3 =========================
4 Atomic operations in QEMU
5 =========================
7 CPUs perform independent memory operations effectively in random order.
8 but this can be a problem for CPU-CPU interaction (including interactions
9 between QEMU and the guest). Multi-threaded programs use various tools
10 to instruct the compiler and the CPU to restrict the order to something
11 that is consistent with the expectations of the programmer.
13 The most basic tool is locking. Mutexes, condition variables and
14 semaphores are used in QEMU, and should be the default approach to
15 synchronization. Anything else is considerably harder, but it's
16 also justified more often than one would like;
17 the most performance-critical parts of QEMU in particular require
18 a very low level approach to concurrency, involving memory barriers
19 and atomic operations. The semantics of concurrent memory accesses are governed
20 by the C11 memory model.
22 QEMU provides a header, ``qemu/atomic.h``, which wraps C11 atomics to
23 provide better portability and a less verbose syntax. ``qemu/atomic.h``
24 provides macros that fall in three camps:
26 - compiler barriers: ``barrier()``;
28 - weak atomic access and manual memory barriers: ``qatomic_read()``,
29 ``qatomic_set()``, ``smp_rmb()``, ``smp_wmb()``, ``smp_mb()``,
30 ``smp_mb_acquire()``, ``smp_mb_release()``, ``smp_read_barrier_depends()``,
31 ``smp_mb__before_rmw()``, ``smp_mb__after_rmw()``;
33 - sequentially consistent atomic access: everything else.
35 In general, use of ``qemu/atomic.h`` should be wrapped with more easily
36 used data structures (e.g. the lock-free singly-linked list operations
37 ``QSLIST_INSERT_HEAD_ATOMIC`` and ``QSLIST_MOVE_ATOMIC``) or synchronization
38 primitives (such as RCU, ``QemuEvent`` or ``QemuLockCnt``). Bare use of
39 atomic operations and memory barriers should be limited to inter-thread
40 checking of flags and documented thoroughly.
44 Compiler memory barrier
45 =======================
47 ``barrier()`` prevents the compiler from moving the memory accesses on
48 either side of it to the other side. The compiler barrier has no direct
49 effect on the CPU, which may then reorder things however it wishes.
51 ``barrier()`` is mostly used within ``qemu/atomic.h`` itself. On some
52 architectures, CPU guarantees are strong enough that blocking compiler
53 optimizations already ensures the correct order of execution. In this
54 case, ``qemu/atomic.h`` will reduce stronger memory barriers to simple
57 Still, ``barrier()`` can be useful when writing code that can be interrupted
61 Sequentially consistent atomic access
62 =====================================
64 Most of the operations in the ``qemu/atomic.h`` header ensure *sequential
65 consistency*, where "the result of any execution is the same as if the
66 operations of all the processors were executed in some sequential order,
67 and the operations of each individual processor appear in this sequence
68 in the order specified by its program".
70 ``qemu/atomic.h`` provides the following set of atomic read-modify-write
75 void qatomic_add(ptr, val)
76 void qatomic_sub(ptr, val)
77 void qatomic_and(ptr, val)
78 void qatomic_or(ptr, val)
80 typeof(*ptr) qatomic_fetch_inc(ptr)
81 typeof(*ptr) qatomic_fetch_dec(ptr)
82 typeof(*ptr) qatomic_fetch_add(ptr, val)
83 typeof(*ptr) qatomic_fetch_sub(ptr, val)
84 typeof(*ptr) qatomic_fetch_and(ptr, val)
85 typeof(*ptr) qatomic_fetch_or(ptr, val)
86 typeof(*ptr) qatomic_fetch_xor(ptr, val)
87 typeof(*ptr) qatomic_fetch_inc_nonzero(ptr)
88 typeof(*ptr) qatomic_xchg(ptr, val)
89 typeof(*ptr) qatomic_cmpxchg(ptr, old, new)
91 all of which return the old value of ``*ptr``. These operations are
92 polymorphic; they operate on any type that is as wide as a pointer or
95 Similar operations return the new value of ``*ptr``::
97 typeof(*ptr) qatomic_inc_fetch(ptr)
98 typeof(*ptr) qatomic_dec_fetch(ptr)
99 typeof(*ptr) qatomic_add_fetch(ptr, val)
100 typeof(*ptr) qatomic_sub_fetch(ptr, val)
101 typeof(*ptr) qatomic_and_fetch(ptr, val)
102 typeof(*ptr) qatomic_or_fetch(ptr, val)
103 typeof(*ptr) qatomic_xor_fetch(ptr, val)
105 ``qemu/atomic.h`` also provides loads and stores that cannot be reordered
108 typeof(*ptr) qatomic_mb_read(ptr)
109 void qatomic_mb_set(ptr, val)
111 However these do not provide sequential consistency and, in particular,
112 they do not participate in the total ordering enforced by
113 sequentially-consistent operations. For this reason they are deprecated.
