golang的锁是什么级别的锁

通常而言，操作系统会提供多种同步机制，常见的包括的原子操作、自旋锁、互斥锁。相较于自旋锁，互斥锁是我们在日常开发中最常使用的锁。操作系统提供的互斥锁状态变化时阻塞和唤醒影响的是操作系统级别的最小执行流–线程。因此，我在这里比较粗糙地称呼操作系统提供的锁或者编程语言基于系统调用封装的锁为线程级别的锁。

那么golang的锁呢？我们知道golang中最小的执行流为goroutine，并且在runtime中完整地实现了基于goroutine的调度机制。那么golang的锁在是什么级别的锁呢？获取锁时是会阻塞线程，还是仅会阻塞协程？下面我们以sync.Mutex为例来看下其实现。

加锁

sync.Mutex在加锁时会尝试自旋提前占位，自旋是发生在用户态的，直接跳过自旋部分，来到我关注的地方：sync/Mutex.go 171 runtime_SemacquireMutex调用。

// If we were already waiting before, queue at the front of the queue.
queueLifo := waitStartTime != 0
if waitStartTime == 0 {waitStartTime = runtime_nanotime()
}
runtime_SemacquireMutex(&m.sema, queueLifo, 1)

看runtime_SemacquireMutex的注释，runtime_SemacquireMutex的作用和runtime_Semacquire基本一样，都会阻塞地等待，直到信号量的值(传入的s参数)大于0，然后将值减少。从这点上讲，和linux提供的信号量的功能描述基本上是一致的。

runtime_SemacquireMutex相比runtime_Semacquire还多了两个参数。lifo参数会影响阻塞队列的行为，当lifo为true时，会将当前执行流(这里我们还没确定是goroutine还是线程)置于等待队列的头部，后入先出嘛，对不对。skipframes是跳过的调用栈的层数，看起来是在调试或者观测时起作用，我们不去深究。

// Semacquire waits until *s > 0 and then atomically decrements it.
// It is intended as a simple sleep primitive for use by the synchronization
// library and should not be used directly.
func runtime_Semacquire(s *uint32)// SemacquireMutex is like Semacquire, but for profiling contended Mutexes.
// If lifo is true, queue waiter at the head of wait queue.
// skipframes is the number of frames to omit during tracing, counting from
// runtime_SemacquireMutex's caller.
func runtime_SemacquireMutex(s *uint32, lifo bool, skipframes int)

sync_runtime_SemacquireMutex调用了semacquire1函数。semacquire1除了信号量、lifo、skipframs参数外，还多了一个profile参数，其值有semaBlockProfile和semaMutexProfile。看这个两个值，应该和pprof的mutex和block有关系？这里同样不去深究，保证主线，后面有空再看。

//go:linkname sync_runtime_SemacquireMutex sync.runtime_SemacquireMutex
func sync_runtime_SemacquireMutex(addr *uint32, lifo bool, skipframes int) {semacquire1(addr, lifo, semaBlockProfile|semaMutexProfile, skipframes)
}func semacquire1(addr *uint32, lifo bool, profile semaProfileFlags, skipframes int) {}

进入semacquire1方法，我们的疑问似乎要得到解答了。

首先会尝试获取锁，easy path，如果成功，就直接返回。
构建sudog，并且根据传入信号量的地址获取到对应的阻塞队列。
如果不能获取锁，就将sudog加入到root的阻塞队列中，同时调用gopark阻塞当前goroutine。

看到这里，我们应该差不多确定golang的sync.Mutex阻塞的是goroutine。当获取锁时，如果抢占失败，会将当前的goroutine阻塞，挂起到锁的阻塞队列上。但是问题似乎不是这么简单，因为root对象也有锁并且有加锁解锁的行为。那我们再来看看其实现是怎样的。也就是在实现sync.Mutex过程中会遇到临界区的问题，这种情况下通常的做法是采用更底层的同步机制取解决，比如原子操作，比如操作系统的锁。

func semacquire1(addr *uint32, lifo bool, profile semaProfileFlags, skipframes int) {gp := getg()if gp != gp.m.curg {throw("semacquire not on the G stack")}// Easy case.if cansemacquire(addr) {return}// Harder case:// increment waiter count// try cansemacquire one more time, return if succeeded// enqueue itself as a waiter// sleep// (waiter descriptor is dequeued by signaler)s := acquireSudog()root := semtable.rootFor(addr)t0 := int64(0)s.releasetime = 0s.acquiretime = 0s.ticket = 0if profile&semaBlockProfile != 0 && blockprofilerate > 0 {t0 = cputicks()s.releasetime = -1}if profile&semaMutexProfile != 0 && mutexprofilerate > 0 {if t0 == 0 {t0 = cputicks()}s.acquiretime = t0}for {lockWithRank(&root.lock, lockRankRoot)// Add ourselves to nwait to disable "easy case" in semrelease.atomic.Xadd(&root.nwait, 1)// Check cansemacquire to avoid missed wakeup.if cansemacquire(addr) {atomic.Xadd(&root.nwait, -1)unlock(&root.lock)break}// Any semrelease after the cansemacquire knows we're waiting// (we set nwait above), so go to sleep.root.queue(addr, s, lifo)goparkunlock(&root.lock, waitReasonSemacquire, traceEvGoBlockSync, 4+skipframes)if s.ticket != 0 || cansemacquire(addr) {break}}if s.releasetime > 0 {blockevent(s.releasetime-t0, 3+skipframes)}releaseSudog(s)
}

