- 29 Sep, 2020 1 commit
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Boqun Feng authored
Qian Cai reported a BFS_EQUEUEFULL warning [1] after read recursive deadlock detection merged into tip tree recently. Unlike the previous lockep graph searching, which iterate every lock class (every node in the graph) exactly once, the graph searching for read recurisve deadlock detection needs to iterate every lock dependency (every edge in the graph) once, as a result, the maximum memory cost of the circular queue changes from O(V), where V is the number of lock classes (nodes or vertices) in the graph, to O(E), where E is the number of lock dependencies (edges), because every lock class or dependency gets enqueued once in the BFS. Therefore we hit the BFS_EQUEUEFULL case. However, actually we don't need to enqueue all dependencies for the BFS, because every time we enqueue a dependency, we almostly enqueue all other dependencies in the same dependency list ("almostly" is because we currently check before enqueue, so if a dependency doesn't pass the check stage we won't enqueue it, however, we can always do in reverse ordering), based on this, we can only enqueue the first dependency from a dependency list and every time we want to fetch a new dependency to work, we can either: 1) fetch the dependency next to the current dependency in the dependency list or 2) if the dependency in 1) doesn't exist, fetch the dependency from the queue. With this approach, the "max bfs queue depth" for a x86_64_defconfig + lockdep and selftest config kernel can get descreased from: max bfs queue depth: 201 to (after apply this patch) max bfs queue depth: 61 While I'm at it, clean up the code logic a little (e.g. directly return other than set a "ret" value and goto the "exit" label). [1]: https://lore.kernel.org/lkml/17343f6f7f2438fc376125384133c5ba70c2a681.camel@redhat.com/Reported-by:Qian Cai <cai@redhat.com> Reported-by: syzbot+62ebe501c1ce9a91f68c@syzkaller.appspotmail.com Signed-off-by:
Boqun Feng <boqun.feng@gmail.com> Signed-off-by:
Peter Zijlstra (Intel) <peterz@infradead.org> Link: https://lkml.kernel.org/r/20200917080210.108095-1-boqun.feng@gmail.com
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- 16 Sep, 2020 1 commit
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peterz@infradead.org authored
seqcount_LOCKNAME_init() needs to be a macro due to the lockdep annotation in seqcount_init(). Since a macro cannot define another macro, we need to effectively revert commit: e4e9ab3f ("seqlock: Fold seqcount_LOCKNAME_init() definition"). Fixes: e4e9ab3f ("seqlock: Fold seqcount_LOCKNAME_init() definition") Reported-by:
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- 10 Sep, 2020 13 commits
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Ahmed S. Darwish authored
On PREEMPT_RT, seqlock_t is transformed to a sleeping lock that do not disable preemption. A seqlock_t reader can thus preempt its write side section and spin for the enter scheduler tick. If that reader belongs to a real-time scheduling class, it can spin forever and the kernel will livelock. To break this livelock possibility on PREEMPT_RT, implement seqlock_t in terms of "seqcount_spinlock_t" instead of plain "seqcount_t". Beside its pure annotational value, this will leverage the existing seqcount_LOCKNAME_T PREEMPT_RT anti-livelock mechanisms, without adding any extra code. Signed-off-by:
Ahmed S. Darwish <a.darwish@linutronix.de> Signed-off-by:
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Ahmed S. Darwish authored
Preemption must be disabled before entering a sequence counter write side critical section. Otherwise the read side section can preempt the write side section and spin for the entire scheduler tick. If that reader belongs to a real-time scheduling class, it can spin forever and the kernel will livelock. Disabling preemption cannot be done for PREEMPT_RT though: it can lead to higher latencies, and the write side sections will not be able to acquire locks which become sleeping locks (e.g. spinlock_t). To remain preemptible, while avoiding a possible livelock caused by the reader preempting the writer, use a different technique: let the reader detect if a seqcount_LOCKNAME_t writer is in progress. If that's the case, acquire then release the associated LOCKNAME writer serialization lock. This will allow any possibly-preempted writer to make progress until the end of its writer serialization lock critical section. Implement this lock-unlock technique for all seqcount_LOCKNAME_t with an associated (PREEMPT_RT) sleeping lock. References: 55f3560d ("seqlock: Extend seqcount API with associated locks") Signed-off-by:
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Ahmed S. Darwish authored
The sequence counters read APIs are implemented as CPP macros, so they can take either seqcount_t or any of the seqcount_LOCKNAME_t variants. Such macros then get *directly* transformed to internal C functions that only take plain seqcount_t. Further commits need access to seqcount_LOCKNAME_t inside of the actual read APIs code. Thus transform all of the seqcount read APIs to pure GCC statement expressions instead. This will not break type-safety: all of the transformed APIs resolve to a _Generic() selection that does not have a "default" case. This will also not affect the transformed APIs readability: previously added kernel-doc above all of seqlock.h functions makes the expectations quite clear for call-site developers. Signed-off-by:
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Ahmed S. Darwish authored
At seqlock.h, the following set of functions: - __seqcount_ptr() - __seqcount_preemptible() - __seqcount_assert() act as plain seqcount_t "property" accessors. Meanwhile, the following group: - __seqcount_ptr() - __seqcount_lock_preemptible() - __seqcount_assert_lock_held() act as the equivalent set, but in the generic form, taking either seqcount_t or any of the seqcount_LOCKNAME_t variants. This is quite confusing, especially the first member where it is called exactly the same in both groups. Differentiate the first group by using "__seqprop" as prefix, and also use that same prefix for all of seqcount_LOCKNAME_t property accessors. While at it, constify the property accessors first parameter when appropriate. References: 55f3560d ("seqlock: Extend seqcount API with associated locks") Signed-off-by: -
Ahmed S. Darwish authored
At seqlock.h, sequence counters with associated locks are either called seqcount_LOCKNAME_t, seqcount_LOCKTYPE_t, or seqcount_locktype_t. Standardize on seqcount_LOCKNAME_t for all instances in comments, kernel-doc, and SEQCOUNT_LOCKNAME() generative macro paramters. Signed-off-by:
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Ahmed S. Darwish authored
All latch sequence counter call-sites have now been converted from plain seqcount_t to the new seqcount_latch_t data type. Enforce type-safety by modifying seqlock.h latch APIs to only accept seqcount_latch_t. Signed-off-by:
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Ahmed S. Darwish authored
Latch sequence counters have unique read and write APIs, and thus seqcount_latch_t was recently introduced at seqlock.h. Use that new data type instead of plain seqcount_t. This adds the necessary type-safety and ensures that only latching-safe seqcount APIs are to be used. Signed-off-by:
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Ahmed S. Darwish authored
Latch sequence counters have unique read and write APIs, and thus seqcount_latch_t was recently introduced at seqlock.h. Use that new data type instead of plain seqcount_t. This adds the necessary type-safety and ensures that only latching-safe seqcount APIs are to be used. Signed-off-by:
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Ahmed S. Darwish authored
Latch sequence counters are a multiversion concurrency control mechanism where the seqcount_t counter even/odd value is used to switch between two data storage copies. This allows the seqcount_t read path to safely interrupt its write side critical section (e.g. from NMIs). Initially, latch sequence counters were implemented as a single write function, raw_write_seqcount_latch(), above plain seqcount_t. The read path was expected to use plain seqcount_t raw_read_seqcount(). A specialized read function was later added, raw_read_seqcount_latch(), and became the standardized way for latch read paths. Having unique read and write APIs