31 KiB
Interrupts and Interrupt Handling. Part 1.
Introduction
This is the first part of the new chapter of the linux insides book. We have come a long way in the previous chapter of this book. We started from the earliest steps of kernel initialization and finished with the launch of the first init process. Yes, we saw several initialization steps which are related to the various kernel subsystems. But we did not dig deep into the details of these subsystems. With this chapter, we will try to understand how the various kernel subsystems work and how they are implemented. As you can already understand from the chapter's title, the first subsystem will be interrupts.
What is an Interrupt?
We have already heard of the word interrupt in several parts of this book. We even saw a couple of examples of interrupt handlers. In the current chapter we will start from the theory, i.e.
- What are
interrupts? - What are
interrupt handlers?
We will then continue to dig deeper into the details of interrupts and how the Linux kernel handles them.
The first question that arises in our mind when we come across word interrupt is What is an interrupt? An interrupt is an event raised by software or hardware when it needs the CPU's attention. For example, we press a button on the keyboard and what do we expect next? What should the operating system and computer do after this? To simplify matters, assume that each peripheral device has an interrupt line to the CPU. A device can use it to signal an interrupt to the CPU. However, interrupts are not signaled directly to the CPU. In the old machines there was a PIC which is a chip responsible for sequentially processing multiple interrupt requests from multiple devices. In the new machines there is an Advanced Programmable Interrupt Controller commonly known as - APIC. An APIC consists of two separate devices:
Local APICI/O APIC
The first - Local APIC is located on each CPU core. The local APIC is responsible for handling the CPU-specific interrupt configuration. The local APIC is usually used to manage interrupts from the APIC-timer, thermal sensor and any other such locally connected I/O devices.
The second - I/O APIC provides multi-processor interrupt management. It is used to distribute external interrupts among the CPU cores. More about the local and I/O APICs will be covered later in this chapter. As you can understand, interrupts can occur at any time. When an interrupt occurs, the operating system must handle it immediately. But what does it mean to handle an interrupt? When an interrupt occurs, the operating system must ensure the following steps:
- The kernel must pause execution of the current process; (preempt current task);
- The kernel must search for the handler of the interrupt and transfer control (execute interrupt handler);
- After the interrupt handler completes execution, the interrupted process can resume execution.
Of course there are numerous intricacies involved in this procedure of handling interrupts. But the above 3 steps form the basic skeleton of the procedure.
Addresses of each of the interrupt handlers are maintained in a special location referred to as the - Interrupt Descriptor Table or IDT. The processor uses a unique number for recognizing the type of interruption or exception. This number is called - vector number. A vector number is an index in the IDT. There is a limited amount of the vector numbers and it can be from 0 to 255. You can note the following range-check upon the vector number within the Linux kernel source-code:
BUG_ON((unsigned)n > 0xFF);
You can find this check within the Linux kernel source code related to interrupt setup (e.g. The set_intr_gate in arch/x86/kernel/idt.c). The first 32 vector numbers from 0 to 31 are reserved by the processor and used for the processing of architecture-defined exceptions and interrupts. You can find the table with the description of these vector numbers in the second part of the Linux kernel initialization process - Early interrupt and exception handling. Vector numbers from 32 to 255 are designated as user-defined interrupts and are not reserved by the processor. These interrupts are generally assigned to external I/O devices to enable those devices to send interrupts to the processor.
Now let's talk about the types of interrupts. Broadly speaking, we can split interrupts into 2 major classes:
- External or hardware generated interrupts
- Software-generated interrupts
The first - external interrupts are received through the Local APIC or pins on the processor which are connected to the Local APIC. The second - software-generated interrupts are caused by an exceptional condition in the processor itself (sometimes using special architecture-specific instructions). A common example of an exceptional condition is division by zero. Another example is exiting a program with the syscall instruction.
As mentioned earlier, an interrupt can occur at any time for a reason which the code and CPU have no control over. On the other hand, exceptions are synchronous with program execution and can be classified into 3 categories:
FaultsTrapsAborts
A fault is an exception reported before the execution of a "faulty" instruction (which can then be corrected). If correct, it allows the interrupted program to resume.
Next a trap is an exception, which is reported immediately following the execution of the trap instruction. Traps also allow the interrupted program to be continued just as a fault does.
Finally, an abort is an exception that does not always report the exact instruction which caused the exception and does not allow the interrupted program to be resumed.