接下来看下sematable相关的内容，也就是信号量相关的实现。信号量本身只是一个整数，对其操作只需要原子操作就OK，非常简单。但抢占信号量失败需要阻塞队列，同一个阻塞队列会面临并发访问，这是sematable的实现解决的问题。

semaTable是一个初始化好的长度为251的数组，数组的元素为semaRoot。

数组的实现可以认为是分片数为251的分段锁。操作时根据对应信号量的地址取模拿到对应的semaRoot，以此减少临界区的粒度。

var semtable semTable// Prime to not correlate with any user patterns.
const semTabSize = 251type semTable [semTabSize]struct {root semaRootpad  [cpu.CacheLinePadSize - unsafe.Sizeof(semaRoot{})]byte
}func (t *semTable) rootFor(addr *uint32) *semaRoot {return &t[(uintptr(unsafe.Pointer(addr))>>3)%semTabSize].root
}

semaRoot是真正的阻塞队列。每个semaRoot对应一组信号量，这组信号量的addr%251的值相等。阻塞在同一信号量上的goroutine以链表的形式组织，阻塞同一semaRoot中不同信号量的goroutine之间以平衡二叉树(红黑or二叉)的形式组织。

semaRoot就是一个临界区，golang使用rumtime2.go中的mutex进行并发保护。

// A semaRoot holds a balanced tree of sudog with distinct addresses (s.elem).
// Each of those sudog may in turn point (through s.waitlink) to a list
// of other sudogs waiting on the same address.
// The operations on the inner lists of sudogs with the same address
// are all O(1). The scanning of the top-level semaRoot list is O(log n),
// where n is the number of distinct addresses with goroutines blocked
// on them that hash to the given semaRoot.
// See golang.org/issue/17953 for a program that worked badly
// before we introduced the second level of list, and
// BenchmarkSemTable/OneAddrCollision/* for a benchmark that exercises this.
type semaRoot struct {lock  mutextreap *sudog // root of balanced tree of unique waiters.nwait uint32 // Number of waiters. Read w/o the lock.
}

看注释，rumtime2.go中的mutex在有竞争的条件下是内核级别的锁，on the contention path they sleep in the kernel，会导致内核级的阻塞。

// Mutual exclusion locks.  In the uncontended case,
// as fast as spin locks (just a few user-level instructions),
// but on the contention path they sleep in the kernel.
// A zeroed Mutex is unlocked (no need to initialize each lock).
// Initialization is helpful for static lock ranking, but not required.
type mutex struct {// Empty struct if lock ranking is disabled, otherwise includes the lock ranklockRankStruct// Futex-based impl treats it as uint32 key,// while sema-based impl as M* waitm.// Used to be a union, but unions break precise GC.key uintptr
}

mutex的实现没有采用oop的方式，runtime2.go中同时提供了lock2和unlock2两个函数来对mutex来进行加锁和解锁。

先看加锁的实现。

首先会确保当前运行的m上创建一个锁和一个condition，这两个对象都是调用c库函数实现，为线程级别的对象。然后尝试自旋获取mutex。如果获取成功，则正常返回；否则，将当前的m加入到阻塞队列的最前端，mutex的key值为阻塞队列首个m的指针，然后调用semasleep方法。

func lock2(l *mutex) {gp := getg()if gp.m.locks < 0 {throw("runtime·lock: lock count")}gp.m.locks++// Speculative grab for lock.if atomic.Casuintptr(&l.key, 0, locked) {return}semacreate(gp.m)// On uniprocessor's, no point spinning.// On multiprocessors, spin for ACTIVE_SPIN attempts.spin := 0if ncpu > 1 {spin = active_spin}
Loop:for i := 0; ; i++ {v := atomic.Loaduintptr(&l.key)if v&locked == 0 {// Unlocked. Try to lock.if atomic.Casuintptr(&l.key, v, v|locked) {return}i = 0}if i < spin {procyield(active_spin_cnt)} else if i < spin+passive_spin {osyield()} else {// Someone else has it.// l->waitm points to a linked list of M's waiting// for this lock, chained through m->nextwaitm.// Queue this M.for {gp.m.nextwaitm = muintptr(v &^ locked)if atomic.Casuintptr(&l.key, v, uintptr(unsafe.Pointer(gp.m))|locked) {break}v = atomic.Loaduintptr(&l.key)if v&locked == 0 {continue Loop}}if v&locked != 0 {// Queued. Wait.semasleep(-1)i = 0}}}
}