meant that latch sequence counters are basically a data type of their own -- just inappropriately overloading plain seqcount_t. The seqcount_latch_t data type was thus introduced at seqlock.h. Use that new data type instead of seqcount_raw_spinlock_t. This ensures that only latch-safe APIs are to be used with the sequence counter. Note that the use of seqcount_raw_spinlock_t was not very useful in the first place. Only the "raw_" subset of seqcount_t APIs were used at timekeeping.c. This subset was created for contexts where lockdep cannot be used. seqcount_LOCKTYPE_t's raison d'être -- verifying that the seqcount_t writer serialization lock is held -- cannot thus be done. References: 0c3351d4 ("seqlock: Use raw_ prefix instead of _no_lockdep") References: 55f3560d ("seqlock: Extend seqcount API with associated locks") Signed-off-by:
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Ahmed S. Darwish authored
Latch sequence counters have unique read and write APIs, and thus seqcount_latch_t was recently introduced at seqlock.h. Use that new data type instead of plain seqcount_t. This adds the necessary type-safety and ensures only latching-safe seqcount APIs are to be used. Signed-off-by:
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Ahmed S. Darwish authored
Latch sequence counters are a multiversion concurrency control mechanism where the seqcount_t counter even/odd value is used to switch between two copies of protected data. This allows the seqcount_t read path to safely interrupt its write side critical section (e.g. from NMIs). Initially, latch sequence counters were implemented as a single write function above plain seqcount_t: raw_write_seqcount_latch(). The read side was expected to use plain seqcount_t raw_read_seqcount(). A specialized latch read function, raw_read_seqcount_latch(), was later added. It became the standardized way for latch read paths. Due to the dependent load, it has one read memory barrier less than the plain seqcount_t raw_read_seqcount() API. Only raw_write_seqcount_latch() and raw_read_seqcount_latch() should be used with latch sequence counters. Having *unique* read and write path APIs means that latch sequence counters are actually a data type of their own -- just inappropriately overloading plain seqcount_t. Introduce seqcount_latch_t. This adds type-safety and ensures that only the correct latch-safe APIs are to be used. Not to break bisection, let the latch APIs also accept plain seqcount_t or seqcount_raw_spinlock_t. After converting all call sites to seqcount_latch_t, only that new data type will be allowed. References: 9b0fd802 ("seqcount: Add raw_write_seqcount_latch()") References: 7fc26327 ("seqlock: Introduce raw_read_seqcount_latch()") References: aadd6e5c ("time/sched_clock: Use raw_read_seqcount_latch()") Signed-off-by:
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Ahmed S. Darwish authored
Commit eef1a429 ("mm/swap.c: piggyback lru_add_drain_all() calls") implemented an optimization mechanism to exit the to-be-started LRU drain operation (name it A) if another drain operation *started and finished* while (A) was blocked on the LRU draining mutex. This was done through a seqcount_t latch, which is an abuse of its semantics: 1. seqcount_t latching should be used for the purpose of switching between two storage places with sequence protection to allow interruptible, preemptible, writer sections. The referenced optimization mechanism has absolutely nothing to do with that. 2. The used raw_write_seqcount_latch() has two SMP write memory barriers to insure one consistent storage place out of the two storage places available. A full memory barrier is required instead: to guarantee that the pagevec counter stores visible by local CPU are visible to other CPUs -- before loading the current drain generation. Beside the seqcount_t API abuse, the semantics of a latch sequence counter was force-fitted into the referenced optimization. What was meant is to track "generations" of LRU draining operations, where "global lru draining generation = x" implies that all generations 0 < n <= x are already *scheduled* for draining -- thus nothing needs to be done if the current generation number n <= x. Remove the conceptually-inappropriate seqcount_t latch usage. Manually implement the referenced optimization using a counter and SMP memory barriers. Note, while at it, use the non-atomic variant of cpumask_set_cpu(), __cpumask_set_cpu(), due to the already existing mutex protection. Signed-off-by:
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Ahmed S. Darwish authored
sched_clock uses seqcount_t latching to switch between two storage places protected by the sequence counter. This allows it to have interruptible, NMI-safe, seqcount_t write side critical sections. Since 7fc26327 ("seqlock: Introduce raw_read_seqcount_latch()"), raw_read_seqcount_latch() became the standardized way for seqcount_t latch read paths. Due to the dependent load, it has one read memory barrier less than the currently used raw_read_seqcount() API. Use raw_read_seqcount_latch() for the suspend path. Commit aadd6e5c ("time/sched_clock: Use raw_read_seqcount_latch()") missed changing that instance of raw_read_seqcount(). References: 1809bfa4 ("timers, sched/clock: Avoid deadlock during read from NMI") Signed-off-by:
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- 26 Aug, 2020 25 commits
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Boqun Feng authored
Add a test case shows that USED_IN_*_READ and ENABLE_*_READ can cause deadlock too. Signed-off-by:
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Boqun Feng authored
Add two self test cases for the following case: P0: P1: P2: <in irq handler> spin_lock_irq(&slock) read_lock(&rwlock) write_lock_irq(&rwlock) read_lock(&rwlock) spin_lock(&slock) , which is a deadlock, as the read_lock() on P0 cannot get the lock because of the fairness. P0: P1: P2: <in irq handler> spin_lock(&slock) read_lock(&rwlock) write_lock(&rwlock) read_lock(&rwlock) spin_lock_irq(&slock) , which is not a deadlock, as the read_lock() on P0 can get the lock because it could use the unfair fastpass. Signed-off-by:
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Boqun Feng authored
This reverts commit d82fed75. Since we now could handle mixed read-write deadlock detection well, the self tests could be detected as expected, no need to use this work-around. Signed-off-by:
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Boqun Feng authored
Add those four test cases: 1. X --(ER)--> Y --(ER)--> Z --(ER)--> X is deadlock. 2. X --(EN)--> Y --(SR)--> Z --(ER)--> X is deadlock. 3. X --(EN)--> Y --(SR)--> Z --(SN)--> X is not deadlock. 4. X --(ER)--> Y --(SR)--> Z --(EN)--> X is not deadlock. Those self testcases are valuable for the development of supporting recursive read related deadlock detection. Signed-off-by:
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Boqun Feng authored
Now since we can handle recursive read related irq inversion deadlocks correctly, uncomment the irq_read_recursion2 and add more testcases. Signed-off-by:
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Boqun Feng authored
Currently, the chainkey of a lock chain is a hash sum of the class_idx of all the held locks, the read/write status are not taken in to consideration while generating the chainkey. This could result into a problem, if we have: P1() { read_lock(B); lock(A); } P2() { lock(A); read_lock(B); } P3() { lock(A); write_lock(B); } , and P1(), P2(), P3() run one by one. And when running P2(), lockdep detects such a lock chain A -> B is not a deadlock, then it's added in the chain cache, and then when running P3(), even if it's a deadlock, we could miss it because of the hit of chain cache. This could be confirmed by self testcase "chain cached mixed R-L/L-W ". To resolve this, we use concept "hlock_id" to generate the chainkey, the hlock_id is a tuple (hlock->class_idx, hlock->read), which fits in a u16 type. With this, the chainkeys are different is the lock sequences have the same locks but different read/write status. Besides, since we use "hlock_id" to generate chainkeys, the chain_hlocks array now store the "hlock_id"s rather than lock_class indexes. Signed-off-by: -
Boqun Feng authored