114 They should instead be replaced with any of the following (ordered from
117 - accesses inside a mutex or spinlock
119 - lightweight synchronization primitives such as ``QemuEvent``
121 - RCU operations (``qatomic_rcu_read``, ``qatomic_rcu_set``) when publishing
122 or accessing a new version of a data structure
124 - other atomic accesses: ``qatomic_read`` and ``qatomic_load_acquire`` for
125 loads, ``qatomic_set`` and ``qatomic_store_release`` for stores, ``smp_mb``
126 to forbid reordering subsequent loads before a store.
129 Weak atomic access and manual memory barriers
130 =============================================
132 Compared to sequentially consistent atomic access, programming with
133 weaker consistency models can be considerably more complicated.
134 The only guarantees that you can rely upon in this case are:
136 - atomic accesses will not cause data races (and hence undefined behavior);
137 ordinary accesses instead cause data races if they are concurrent with
138 other accesses of which at least one is a write. In order to ensure this,
139 the compiler will not optimize accesses out of existence, create unsolicited
140 accesses, or perform other similar optimzations.
142 - acquire operations will appear to happen, with respect to the other
143 components of the system, before all the LOAD or STORE operations
144 specified afterwards.
146 - release operations will appear to happen, with respect to the other
147 components of the system, after all the LOAD or STORE operations
150 - release operations will *synchronize with* acquire operations;
151 see :ref:`acqrel` for a detailed explanation.
153 When using this model, variables are accessed with:
155 - ``qatomic_read()`` and ``qatomic_set()``; these prevent the compiler from
156 optimizing accesses out of existence and creating unsolicited
157 accesses, but do not otherwise impose any ordering on loads and
158 stores: both the compiler and the processor are free to reorder
161 - ``qatomic_load_acquire()``, which guarantees the LOAD to appear to
162 happen, with respect to the other components of the system,
163 before all the LOAD or STORE operations specified afterwards.
164 Operations coming before ``qatomic_load_acquire()`` can still be
167 - ``qatomic_store_release()``, which guarantees the STORE to appear to
168 happen, with respect to the other components of the system,
169 after all the LOAD or STORE operations specified before.
170 Operations coming after ``qatomic_store_release()`` can still be
173 Restrictions to the ordering of accesses can also be specified
174 using the memory barrier macros: ``smp_rmb()``, ``smp_wmb()``, ``smp_mb()``,
175 ``smp_mb_acquire()``, ``smp_mb_release()``, ``smp_read_barrier_depends()``.
177 Memory barriers control the order of references to shared memory.
178 They come in six kinds:
180 - ``smp_rmb()`` guarantees that all the LOAD operations specified before
181 the barrier will appear to happen before all the LOAD operations
182 specified after the barrier with respect to the other components of
185 In other words, ``smp_rmb()`` puts a partial ordering on loads, but is not
186 required to have any effect on stores.
188 - ``smp_wmb()`` guarantees that all the STORE operations specified before
189 the barrier will appear to happen before all the STORE operations
190 specified after the barrier with respect to the other components of
193 In other words, ``smp_wmb()`` puts a partial ordering on stores, but is not
194 required to have any effect on loads.
196 - ``smp_mb_acquire()`` guarantees that all the LOAD operations specified before
197 the barrier will appear to happen before all the LOAD or STORE operations
198 specified after the barrier with respect to the other components of
201 - ``smp_mb_release()`` guarantees that all the STORE operations specified *after*
202 the barrier will appear to happen after all the LOAD or STORE operations
203 specified *before* the barrier with respect to the other components of
206 - ``smp_mb()`` guarantees that all the LOAD and STORE operations specified
207 before the barrier will appear to happen before all the LOAD and
208 STORE operations specified after the barrier with respect to the other
209 components of the system.