semasleep方法是将当前的线程阻塞的方法，其使用了condition来进行调度。当前会阻塞直至condition被唤醒，或者在传入的睡眠时间大于等于0，则只睡眠传入的时间间隔。当由mutex解锁时，会从其阻塞队列中获取m，并唤醒其condition。

func semasleep(ns int64) int32 {var start int64if ns >= 0 {start = nanotime()}mp := getg().mpthread_mutex_lock(&mp.mutex)for {if mp.count > 0 {mp.count--pthread_mutex_unlock(&mp.mutex)return 0}if ns >= 0 {spent := nanotime() - startif spent >= ns {pthread_mutex_unlock(&mp.mutex)return -1}var t timespect.setNsec(ns - spent)err := pthread_cond_timedwait_relative_np(&mp.cond, &mp.mutex, &t)if err == _ETIMEDOUT {pthread_mutex_unlock(&mp.mutex)return -1}} else {pthread_cond_wait(&mp.cond, &mp.mutex)}}
}

解锁时，如果当前的阻塞队列不为空，则唤醒头部的m。同时将当前线程持有的锁的数量减少，只有当前线程持有的锁的数量为0时，才可以对当前线程中运行的goroutine进行调度。

func unlock2(l *mutex) {gp := getg()var mp *mfor {v := atomic.Loaduintptr(&l.key)if v == locked {if atomic.Casuintptr(&l.key, locked, 0) {break}} else {// Other M's are waiting for the lock.// Dequeue an M.mp = muintptr(v &^ locked).ptr()if atomic.Casuintptr(&l.key, v, uintptr(mp.nextwaitm)) {// Dequeued an M.  Wake it.semawakeup(mp)break}}}gp.m.locks--if gp.m.locks < 0 {throw("runtime·unlock: lock count")}if gp.m.locks == 0 && gp.preempt { // restore the preemption request in case we've cleared it in newstackgp.stackguard0 = stackPreempt}
}

解锁

// Semrelease atomically increments *s and notifies a waiting goroutine
// if one is blocked in Semacquire.
// It is intended as a simple wakeup primitive for use by the synchronization
// library and should not be used directly.
// If handoff is true, pass count directly to the first waiter.
// skipframes is the number of frames to omit during tracing, counting from
// runtime_Semrelease's caller.
func runtime_Semrelease(s *uint32, handoff bool, skipframes int) {}//go:linkname sync_runtime_Semrelease sync.runtime_Semrelease
func sync_runtime_Semrelease(addr *uint32, handoff bool, skipframes int) {semrelease1(addr, handoff, skipframes)
}

解锁相对比较简单，从阻塞队列中取出sudog，并将其置为ready状态。

func semrelease1(addr *uint32, handoff bool, skipframes int) {root := semtable.rootFor(addr)atomic.Xadd(addr, 1)// Easy case: no waiters?// This check must happen after the xadd, to avoid a missed wakeup// (see loop in semacquire).if atomic.Load(&root.nwait) == 0 {return}// Harder case: search for a waiter and wake it.lockWithRank(&root.lock, lockRankRoot)if atomic.Load(&root.nwait) == 0 {// The count is already consumed by another goroutine,// so no need to wake up another goroutine.unlock(&root.lock)return}s, t0 := root.dequeue(addr)if s != nil {atomic.Xadd(&root.nwait, -1)}unlock(&root.lock)if s != nil { // May be slow or even yield, so unlock firstacquiretime := s.acquiretimeif acquiretime != 0 {mutexevent(t0-acquiretime, 3+skipframes)}if s.ticket != 0 {throw("corrupted semaphore ticket")}if handoff && cansemacquire(addr) {s.ticket = 1}readyWithTime(s, 5+skipframes)if s.ticket == 1 && getg().m.locks == 0 {// Direct G handoff// readyWithTime has added the waiter G as runnext in the// current P; we now call the scheduler so that we start running// the waiter G immediately.// Note that waiter inherits our time slice: this is desirable// to avoid having a highly contended semaphore hog the P// indefinitely. goyield is like Gosched, but it emits a// "preempted" trace event instead and, more importantly, puts// the current G on the local runq instead of the global one.// We only do this in the starving regime (handoff=true), as in// the non-starving case it is possible for a different waiter// to acquire the semaphore while we are yielding/scheduling,// and this would be wasteful. We wait instead to enter starving// regime, and then we start to do direct handoffs of ticket and// P.// See issue 33747 for discussion.goyield()}}
}