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@settitle QEMU Internals

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@center @titlefont{QEMU Internals}

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@chapter Introduction

@section Features

QEMU is a FAST! processor emulator using a portable dynamic

translator.

QEMU has two operating modes:

@itemize @minus

@item 

Full system emulation. In this mode, QEMU emulates a full system

(usually a PC), including a processor and various peripherials. It can

be used to launch an different Operating System without rebooting the

PC or to debug system code.

@item 

User mode emulation (Linux host only). In this mode, QEMU can launch

Linux processes compiled for one CPU on another CPU. It can be used to

launch the Wine Windows API emulator (@url{http://www.winehq.org}) or

to ease cross-compilation and cross-debugging.

@end itemize

As QEMU requires no host kernel driver to run, it is very safe and

easy to use.

QEMU generic features:

@itemize 

@item User space only or full system emulation.

@item Using dynamic translation to native code for reasonnable speed.

@item Working on x86 and PowerPC hosts. Being tested on ARM, Sparc32, Alpha and S390.

@item Self-modifying code support.

@item Precise exceptions support.

@item The virtual CPU is a library (@code{libqemu}) which can be used 

in other projects (look at @file{qemu/tests/qruncom.c} to have an

example of user mode @code{libqemu} usage).

@end itemize

QEMU user mode emulation features:

@itemize 

@item Generic Linux system call converter, including most ioctls.

@item clone() emulation using native CPU clone() to use Linux scheduler for threads.

@item Accurate signal handling by remapping host signals to target signals. 

@end itemize

@end itemize

QEMU full system emulation features:

@itemize 

@item QEMU can either use a full software MMU for maximum portability or use the host system call mmap() to simulate the target MMU.

@end itemize

@section x86 emulation

QEMU x86 target features:

@itemize 

@item The virtual x86 CPU supports 16 bit and 32 bit addressing with segmentation. 

LDT/GDT and IDT are emulated. VM86 mode is also supported to run DOSEMU.

@item Support of host page sizes bigger than 4KB in user mode emulation.

@item QEMU can emulate itself on x86.

@item An extensive Linux x86 CPU test program is included @file{tests/test-i386}. 

It can be used to test other x86 virtual CPUs.

@end itemize

Current QEMU limitations:

@itemize 

@item No SSE/MMX support (yet).

@item No x86-64 support.

@item IPC syscalls are missing.

@item The x86 segment limits and access rights are not tested at every 

memory access (yet). Hopefully, very few OSes seem to rely on that for

normal use.

@item On non x86 host CPUs, @code{double}s are used instead of the non standard 

10 byte @code{long double}s of x86 for floating point emulation to get

maximum performances.

@end itemize

@section ARM emulation

@itemize

@item Full ARM 7 user emulation.

@item NWFPE FPU support included in user Linux emulation.

@item Can run most ARM Linux binaries.

@end itemize

@section PowerPC emulation

@itemize

@item Full PowerPC 32 bit emulation, including priviledged instructions, 

FPU and MMU.

@item Can run most PowerPC Linux binaries.

@end itemize

@section SPARC emulation

@itemize

@item SPARC V8 user support, except FPU instructions.

@item Can run some SPARC Linux binaries.

@end itemize

@chapter QEMU Internals

@section QEMU compared to other emulators

Like bochs [3], QEMU emulates an x86 CPU. But QEMU is much faster than

bochs as it uses dynamic compilation. Bochs is closely tied to x86 PC

emulation while QEMU can emulate several processors.

Like Valgrind [2], QEMU does user space emulation and dynamic

translation. Valgrind is mainly a memory debugger while QEMU has no

support for it (QEMU could be used to detect out of bound memory

accesses as Valgrind, but it has no support to track uninitialised data

as Valgrind does). The Valgrind dynamic translator generates better code

than QEMU (in particular it does register allocation) but it is closely

tied to an x86 host and target and has no support for precise exceptions

and system emulation.

EM86 [4] is the closest project to user space QEMU (and QEMU still uses

some of its code, in particular the ELF file loader). EM86 was limited

to an alpha host and used a proprietary and slow interpreter (the

interpreter part of the FX!32 Digital Win32 code translator [5]).

TWIN [6] is a Windows API emulator like Wine. It is less accurate than

Wine but includes a protected mode x86 interpreter to launch x86 Windows

executables. Such an approach as greater potential because most of the

Windows API is executed natively but it is far more difficult to develop

because all the data structures and function parameters exchanged

between the API and the x86 code must be converted.

User mode Linux [7] was the only solution before QEMU to launch a

Linux kernel as a process while not needing any host kernel

patches. However, user mode Linux requires heavy kernel patches while

QEMU accepts unpatched Linux kernels. The price to pay is that QEMU is

slower.