Also, we already know from the previous part that interrupts can be classified as maskable and non-maskable. Maskable interrupts are interrupts which can be blocked with the two following instructions for x86_64 - sti and cli. We can find them in the Linux kernel source code:
static inline void native_irq_disable(void)
{
asm volatile("cli": : :"memory");
}
and
static inline void native_irq_enable(void)
{
asm volatile("sti": : :"memory");
}
These two instructions modify the IF flag bit within the interrupt register. The sti instruction sets the IF flag and the cli instruction clears this flag. Non-maskable interrupts are always reported. Usually any failure in the hardware is mapped to such non-maskable interrupts.
If multiple exceptions or interrupts occur at the same time, the processor handles them in order of their predefined priorities. We can determine the priorities from the highest to the lowest in the following table:
+----------------------------------------------------------------+
| | |
| Priority | Description |
| | |
+--------------+-------------------------------------------------+
| | Hardware Reset and Machine Checks |
| 1 | - RESET |
| | - Machine Check |
+--------------+-------------------------------------------------+
| | Trap on Task Switch |
| 2 | - T flag in TSS is set |
| | |
+--------------+-------------------------------------------------+
| | External Hardware Interventions |
| | - FLUSH |
| 3 | - STOPCLK |
| | - SMI |
| | - INIT |
+--------------+-------------------------------------------------+
| | Traps on the Previous Instruction |
| 4 | - Breakpoints |
| | - Debug Trap Exceptions |
+--------------+-------------------------------------------------+
| 5 | Nonmaskable Interrupts |
+--------------+-------------------------------------------------+
| 6 | Maskable Hardware Interrupts |
+--------------+-------------------------------------------------+
| 7 | Code Breakpoint Fault |
+--------------+-------------------------------------------------+
| 8 | Faults from Fetching Next Instruction |
| | Code-Segment Limit Violation |
| | Code Page Fault |
+--------------+-------------------------------------------------+
| | Faults from Decoding the Next Instruction |
| | Instruction length > 15 bytes |
| 9 | Invalid Opcode |
| | Coprocessor Not Available |
| | |
+--------------+-------------------------------------------------+
| 10 | Faults on Executing an Instruction |
| | Overflow |
| | Bound error |
| | Invalid TSS |
| | Segment Not Present |
| | Stack fault |
| | General Protection |
| | Data Page Fault |
| | Alignment Check |
| | x87 FPU Floating-point exception |
| | SIMD floating-point exception |
| | Virtualization exception |
+--------------+-------------------------------------------------+
Now that we know a little about the various types of interrupts and exceptions, it is time to move on to a more practical part. We start with the description of the Interrupt Descriptor Table. As mentioned earlier, the IDT stores entry points of the interrupts and exceptions handlers. The IDT is similar in structure to the Global Descriptor Table which we saw in the second part of the Kernel booting process. But of course it has some differences. Instead of descriptors, the IDT entries are called gates. It can contain one of the following gates:
- Interrupt gates
- Task gates
- Trap gates.
In the x86 architecture. Only long mode interrupt gates and trap gates can be referenced in the x86_64. Like the Global Descriptor Table, the Interrupt Descriptor table is an array of 8-byte gates on x86 and an array of 16-byte gates on x86_64. We can remember from the second part of the Kernel booting process, that Global Descriptor Table must contain NULL descriptor as its first element. Unlike the Global Descriptor Table, the Interrupt Descriptor Table may contain a gate; it is not mandatory. For example, you may remember that we have loaded the Interrupt Descriptor table with the NULL gates only in the earlier part while transitioning into protected mode:
/*
* Set up the IDT
*/
static void setup_idt(void)
{
static const struct gdt_ptr null_idt = {0, 0};
asm volatile("lidtl %0" : : "m" (null_idt));
}
From the arch/x86/boot/pm.c. The Interrupt Descriptor table can be located anywhere in the linear address space and the base address of it must be aligned on an 8-byte boundary on x86 or 16-byte boundary on x86_64. The base address of the IDT is stored in the special register - IDTR. There are two instructions on x86-compatible processors to modify the IDTR register:
LIDTSIDT