211 ``smp_mb()`` puts a partial ordering on both loads and stores. It is
212 stronger than both a read and a write memory barrier; it implies both
213 ``smp_mb_acquire()`` and ``smp_mb_release()``, but it also prevents STOREs
214 coming before the barrier from overtaking LOADs coming after the
215 barrier and vice versa.
217 - ``smp_read_barrier_depends()`` is a weaker kind of read barrier. On
218 most processors, whenever two loads are performed such that the
219 second depends on the result of the first (e.g., the first load
220 retrieves the address to which the second load will be directed),
221 the processor will guarantee that the first LOAD will appear to happen
222 before the second with respect to the other components of the system.
223 However, this is not always true---for example, it was not true on
224 Alpha processors. Whenever this kind of access happens to shared
225 memory (that is not protected by a lock), a read barrier is needed,
226 and ``smp_read_barrier_depends()`` can be used instead of ``smp_rmb()``.
228 Note that the first load really has to have a _data_ dependency and not
229 a control dependency. If the address for the second load is dependent
230 on the first load, but the dependency is through a conditional rather
231 than actually loading the address itself, then it's a _control_
232 dependency and a full read barrier or better is required.
235 Memory barriers and ``qatomic_load_acquire``/``qatomic_store_release`` are
236 mostly used when a data structure has one thread that is always a writer
237 and one thread that is always a reader:
239 +----------------------------------+----------------------------------+
240 | thread 1 | thread 2 |
241 +==================================+==================================+
244 | qatomic_store_release(&a, x); | y = qatomic_load_acquire(&b); |
245 | qatomic_store_release(&b, y); | x = qatomic_load_acquire(&a); |
246 +----------------------------------+----------------------------------+
248 In this case, correctness is easy to check for using the "pairing"
249 trick that is explained below.
251 Sometimes, a thread is accessing many variables that are otherwise
252 unrelated to each other (for example because, apart from the current
253 thread, exactly one other thread will read or write each of these
254 variables). In this case, it is possible to "hoist" the barriers
255 outside a loop. For example:
257 +------------------------------------------+----------------------------------+
259 +==========================================+==================================+
263 | for (i = 0; i < 10; i++) | for (i = 0; i < 10; i++) |
264 | n += qatomic_load_acquire(&a[i]); | n += qatomic_read(&a[i]); |
265 | | smp_mb_acquire(); |
266 +------------------------------------------+----------------------------------+
269 | | smp_mb_release(); |
270 | for (i = 0; i < 10; i++) | for (i = 0; i < 10; i++) |
271 | qatomic_store_release(&a[i], false); | qatomic_set(&a[i], false); |
272 +------------------------------------------+----------------------------------+
274 Splitting a loop can also be useful to reduce the number of barriers:
276 +------------------------------------------+----------------------------------+
278 +==========================================+==================================+
281 | n = 0; | smp_mb_release(); |
282 | for (i = 0; i < 10; i++) { | for (i = 0; i < 10; i++) |
283 | qatomic_store_release(&a[i], false); | qatomic_set(&a[i], false); |
284 | smp_mb(); | smb_mb(); |
285 | n += qatomic_read(&b[i]); | n = 0; |
286 | } | for (i = 0; i < 10; i++) |
287 | | n += qatomic_read(&b[i]); |
288 +------------------------------------------+----------------------------------+
290 In this case, a ``smp_mb_release()`` is also replaced with a (possibly cheaper, and clearer
291 as well) ``smp_wmb()``:
293 +------------------------------------------+----------------------------------+
295 +==========================================+==================================+
298 | | smp_mb_release(); |
299 | for (i = 0; i < 10; i++) { | for (i = 0; i < 10; i++) |
300 | qatomic_store_release(&a[i], false); | qatomic_set(&a[i], false); |
301 | qatomic_store_release(&b[i], false); | smb_wmb(); |
302 | } | for (i = 0; i < 10; i++) |
303 | | qatomic_set(&b[i], false); |
304 +------------------------------------------+----------------------------------+
309 Acquire/release pairing and the *synchronizes-with* relation
310 ------------------------------------------------------------
312 Atomic operations other than ``qatomic_set()`` and ``qatomic_read()`` have
313 either *acquire* or *release* semantics [#rmw]_. This has two effects:
315 .. [#rmw] Read-modify-write operations can have both---acquire applies to the
316 read part, and release to the write.