As our chain cache doesn't differ read/write locks, so even we can detect a read-lock/lock-write deadlock in check_noncircular(), we can still be fooled if a read-lock/lock-read case(which is not a deadlock) comes first. So introduce this test case to test specific to the chain cache behavior on detecting recursive read lock related deadlocks. Signed-off-by:
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Boqun Feng authored
Since we have all the fundamental to handle recursive read locks, we now add them into the dependency graph. Signed-off-by:
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Boqun Feng authored
Currently, in safe->unsafe detection, lockdep misses the fact that a LOCK_ENABLED_IRQ_*_READ usage and a LOCK_USED_IN_IRQ_*_READ usage may cause deadlock too, for example: P1 P2 <irq disabled> write_lock(l1); <irq enabled> read_lock(l2); write_lock(l2); <in irq> read_lock(l1); Actually, all of the following cases may cause deadlocks: LOCK_USED_IN_IRQ_* -> LOCK_ENABLED_IRQ_* LOCK_USED_IN_IRQ_*_READ -> LOCK_ENABLED_IRQ_* LOCK_USED_IN_IRQ_* -> LOCK_ENABLED_IRQ_*_READ LOCK_USED_IN_IRQ_*_READ -> LOCK_ENABLED_IRQ_*_READ To fix this, we need to 1) change the calculation of exclusive_mask() so that READ bits are not dropped and 2) always call usage() in mark_lock_irq() to check usage deadlocks, even when the new usage of the lock is READ. Besides, adjust usage_match() and usage_acculumate() to recursive read lock changes. Signed-off-by:
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Boqun Feng authored
check_redundant() will report redundancy if it finds a path could replace the about-to-add dependency in the BFS search. With recursive read lock changes, we certainly need to change the match function for the check_redundant(), because the path needs to match not only the lock class but also the dependency kinds. For example, if the about-to-add dependency @prev -> @next is A -(SN)-> B, and we find a path A -(S*)-> .. -(*R)->B in the dependency graph with __bfs() (for simplicity, we can also say we find an -(SR)-> path from A to B), we can not replace the dependency with that path in the BFS search. Because the -(SN)-> dependency can make a strong path with a following -(S*)-> dependency, however an -(SR)-> path cannot. Further, we can replace an -(SN)-> dependency with a -(EN)-> path, that means if we find a path which is stronger than or equal to the about-to-add dependency, we can report the redundancy. By "stronger", it means both the start and the end of the path are not weaker than the start and the end of the dependency (E is "stronger" than S and N is "stronger" than R), so that we can replace the dependency with that path. To make sure we find a path whose start point is not weaker than the about-to-add dependency, we use a trick: the ->only_xr of the root (start point) of __bfs() is initialized as @prev-> == 0, therefore if @prev is E, __bfs() will pick only -(E*)-> for the first dependency, otherwise, __bfs() can pick -(E*)-> or -(S*)-> for the first dependency. To make sure we find a path whose end point is not weaker than the about-to-add dependency, we replace the match function for __bfs() check_redundant(), we check for the case that either @next is R (anything is not weaker than it) or the end point of the path is N (which is not weaker than anything). Signed-off-by:
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Boqun Feng authored
Currently, lockdep only has limit support for deadlock detection for recursive read locks. This patch support deadlock detection for recursive read locks. The basic idea is: We are about to add dependency B -> A in to the dependency graph, we use check_noncircular() to find whether we have a strong dependency path A -> .. -> B so that we have a strong dependency circle (a closed strong dependency path): A -> .. -> B -> A , which doesn't have two adjacent dependencies as -(*R)-> L -(S*)->. Since A -> .. -> B is already a strong dependency path, so if either B -> A is -(E*)-> or A -> .. -> B is -(*N)->, the circle A -> .. -> B -> A is strong, otherwise not. So we introduce a new match function hlock_conflict() to replace the class_equal() for the deadlock check in check_noncircular(). Signed-off-by:
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Boqun Feng authored