The first instruction LIDT is used to load the base-address of the IDT i.e., the specified operand into the IDTR. The second instruction SIDT is used to read and store the contents of the IDTR into the specified operand. The IDTR register is 48-bits on the x86 and contains the following information:
+-----------------------------------+----------------------+
| | |
| Base address of the IDT | Limit of the IDT |
| | |
+-----------------------------------+----------------------+
47 16 15 0
Looking at the implementation of setup_idt, we have prepared a null_idt and loaded it to the IDTR register with the lidt instruction. Note that null_idt has gdt_ptr type which is defined as:
struct gdt_ptr {
u16 len;
u32 ptr;
} __attribute__((packed));
Here we can see the definition of the structure with the two fields of 2-bytes and 4-bytes each (a total of 48-bits) as we can see in the diagram. Now let's look at the IDT entries structure. The IDT entries structure is an array of the 16-byte entries which are called gates in the x86_64. They have the following structure:
127 96
+-------------------------------------------------------------------------------+
| |
| Reserved |
| |
+--------------------------------------------------------------------------------
95 64
+-------------------------------------------------------------------------------+
| |
| Offset 63..32 |
| |
+-------------------------------------------------------------------------------+
63 48 47 46 44 42 39 34 32
+-------------------------------------------------------------------------------+
| | | D | | | | | | |
| Offset 31..16 | P | P | 0 |Type |0 0 0 | 0 | 0 | IST |
| | | L | | | | | | |
-------------------------------------------------------------------------------+
31 16 15 0
+-------------------------------------------------------------------------------+
| | |
| Segment Selector | Offset 15..0 |
| | |
+-------------------------------------------------------------------------------+
To form an index into the IDT, the processor scales the exception or interrupt vector by sixteen. The processor handles the occurrence of exceptions and interrupts just like it handles calls of a procedure when it sees the call instruction. A processor uses a unique number or vector number of the interrupt or the exception as the index to find the necessary Interrupt Descriptor Table entry. Now let's take a closer look at an IDT entry.
As we can see, IDT entry on the diagram consists of the following fields:
0-15bits - offset from the segment selector which is used by the processor as the base address of the entry point of the interrupt handler;16-31bits - base address of the segment select which contains the entry point of the interrupt handler;IST- a new special mechanism in thex86_64, which is described below;DPL- Descriptor Privilege Level;P- Segment Present flag;48-63bits - the second part of the handler base address;64-95bits - the third part of the base address of the handler;96-127bits - and the last bits are reserved by the CPU.
And the last Type field describes the type of the IDT entry. There are three different kinds of handlers for interrupts:
- Interrupt gate
- Trap gate
- Task gate
The IST or Interrupt Stack Table is a new mechanism in the x86_64. It is used as an alternative to the legacy stack-switch mechanism. Previously the x86 architecture provided a mechanism to automatically switch stack frames in response to an interrupt. The IST is a modified version of the x86 Stack switching mode. This mechanism unconditionally switches stacks when it is enabled and can be enabled for any interrupt in the IDT entry related with the certain interrupt (we will soon see it). From this we can understand that IST is not necessary for all interrupts. Some interrupts can continue to use the legacy stack switching mode. The IST mechanism provides up to seven IST pointers in the Task State Segment or TSS which is the special structure which contains information about a process. The TSS is used for stack switching during the execution of an interrupt or exception handler in the Linux kernel. Each pointer is referenced by an interrupt gate from the IDT.
The Interrupt Descriptor Table represented by the array of the gate_desc structures:
extern gate_desc idt_table[];
where gate_struct is defined as:
/arch/x86/include/asm/desc_defs.h
struct gate_struct {
u16 offset_low;
u16 segment;
struct idt_bits bits;
u16 offset_middle;
#ifdef CONFIG_X86_64
u32 offset_high;
u32 reserved;
#endif
} __attribute__((packed));
Each active thread has a large stack in the Linux kernel for the x86_64 architecture. The stack size is defined as THREAD_SIZE and is equal to:
#define PAGE_SHIFT 12
#define PAGE_SIZE (_AC(1,UL) << PAGE_SHIFT)
...
...
...
