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670e9f34ee
Remove many duplicated words under Documentation/ and do other small
cleanups.
Examples:
"and and" --> "and"
"in in" --> "in"
"the the" --> "the"
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...
Signed-off-by: Paolo Ornati <ornati@fastwebnet.it>
Signed-off-by: Adrian Bunk <bunk@stusta.de>
195 lines
8.8 KiB
Plaintext
195 lines
8.8 KiB
Plaintext
An ad-hoc collection of notes on IA64 MCA and INIT processing. Feel
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free to update it with notes about any area that is not clear.
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---
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MCA/INIT are completely asynchronous. They can occur at any time, when
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the OS is in any state. Including when one of the cpus is already
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holding a spinlock. Trying to get any lock from MCA/INIT state is
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asking for deadlock. Also the state of structures that are protected
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by locks is indeterminate, including linked lists.
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---
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The complicated ia64 MCA process. All of this is mandated by Intel's
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specification for ia64 SAL, error recovery and unwind, it is not as
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if we have a choice here.
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* MCA occurs on one cpu, usually due to a double bit memory error.
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This is the monarch cpu.
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* SAL sends an MCA rendezvous interrupt (which is a normal interrupt)
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to all the other cpus, the slaves.
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* Slave cpus that receive the MCA interrupt call down into SAL, they
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end up spinning disabled while the MCA is being serviced.
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* If any slave cpu was already spinning disabled when the MCA occurred
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then it cannot service the MCA interrupt. SAL waits ~20 seconds then
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sends an unmaskable INIT event to the slave cpus that have not
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already rendezvoused.
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* Because MCA/INIT can be delivered at any time, including when the cpu
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is down in PAL in physical mode, the registers at the time of the
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event are _completely_ undefined. In particular the MCA/INIT
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handlers cannot rely on the thread pointer, PAL physical mode can
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(and does) modify TP. It is allowed to do that as long as it resets
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TP on return. However MCA/INIT events expose us to these PAL
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internal TP changes. Hence curr_task().
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* If an MCA/INIT event occurs while the kernel was running (not user
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space) and the kernel has called PAL then the MCA/INIT handler cannot
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assume that the kernel stack is in a fit state to be used. Mainly
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because PAL may or may not maintain the stack pointer internally.
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Because the MCA/INIT handlers cannot trust the kernel stack, they
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have to use their own, per-cpu stacks. The MCA/INIT stacks are
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preformatted with just enough task state to let the relevant handlers
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do their job.
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* Unlike most other architectures, the ia64 struct task is embedded in
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the kernel stack[1]. So switching to a new kernel stack means that
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we switch to a new task as well. Because various bits of the kernel
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assume that current points into the struct task, switching to a new
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stack also means a new value for current.
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* Once all slaves have rendezvoused and are spinning disabled, the
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monarch is entered. The monarch now tries to diagnose the problem
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and decide if it can recover or not.
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* Part of the monarch's job is to look at the state of all the other
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tasks. The only way to do that on ia64 is to call the unwinder,
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as mandated by Intel.
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* The starting point for the unwind depends on whether a task is
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running or not. That is, whether it is on a cpu or is blocked. The
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monarch has to determine whether or not a task is on a cpu before it
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knows how to start unwinding it. The tasks that received an MCA or
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INIT event are no longer running, they have been converted to blocked
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tasks. But (and its a big but), the cpus that received the MCA
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rendezvous interrupt are still running on their normal kernel stacks!
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* To distinguish between these two cases, the monarch must know which
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tasks are on a cpu and which are not. Hence each slave cpu that
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switches to an MCA/INIT stack, registers its new stack using
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set_curr_task(), so the monarch can tell that the _original_ task is
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no longer running on that cpu. That gives us a decent chance of
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getting a valid backtrace of the _original_ task.
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* MCA/INIT can be nested, to a depth of 2 on any cpu. In the case of a
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nested error, we want diagnostics on the MCA/INIT handler that
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failed, not on the task that was originally running. Again this
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requires set_curr_task() so the MCA/INIT handlers can register their
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own stack as running on that cpu. Then a recursive error gets a
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trace of the failing handler's "task".
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[1] My (Keith Owens) original design called for ia64 to separate its
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struct task and the kernel stacks. Then the MCA/INIT data would be
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chained stacks like i386 interrupt stacks. But that required
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radical surgery on the rest of ia64, plus extra hard wired TLB
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entries with its associated performance degradation. David
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Mosberger vetoed that approach. Which meant that separate kernel
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stacks meant separate "tasks" for the MCA/INIT handlers.