The "match" parameter of __bfs() is used for checking whether we hit a match in the search, therefore it should return a boolean value rather than an integer for better readability. This patch then changes the return type of the function parameter and the match functions to bool. Suggested-by:
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Boqun Feng authored
Now we have four types of dependencies in the dependency graph, and not all the pathes carry real dependencies (the dependencies that may cause a deadlock), for example: Given lock A and B, if we have: CPU1 CPU2 ============= ============== write_lock(A); read_lock(B); read_lock(B); write_lock(A); (assuming read_lock(B) is a recursive reader) then we have dependencies A -(ER)-> B, and B -(SN)-> A, and a dependency path A -(ER)-> B -(SN)-> A. In lockdep w/o recursive locks, a dependency path from A to A means a deadlock. However, the above case is obviously not a deadlock, because no one holds B exclusively, therefore no one waits for the other to release B, so who get A first in CPU1 and CPU2 will run non-blockingly. As a result, dependency path A -(ER)-> B -(SN)-> A is not a real/strong dependency that could cause a deadlock. From the observation above, we know that for a dependency path to be real/strong, no two adjacent dependencies can be as -(*R)-> -(S*)->. Now our mission is to make __bfs() traverse only the strong dependency paths, which is simple: we record whether we only have -(*R)-> for the previous lock_list of the path in lock_list::only_xr, and when we pick a dependency in the traverse, we 1) filter out -(S*)-> dependency if the previous lock_list only has -(*R)-> dependency (i.e. ->only_xr is true) and 2) set the next lock_list::only_xr to true if we only have -(*R)-> left after we filter out dependencies based on 1), otherwise, set it to false. With this extension for __bfs(), we now need to initialize the root of __bfs() properly (with a correct ->only_xr), to do so, we introduce some helper functions, which also cleans up a little bit for the __bfs() root initialization code. Signed-off-by:
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Boqun Feng authored
To add recursive read locks into the dependency graph, we need to store the types of dependencies for the BFS later. There are four types of dependencies: * Exclusive -> Non-recursive dependencies: EN e.g. write_lock(prev) held and try to acquire write_lock(next) or non-recursive read_lock(next), which can be represented as "prev -(EN)-> next" * Shared -> Non-recursive dependencies: SN e.g. read_lock(prev) held and try to acquire write_lock(next) or non-recursive read_lock(next), which can be represented as "prev -(SN)-> next" * Exclusive -> Recursive dependencies: ER e.g. write_lock(prev) held and try to acquire recursive read_lock(next), which can be represented as "prev -(ER)-> next" * Shared -> Recursive dependencies: SR e.g. read_lock(prev) held and try to acquire recursive read_lock(next), which can be represented as "prev -(SR)-> next" So we use 4 bits for the presence of each type in lock_list::dep. Helper functions and macros are also introduced to convert a pair of locks into lock_list::dep bit and maintain the addition of different types of dependencies. Signed-off-by:
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Boqun Feng authored
lock_list::distance is always not greater than MAX_LOCK_DEPTH (which is 48 right now), so a u16 will fit. This patch reduces the size of lock_list::distance to save space, so that we can introduce other fields to help detect recursive read lock deadlocks without increasing the size of lock_list structure. Suggested-by:
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Boqun Feng authored