#define THREAD_SIZE_ORDER (2 + KASAN_STACK_ORDER)
#define THREAD_SIZE (PAGE_SIZE << THREAD_SIZE_ORDER)
The PAGE_SIZE is 4096-bytes and the THREAD_SIZE_ORDER depends on the KASAN_STACK_ORDER. As we can see, the KASAN_STACK depends on the CONFIG_KASAN kernel configuration parameter and is defined as:
#ifdef CONFIG_KASAN
#define KASAN_STACK_ORDER 1
#else
#define KASAN_STACK_ORDER 0
#endif
KASan is a runtime memory debugger. Thus, the THREAD_SIZE will be 16384 bytes if CONFIG_KASAN is disabled or 32768 if this kernel configuration option is enabled. These stacks contain useful data as long as a thread is alive or in a zombie state. While the thread is in user-space, the kernel stack is empty except for the thread_info structure (details about this structure are available in the fourth part of the Linux kernel initialization process) at the end of the stack. The active or zombie threads aren't the only threads with their own stack. There also exist specialized stacks that are associated with each available CPU. These stacks are active when the kernel is executing on that CPU. When the user-space is executing on the CPU, these stacks do not contain any useful information. Each CPU has a few special per-cpu stacks as well. The first is the interrupt stack used for the external hardware interrupts. Its size is determined as follows:
#define IRQ_STACK_ORDER (2 + KASAN_STACK_ORDER)
#define IRQ_STACK_SIZE (PAGE_SIZE << IRQ_STACK_ORDER)
Or 16384 bytes. The per-cpu interrupt stack is represented by the irq_stack struct and the fixed_percpu_data struct in the Linux kernel for x86_64:
/* Per CPU interrupt stacks */
struct irq_stack {
char stack[IRQ_STACK_SIZE];
} __aligned(IRQ_STACK_SIZE);
#ifdef CONFIG_X86_64
struct fixed_percpu_data {
/*
* GCC hardcodes the stack canary as %gs:40. Since the
* irq_stack is the object at %gs:0, we reserve the bottom
* 48 bytes of the irq stack for the canary.
*/
char gs_base[40];
unsigned long stack_canary;
};
...
#endif
The irq_stack struct contains a 16 kilobytes array.
Also, you can see that the fixed_percpu_data contains two fields:
gs_base- Thegsregister always points to the bottom of thefixed_percpu_data. On thex86_64, thegsregister is shared by per-cpu area and stack canary (more aboutper-cpuvariables you can read in the special part). All per-cpu symbols are zero-based and thegspoints to the base of the per-cpu area. You already know that segmented memory model is abolished in the long mode, but we can set the base address for the two segment registers -fsandgswith the Model specific registers and these registers can be still be used as address registers. If you remember the first part of the Linux kernel initialization process, you can remember that we have set thegsregister:
movl $MSR_GS_BASE,%ecx
movl initial_gs(%rip),%eax
movl initial_gs+4(%rip),%edx
wrmsr
where initial_gs points to the fixed_percpu_data:
SYM_DATA(initial_gs, .quad INIT_PER_CPU_VAR(fixed_percpu_data))
stack_canary- Stack canary for the interrupt stack is astack protectorto verify that the stack hasn't been overwritten. Note thatgs_baseis a 40 bytes array.GCCrequires that stack canary will be on the fixed offset from the base of thegsand its value must be40for thex86_64and20for thex86.
The fixed_percpu_data is the first datum in the percpu area, we can see it in the System.map:
0000000000000000 D __per_cpu_start
0000000000000000 D fixed_percpu_data
00000000000001e0 A kexec_control_code_size
0000000000001000 D cpu_debug_store
0000000000002000 D irq_stack_backing_store
0000000000006000 D cpu_tss_rw
0000000000009000 D gdt_page
000000000000a000 d exception_stacks
...
...
...
We can see its definition in the code:
DECLARE_PER_CPU_FIRST(struct fixed_percpu_data, fixed_percpu_data) __visible;
Now, it's time to look at the initialization of the fixed_percpu_data. Besides the fixed_percpu_data definition, we can see the definition of the following per-cpu variables in the arch/x86/include/asm/processor.h:
DECLARE_PER_CPU(struct irq_stack *, hardirq_stack_ptr);
...
DECLARE_PER_CPU(unsigned int, irq_count);
...
/* Per CPU softirq stack pointer */
DECLARE_PER_CPU(struct irq_stack *, softirq_stack_ptr);
The first and third are the stack pointers for hardware and software interrupts. It is obvious from the name of the variables, that these point to the top of stacks. The second - irq_count is used to check if a CPU is already on an interrupt stack or not. Initialization of the hardirq_stack_ptr is located in the irq_init_percpu_irqstack function in arch/x86/kernel/irq_64.c:
int irq_init_percpu_irqstack(unsigned int cpu)
{
if (per_cpu(hardirq_stack_ptr, cpu))
return 0;
return map_irq_stack(cpu);
}
Here we go over all the CPUs one-by-one and setup the hardirq_stack_ptr.