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---
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INIT is less complicated than MCA. Pressing the nmi button or using
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the equivalent command on the management console sends INIT to all
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cpus. SAL picks one of the cpus as the monarch and the rest are
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slaves. All the OS INIT handlers are entered at approximately the same
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time. The OS monarch prints the state of all tasks and returns, after
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which the slaves return and the system resumes.
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At least that is what is supposed to happen. Alas there are broken
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versions of SAL out there. Some drive all the cpus as monarchs. Some
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drive them all as slaves. Some drive one cpu as monarch, wait for that
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cpu to return from the OS then drive the rest as slaves. Some versions
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of SAL cannot even cope with returning from the OS, they spin inside
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SAL on resume. The OS INIT code has workarounds for some of these
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broken SAL symptoms, but some simply cannot be fixed from the OS side.
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---
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The scheduler hooks used by ia64 (curr_task, set_curr_task) are layer
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violations. Unfortunately MCA/INIT start off as massive layer
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violations (can occur at _any_ time) and they build from there.
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At least ia64 makes an attempt at recovering from hardware errors, but
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it is a difficult problem because of the asynchronous nature of these
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errors. When processing an unmaskable interrupt we sometimes need
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special code to cope with our inability to take any locks.
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---
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How is ia64 MCA/INIT different from x86 NMI?
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* x86 NMI typically gets delivered to one cpu. MCA/INIT gets sent to
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all cpus.
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* x86 NMI cannot be nested. MCA/INIT can be nested, to a depth of 2
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per cpu.
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* x86 has a separate struct task which points to one of multiple kernel
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stacks. ia64 has the struct task embedded in the single kernel
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stack, so switching stack means switching task.
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* x86 does not call the BIOS so the NMI handler does not have to worry
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about any registers having changed. MCA/INIT can occur while the cpu
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is in PAL in physical mode, with undefined registers and an undefined
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kernel stack.
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* i386 backtrace is not very sensitive to whether a process is running
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or not. ia64 unwind is very, very sensitive to whether a process is
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running or not.
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---
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What happens when MCA/INIT is delivered what a cpu is running user
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space code?
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The user mode registers are stored in the RSE area of the MCA/INIT on
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entry to the OS and are restored from there on return to SAL, so user
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mode registers are preserved across a recoverable MCA/INIT. Since the
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OS has no idea what unwind data is available for the user space stack,
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MCA/INIT never tries to backtrace user space. Which means that the OS
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does not bother making the user space process look like a blocked task,
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i.e. the OS does not copy pt_regs and switch_stack to the user space
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stack. Also the OS has no idea how big the user space RSE and memory
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stacks are, which makes it too risky to copy the saved state to a user
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mode stack.
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---
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How do we get a backtrace on the tasks that were running when MCA/INIT
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was delivered?
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mca.c:::ia64_mca_modify_original_stack(). That identifies and
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verifies the original kernel stack, copies the dirty registers from
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the MCA/INIT stack's RSE to the original stack's RSE, copies the
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skeleton struct pt_regs and switch_stack to the original stack, fills
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in the skeleton structures from the PAL minstate area and updates the
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original stack's thread.ksp. That makes the original stack look
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exactly like any other blocked task, i.e. it now appears to be
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sleeping. To get a backtrace, just start with thread.ksp for the
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original task and unwind like any other sleeping task.
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---
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How do we identify the tasks that were running when MCA/INIT was
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delivered?
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If the previous task has been verified and converted to a blocked
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state, then sos->prev_task on the MCA/INIT stack is updated to point to
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the previous task. You can look at that field in dumps or debuggers.
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To help distinguish between the handler and the original tasks,
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handlers have _TIF_MCA_INIT set in thread_info.flags.
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The sos data is always in the MCA/INIT handler stack, at offset
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MCA_SOS_OFFSET. You can get that value from mca_asm.h or calculate it
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as KERNEL_STACK_SIZE - sizeof(struct pt_regs) - sizeof(struct
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ia64_sal_os_state), with 16 byte alignment for all structures.
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Also the comm field of the MCA/INIT task is modified to include the pid
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of the original task, for humans to use. For example, a comm field of
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'MCA 12159' means that pid 12159 was running when the MCA was
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delivered.
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