Currently, __bfs() will do a breadth-first search in the dependency graph and visit each lock class in the graph exactly once, so for example, in the following graph: A ---------> B | ^ | | +----------> C a __bfs() call starts at A, will visit B through dependency A -> B and visit C through dependency A -> C and that's it, IOW, __bfs() will not visit dependency C -> B. This is OK for now, as we only have strong dependencies in the dependency graph, so whenever there is a traverse path from A to B in __bfs(), it means A has strong dependencies to B (IOW, B depends on A strongly). So no need to visit all dependencies in the graph. However, as we are going to add recursive-read lock into the dependency graph, as a result, not all the paths mean strong dependencies, in the same example above, dependency A -> B may be a weak dependency and traverse A -> C -> B may be a strong dependency path. And with the old way of __bfs() (i.e. visiting every lock class exactly once), we will miss the strong dependency path, which will result into failing to find a deadlock. To cure this for the future, we need to find a way for __bfs() to visit each dependency, rather than each class, exactly once in the search until we find a match. The solution is simple: We used to mark lock_class::lockdep_dependency_gen_id to indicate a class has been visited in __bfs(), now we change the semantics a little bit: we now mark lock_class::lockdep_dependency_gen_id to indicate _all the dependencies_ in its lock_{after,before} have been visited in the __bfs() (note we only take one direction in a __bfs() search). In this way, every dependency is guaranteed to be visited until we find a match. Note: the checks in mark_lock_accessed() and lock_accessed() are removed, because after this modification, we may call these two functions on @source_entry of __bfs(), which may not be the entry in "list_entries" Signed-off-by: -
Boqun Feng authored
__bfs() could return four magic numbers: 1: search succeeds, but none match. 0: search succeeds, find one match. -1: search fails because of the cq is full. -2: search fails because a invalid node is found. This patch cleans things up by using a enum type for the return value of __bfs() and its friends, this improves the code readability of the code, and further, could help if we want to extend the BFS. Signed-off-by:
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Boqun Feng authored
This patch add the documentation piece for the reasoning of deadlock detection related to recursive read lock. The following sections are added: * Explain what is a recursive read lock, and what deadlock cases they could introduce. * Introduce the notations for different types of dependencies, and the definition of strong paths. * Proof for a closed strong path is both sufficient and necessary for deadlock detections with recursive read locks involved. The proof could also explain why we call the path "strong" Signed-off-by:
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Boqun Feng authored
On the archs using QUEUED_RWLOCKS, read_lock() is not always a recursive read lock, actually it's only recursive if in_interrupt() is true. So change the annotation accordingly to catch more deadlocks. Note we used to treat read_lock() as pure recursive read locks in lib/locking-seftest.c, and this is useful, especially for the lockdep development selftest, so we keep this via a variable to force switching lock annotation for read_lock(). Signed-off-by:
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Marta Rybczynska authored
Fix issues with local_locks documentation: - fix function names, local_lock.h has local_unlock_irqrestore(), not local_lock_irqrestore() - fix mapping table, local_unlock_irqrestore() maps to local_irq_restore(), not _save() Signed-off-by:
Marta Rybczynska <rybczynska@gmail.com> Signed-off-by:
Will Deacon <will@kernel.org> Link: https://lkml.kernel.org/r/CAApg2=SKxQ3Sqwj6TZnV-0x0cKLXFKDaPvXT4N15MPDMKq724g@mail.gmail.com
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Randy Dunlap authored
Fix kernel-doc warnings in <linux/seqlock.h>. ../include/linux/seqlock.h:152: warning: Incorrect use of kernel-doc format: * seqcount_LOCKNAME_init() - runtime initializer for seqcount_LOCKNAME_t ../include/linux/seqlock.h:164: warning: Incorrect use of kernel-doc format: * SEQCOUNT_LOCKTYPE() - Instantiate seqcount_LOCKNAME_t and helpers ../include/linux/seqlock.h:229: warning: Function parameter or member 'seq_name' not described in 'SEQCOUNT_LOCKTYPE_ZERO' ../include/linux/seqlock.h:229: warning: Function parameter or member 'assoc_lock' not described in 'SEQCOUNT_LOCKTYPE_ZERO' ../include/linux/seqlock.h:229: warning: Excess function parameter 'name' description in 'SEQCOUNT_LOCKTYPE_ZERO' ../include/linux/seqlock.h:229: warning: Excess function