318 - within a thread, they are ordered either before subsequent operations
319 (for acquire) or after previous operations (for release).
321 - if a release operation in one thread *synchronizes with* an acquire operation
322 in another thread, the ordering constraints propagates from the first to the
323 second thread. That is, everything before the release operation in the
324 first thread is guaranteed to *happen before* everything after the
325 acquire operation in the second thread.
327 The concept of acquire and release semantics is not exclusive to atomic
328 operations; almost all higher-level synchronization primitives also have
329 acquire or release semantics. For example:
331 - ``pthread_mutex_lock`` has acquire semantics, ``pthread_mutex_unlock`` has
332 release semantics and synchronizes with a ``pthread_mutex_lock`` for the
335 - ``pthread_cond_signal`` and ``pthread_cond_broadcast`` have release semantics;
336 ``pthread_cond_wait`` has both release semantics (synchronizing with
337 ``pthread_mutex_lock``) and acquire semantics (synchronizing with
338 ``pthread_mutex_unlock`` and signaling of the condition variable).
340 - ``pthread_create`` has release semantics and synchronizes with the start
341 of the new thread; ``pthread_join`` has acquire semantics and synchronizes
342 with the exiting of the thread.
344 - ``qemu_event_set`` has release semantics, ``qemu_event_wait`` has
347 For example, in the following example there are no atomic accesses, but still
348 thread 2 is relying on the *synchronizes-with* relation between ``pthread_exit``
349 (release) and ``pthread_join`` (acquire):
351 +----------------------+-------------------------------+
352 | thread 1 | thread 2 |
353 +======================+===============================+
357 | pthread_exit(a); | pthread_join(thread1, &a); |
359 +----------------------+-------------------------------+
361 Synchronization between threads basically descends from this pairing of
362 a release operation and an acquire operation. Therefore, atomic operations
363 other than ``qatomic_set()`` and ``qatomic_read()`` will almost always be
364 paired with another operation of the opposite kind: an acquire operation
365 will pair with a release operation and vice versa. This rule of thumb is
366 extremely useful; in the case of QEMU, however, note that the other
367 operation may actually be in a driver that runs in the guest!
369 ``smp_read_barrier_depends()``, ``smp_rmb()``, ``smp_mb_acquire()``,
370 ``qatomic_load_acquire()`` and ``qatomic_rcu_read()`` all count
371 as acquire operations. ``smp_wmb()``, ``smp_mb_release()``,
372 ``qatomic_store_release()`` and ``qatomic_rcu_set()`` all count as release
373 operations. ``smp_mb()`` counts as both acquire and release, therefore
374 it can pair with any other atomic operation. Here is an example:
376 +----------------------+------------------------------+
377 | thread 1 | thread 2 |
378 +======================+==============================+
381 | qatomic_set(&a, 1);| |
383 | qatomic_set(&b, 2);| x = qatomic_read(&b); |
385 | | y = qatomic_read(&a); |
386 +----------------------+------------------------------+
388 Note that a load-store pair only counts if the two operations access the
389 same variable: that is, a store-release on a variable ``x`` *synchronizes
390 with* a load-acquire on a variable ``x``, while a release barrier
391 synchronizes with any acquire operation. The following example shows
392 correct synchronization:
394 +--------------------------------+--------------------------------+
395 | thread 1 | thread 2 |
396 +================================+================================+
399 | qatomic_set(&a, 1); | |
400 | qatomic_store_release(&b, 2);| x = qatomic_load_acquire(&b);|
401 | | y = qatomic_read(&a); |
402 +--------------------------------+--------------------------------+
404 Acquire and release semantics of higher-level primitives can also be
405 relied upon for the purpose of establishing the *synchronizes with*
408 Note that the "writing" thread is accessing the variables in the
409 opposite order as the "reading" thread. This is expected: stores
410 before a release operation will normally match the loads after
411 the acquire operation, and vice versa. In fact, this happened already
412 in the ``pthread_exit``/``pthread_join`` example above.