Where map_irq_stack is called to initialize the hardirq_stack_ptr,
to point onto the irq_stack_backing_store of the current CPU with an offset of IRQ_STACK_SIZE,
either with guard pages or without when KASan is enabled.
After the initialization of the interrupt stack, we need to initialize the gs register within arch/x86/kernel/cpu/common.c:
void load_percpu_segment(int cpu)
{
...
...
...
__loadsegment_simple(gs, 0);
wrmsrl(MSR_GS_BASE, cpu_kernelmode_gs_base(cpu));
...
load_stack_canary_segment();
}
and as we already know the gs register points to the bottom of the interrupt stack.
movl $MSR_GS_BASE,%ecx
movl initial_gs(%rip),%eax
movl initial_gs+4(%rip),%edx
wrmsr
SYM_DATA(initial_gs,
.quad INIT_PER_CPU_VAR(fixed_percpu_data))
Here we can see the wrmsr instruction, which loads the data from edx:eax into the Model specific register pointed by the ecx register. In our case the model specific register is MSR_GS_BASE, which contains the base address of the memory segment pointed to by the gs register. edx:eax points to the address of the initial_gs, which is the base address of our fixed_percpu_data.
We already know that x86_64 has a feature called Interrupt Stack Table or IST and this feature provides the ability to switch to a new stack for events like a non-maskable interrupt, double fault, etc. There can be up to seven IST entries per-cpu. Some of them are:
DOUBLEFAULT_STACKNMI_STACKDEBUG_STACKMCE_STACK
or
#define DOUBLEFAULT_STACK 1
#define NMI_STACK 2
#define DEBUG_STACK 3
#define MCE_STACK 4
All interrupt-gate descriptors, which switch to a new stack with the IST, are initialized within the idt_setup_from_table function. That function initializes every gate descriptor within the struct idt_data def_idts[] array.
For example:
static const __initconst struct idt_data def_idts[] = {
...
INTG(X86_TRAP_NMI, nmi),
...
INTG(X86_TRAP_DF, double_fault),
where nmi and double_fault are entry points created at arch/x86/kernel/entry_64.S:
idtentry double_fault do_double_fault has_error_code=1 paranoid=2 read_cr2=1
...
...
...
SYM_CODE_START(nmi)
...
...
...
SYM_CODE_END(nmi)
for the the given interrupt handlers declared at arch/x86/include/asm/traps.h:
asmlinkage void nmi(void);
asmlinkage void double_fault(void);
When an interrupt or an exception occurs, the new ss selector is forced to NULL and the ss selector’s rpl field is set to the new cpl. The old ss, rsp, register flags, cs, rip are pushed onto the new stack. In 64-bit mode, the size of interrupt stack-frame pushes is fixed at 8-bytes, so that we will get the following stack:
+---------------+
| |
| SS | 40
| RSP | 32
| RFLAGS | 24
| CS | 16
| RIP | 8
| Error code | 0
| |
+---------------+
If the IST field in the interrupt gate is not 0, we read the IST pointer into rsp. If the interrupt vector number has an error code associated with it, we then push the error code onto the stack. If the interrupt vector number has no error code, we go ahead and push the dummy error code on to the stack. We need to do this to ensure stack consistency. Next, we load the segment-selector field from the gate descriptor into the CS register and must verify that the target code-segment is a 64-bit mode code segment by the checking bit 21 i.e. the L bit in the Global Descriptor Table. Finally, we load the offset field from the gate descriptor into rip which will be the entry-point of the interrupt handler. After this the interrupt handler begins to execute and when the interrupt handler finishes its execution, it must return control to the interrupted process with the iret instruction. The iret instruction unconditionally pops the stack pointer (ss:rsp) to restore the stack of the interrupted process and does not depend on the cpl change.
That's all.
Conclusion
It is the end of the first part of Interrupts and Interrupt Handling in the Linux kernel. We covered some theory and the first steps of initialization of stuff related to interrupts and exceptions. In the next part we will continue to dive into the more practical aspects of interrupts and interrupt handling.
If you have any questions or suggestions write me a comment or ping me at twitter.
Please note that English is not my first language, And I am really sorry for any inconvenience. If you find any mistakes please send me a PR to linux-insides.