parameter 'lock' description in 'SEQCOUNT_LOCKTYPE_ZERO' ../include/linux/seqlock.h:695: warning: duplicate section name 'NOTE' Demote kernel-doc notation for the macros "seqcount_LOCKNAME_init()" and "SEQCOUNT_LOCKTYPE()"; scripts/kernel-doc does not handle them correctly. Rename function parameters in SEQCNT_LOCKNAME_ZERO() documentation to match the macro's argument names. Change the macro name in the documentation to SEQCOUNT_LOCKTYPE_ZERO() to match the macro's name. For raw_write_seqcount_latch(), rename the second NOTE: to NOTE2: to prevent a kernel-doc warning. However, the generated output is not quite as nice as it could be for this. Fix a typo: s/LOCKTYPR/LOCKTYPE/ Fixes: 0efc94c5 ("seqcount: Compress SEQCNT_LOCKNAME_ZERO()") Fixes: e4e9ab3f ("seqlock: Fold seqcount_LOCKNAME_init() definition") Fixes: a8772dcc ("seqlock: Fold seqcount_LOCKNAME_t definition") Reported-by:
kernel test robot <lkp@intel.com> Signed-off-by:
Randy Dunlap <rdunlap@infradead.org> Signed-off-by:
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Peter Zijlstra authored
David requested means to obtain the old/previous value from the refcount API for tracing purposes. Duplicate (most of) the API as __refcount*() with an additional 'int *' argument into which, if !NULL, the old value will be stored. Requested-by:
David Howells <dhowells@redhat.com> Signed-off-by:
Kees Cook <keescook@chromium.org> Link: https://lkml.kernel.org/r/20200729111120.GA2638@hirez.programming.kicks-ass.net
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Peter Zijlstra authored
Such that we might easily find seqcount_LOCKTYPE_t and seqcount_LOCKTYPE_init(). Signed-off-by:
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Peter Zijlstra authored
The lockdep tracepoints are under the lockdep recursion counter, this has a bunch of nasty side effects: - TRACE_IRQFLAGS doesn't work across the entire tracepoint - RCU-lockdep doesn't see the tracepoints either, hiding numerous "suspicious RCU usage" warnings. Pull the trace_lock_*() tracepoints completely out from under the lockdep recursion handling and completely rely on the trace level recusion handling -- also, tracing *SHOULD* not be taking locks in any case. Signed-off-by:
Steven Rostedt (VMware) <rostedt@goodmis.org> Reviewed-by:
Thomas Gleixner <tglx@linutronix.de> Acked-by:
Rafael J. Wysocki <rafael.j.wysocki@intel.com> Tested-by:
Marco Elver <elver@google.com> Link: https://lkml.kernel.org/r/20200821085348.782688941@infradead.org
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Nicholas Piggin authored
Problem: raw_local_irq_save(); // software state on local_irq_save(); // software state off ... local_irq_restore(); // software state still off, because we don't enable IRQs raw_local_irq_restore(); // software state still off, *whoopsie* existing instances: - lock_acquire() raw_local_irq_save() __lock_acquire() arch_spin_lock(&graph_lock) pv_wait() := kvm_wait() (same or worse for Xen/HyperV) local_irq_save() - trace_clock_global() raw_local_irq_save() arch_spin_lock() pv_wait() := kvm_wait() local_irq_save() - apic_retrigger_irq() raw_local_irq_save() apic->send_IPI() := default_send_IPI_single_phys() local_irq_save() Possible solutions: A) make it work by enabling the tracing inside raw_*() B) make it work by keeping tracing disabled inside raw_*() C) call it broken and clean it up now Now, given that the only reason to use the raw_* variant is because you don't want tracing. Therefore A) seems like a weird option (although it can be done). C) is tempting, but OTOH it ends up converting a _lot_ of code to raw just because there is one raw user, this strips the validation/tracing off for all the other users. So we pick B) and declare any code that ends up doing: raw_local_irq_save() local_irq_save() lockdep_assert_irqs_disabled(); broken. AFAICT this problem has existed forever, the only reason it came up is because commit: 859d069e ("lockdep: Prepare for NMI IRQ state tracking") changed IRQ tracing vs lockdep recursion and the first instance is fairly common, the other cases hardly ever happen. Signed-off-by:Nicholas Piggin <npiggin@gmail.com> [rewrote changelog] Signed-off-by:
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