414 Finally, this more complex example has more than two accesses and data
415 dependency barriers. It also does not use atomic accesses whenever there
416 cannot be a data race:
418 +----------------------+------------------------------+
419 | thread 1 | thread 2 |
420 +======================+==============================+
427 | qatomic_set(&a, x);| x = qatomic_read(&a); |
428 | | smp_read_barrier_depends(); |
430 | | smp_read_barrier_depends(); |
432 +----------------------+------------------------------+
434 Comparison with Linux kernel primitives
435 =======================================
437 Here is a list of differences between Linux kernel atomic operations
438 and memory barriers, and the equivalents in QEMU:
440 - atomic operations in Linux are always on a 32-bit int type and
441 use a boxed ``atomic_t`` type; atomic operations in QEMU are polymorphic
442 and use normal C types.
444 - Originally, ``atomic_read`` and ``atomic_set`` in Linux gave no guarantee
445 at all. Linux 4.1 updated them to implement volatile
446 semantics via ``ACCESS_ONCE`` (or the more recent ``READ``/``WRITE_ONCE``).
448 QEMU's ``qatomic_read`` and ``qatomic_set`` implement C11 atomic relaxed
449 semantics if the compiler supports it, and volatile semantics otherwise.
450 Both semantics prevent the compiler from doing certain transformations;
451 the difference is that atomic accesses are guaranteed to be atomic,
452 while volatile accesses aren't. Thus, in the volatile case we just cross
453 our fingers hoping that the compiler will generate atomic accesses,
454 since we assume the variables passed are machine-word sized and
457 No barriers are implied by ``qatomic_read`` and ``qatomic_set`` in either
460 - atomic read-modify-write operations in Linux are of three kinds:
462 ===================== =========================================
463 ``atomic_OP`` returns void
464 ``atomic_OP_return`` returns new value of the variable
465 ``atomic_fetch_OP`` returns the old value of the variable
466 ``atomic_cmpxchg`` returns the old value of the variable
467 ===================== =========================================
469 In QEMU, the second kind is named ``atomic_OP_fetch``.
471 - different atomic read-modify-write operations in Linux imply
472 a different set of memory barriers. In QEMU, all of them enforce
473 sequential consistency: there is a single order in which the
474 program sees them happen.
476 - however, according to the C11 memory model that QEMU uses, this order
477 does not propagate to other memory accesses on either side of the
478 read-modify-write operation. As far as those are concerned, the
479 operation consist of just a load-acquire followed by a store-release.
480 Stores that precede the RMW operation, and loads that follow it, can
481 still be reordered and will happen *in the middle* of the read-modify-write
484 Therefore, the following example is correct in Linux but not in QEMU:
486 +----------------------------------+--------------------------------+
487 | Linux (correct) | QEMU (incorrect) |
488 +==================================+================================+
491 | a = atomic_fetch_add(&x, 2); | a = qatomic_fetch_add(&x, 2);|
492 | b = READ_ONCE(&y); | b = qatomic_read(&y); |
493 +----------------------------------+--------------------------------+
495 because the read of ``y`` can be moved (by either the processor or the
496 compiler) before the write of ``x``.
498 Fixing this requires a full memory barrier between the write of ``x`` and
499 the read of ``y``. QEMU provides ``smp_mb__before_rmw()`` and
500 ``smp_mb__after_rmw()``; they act both as an optimization,
501 avoiding the memory barrier on processors where it is unnecessary,
502 and as a clarification of this corner case of the C11 memory model:
504 +--------------------------------+
506 +================================+
509 | a = qatomic_fetch_add(&x, 2);|
510 | smp_mb__after_rmw(); |
511 | b = qatomic_read(&y); |
512 +--------------------------------+
514 In the common case where only one thread writes ``x``, it is also possible
515 to write it like this:
517 +--------------------------------+
519 +================================+
522 | a = qatomic_read(&x); |
523 | qatomic_set(&x, a + 2); |
525 | b = qatomic_read(&y); |
526 +--------------------------------+
531 - ``Documentation/memory-barriers.txt`` from the Linux kernel