p>August 8, 2017</p>
<p>This article was contributed by Paul E.&nbsp;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>-&gt;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 &amp;&amp; r2 == 0 &amp;&amp; r3 == 0);
</pre>
<p>The <tt>WARN_ON()</tt> is evaluated at &ldquo;the end of time&rdquo;,
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>&nbsp;</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>-&gt;lock</tt> as described above.
</font></td></tr>
<tr><td>&nbsp;</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>&nbsp;</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>&nbsp;</td></tr>
</table>
<p>Tree RCU's grace--period memory-ordering guarantees rely most
heavily on the <tt>rcu_node</tt> structure's <tt>-&gt;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(&amp;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-&gt;tick_nohz_enabled_snap) {
15 if (rcu_cpu_has_callbacks(NULL))
16 invoke_rcu_core();
17 rdtp-&gt;tick_nohz_enabled_snap = tne;
18 return;
19 }
20 if (!tne)
21 return;
22 if (rdtp-&gt;all_lazy &amp;&amp;
23 rdtp-&gt;nonlazy_posted != rdtp-&gt;nonlazy_posted_snap) {
24 rdtp-&gt;all_lazy = false;
25 rdtp-&gt;nonlazy_posted_snap = rdtp-&gt;nonlazy_posted;
26 invoke_rcu_core();
27 return;
28 }
29 if (rdtp-&gt;last_accelerate == jiffies)
30 return;
31 rdtp-&gt;last_accelerate = jiffies;
32 for_each_rcu_flavor(rsp) {
33 rdp = this_cpu_ptr(rsp-&gt;rda);
34 if (rcu_segcblist_pend_cbs(&amp;rdp-&gt;cblist))
35 continue;
36 rnp = rdp-&gt;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&nbsp;37&ndash;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>-&gt;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>-&gt;lock</tt>.
In all cases, there is full ordering against any prior critical section
for that same <tt>rcu_node</tt> structure's <tt>-&gt;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>-&gt;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>&nbsp;</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>&nbsp;</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>-&gt;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>-&gt;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>-&gt;gpnum</tt> field) before setting each leaf <tt>rcu_node</tt>
structure's <tt>-&gt;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>&nbsp;</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>&nbsp;</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>-&gt;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>&nbsp;</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>-&gt;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 &ldquo;big bang&rdquo;
all-at-once grace-period start could possibly be.
</font></td></tr>
<tr><td>&nbsp;</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>-&gt;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>-&gt;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 &ldquo;last CPU&rdquo;
being the one that clears the last bit in the root <tt>rcu_node</tt>
structure's <tt>-&gt;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>-&gt;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>-&gt;lock</tt> and update this structure's
<tt>-&gt;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 &ldquo;forcing quiescent states&rdquo;, 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>&nbsp;</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>&nbsp;</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>-&gt;completed</tt> fields equal
to the number of the newly completed grace period, then it sets
the <tt>rcu_state</tt> structure's <tt>-&gt;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>&nbsp;</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>-&gt;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>&nbsp;</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>-&gt;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>-&gt;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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@ -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.

3
Documentation/admin-guide/kernel-parameters.txt
View File

@ -3539,6 +3539,9 @@
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.

183
Documentation/memory-barriers.txt
View File

@ -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

3
include/linux/irq_work.h
View File

@ -33,10 +33,7 @@ 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);

9
kernel/irq_work.c
View File

@ -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)

21
kernel/rcu/rcu.h
View File

@ -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);

1
kernel/rcu/rcu_segcblist.c
View File

@ -23,6 +23,7 @@
#include <linux/types.h>
#include <linux/kernel.h>
#include <linux/interrupt.h>
#include <linux/rcupdate.h>
#include "rcu_segcblist.h"

24
kernel/rcu/rcutorture.c
View File

@ -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");
}

159
kernel/rcu/tree.c
View File

@ -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);
}
}

5
kernel/rcu/tree.h
View File

@ -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;

14
kernel/rcu/tree_plugin.h
View File

@ -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,

25
kernel/rcu/update.c
View File

@ -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)

5
kernel/sched/core.c
View File

@ -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)

2
tools/testing/selftests/rcutorture/bin/config_override.sh
View File

@ -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

2
tools/testing/selftests/rcutorture/bin/configcheck.sh
View File

@ -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

2
tools/testing/selftests/rcutorture/bin/configinit.sh
View File

@ -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

2
tools/testing/selftests/rcutorture/bin/kvm-build.sh
View File

@ -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

2
tools/testing/selftests/rcutorture/bin/kvm-test-1-run.sh
View File

@ -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

4
tools/testing/selftests/rcutorture/bin/kvm.sh
View File

@ -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 '

2
tools/testing/selftests/rcutorture/bin/parse-build.sh
View File

@ -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

2
tools/testing/selftests/rcutorture/bin/parse-torture.sh
View File

@ -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"