The new Plex86 [8] PC virtualizer is done in the same spirit as the

qemu-fast system emulator. It requires a patched Linux kernel to work

(you cannot launch the same kernel on your PC), but the patches are

really small. As it is a PC virtualizer (no emulation is done except

for some priveledged instructions), it has the potential of being

faster than QEMU. The downside is that a complicated (and potentially

unsafe) host kernel patch is needed.

The commercial PC Virtualizers (VMWare [9], VirtualPC [10], TwoOStwo

[11]) are faster than QEMU, but they all need specific, proprietary

and potentially unsafe host drivers. Moreover, they are unable to

provide cycle exact simulation as an emulator can.

@section Portable dynamic translation

QEMU is a dynamic translator. When it first encounters a piece of code,

it converts it to the host instruction set. Usually dynamic translators

are very complicated and highly CPU dependent. QEMU uses some tricks

which make it relatively easily portable and simple while achieving good

performances.

The basic idea is to split every x86 instruction into fewer simpler

instructions. Each simple instruction is implemented by a piece of C

code (see @file{target-i386/op.c}). Then a compile time tool

(@file{dyngen}) takes the corresponding object file (@file{op.o})

to generate a dynamic code generator which concatenates the simple

instructions to build a function (see @file{op.h:dyngen_code()}).

In essence, the process is similar to [1], but more work is done at

compile time. 

A key idea to get optimal performances is that constant parameters can

be passed to the simple operations. For that purpose, dummy ELF

relocations are generated with gcc for each constant parameter. Then,

the tool (@file{dyngen}) can locate the relocations and generate the

appriopriate C code to resolve them when building the dynamic code.

That way, QEMU is no more difficult to port than a dynamic linker.

To go even faster, GCC static register variables are used to keep the

state of the virtual CPU.

@section Register allocation

Since QEMU uses fixed simple instructions, no efficient register

allocation can be done. However, because RISC CPUs have a lot of

register, most of the virtual CPU state can be put in registers without

doing complicated register allocation.

@section Condition code optimisations

Good CPU condition codes emulation (@code{EFLAGS} register on x86) is a

critical point to get good performances. QEMU uses lazy condition code

evaluation: instead of computing the condition codes after each x86

instruction, it just stores one operand (called @code{CC_SRC}), the

result (called @code{CC_DST}) and the type of operation (called

@code{CC_OP}).

@code{CC_OP} is almost never explicitely set in the generated code

because it is known at translation time.

In order to increase performances, a backward pass is performed on the

generated simple instructions (see

@code{target-i386/translate.c:optimize_flags()}). When it can be proved that

the condition codes are not needed by the next instructions, no

condition codes are computed at all.

@section CPU state optimisations

The x86 CPU has many internal states which change the way it evaluates

instructions. In order to achieve a good speed, the translation phase

considers that some state information of the virtual x86 CPU cannot

change in it. For example, if the SS, DS and ES segments have a zero

base, then the translator does not even generate an addition for the

segment base.

[The FPU stack pointer register is not handled that way yet].

@section Translation cache

A 16 MByte cache holds the most recently used translations. For

simplicity, it is completely flushed when it is full. A translation unit

contains just a single basic block (a block of x86 instructions

terminated by a jump or by a virtual CPU state change which the

translator cannot deduce statically).

@section Direct block chaining

After each translated basic block is executed, QEMU uses the simulated

Program Counter (PC) and other cpu state informations (such as the CS

segment base value) to find the next basic block.

In order to accelerate the most common cases where the new simulated PC

is known, QEMU can patch a basic block so that it jumps directly to the

next one.

The most portable code uses an indirect jump. An indirect jump makes

it easier to make the jump target modification atomic. On some host

architectures (such as x86 or PowerPC), the @code{JUMP} opcode is

directly patched so that the block chaining has no overhead.

@section Self-modifying code and translated code invalidation

Self-modifying code is a special challenge in x86 emulation because no

instruction cache invalidation is signaled by the application when code

is modified.

When translated code is generated for a basic block, the corresponding

host page is write protected if it is not already read-only (with the

system call @code{mprotect()}). Then, if a write access is done to the

page, Linux raises a SEGV signal. QEMU then invalidates all the

translated code in the page and enables write accesses to the page.

Correct translated code invalidation is done efficiently by maintaining

a linked list of every translated block contained in a given page. Other

linked lists are also maintained to undo direct block chaining. 

Although the overhead of doing @code{mprotect()} calls is important,

most MSDOS programs can be emulated at reasonnable speed with QEMU and

DOSEMU.

Note that QEMU also invalidates pages of translated code when it detects

that memory mappings are modified with @code{mmap()} or @code{munmap()}.

When using a software MMU, the code invalidation is more efficient: if

a given code page is invalidated too often because of write accesses,

then a bitmap representing all the code inside the page is

built. Every store into that page checks the bitmap to see if the code

really needs to be invalidated. It avoids invalidating the code when

only data is modified in the page.

@section Exception support

longjmp() is used when an exception such as division by zero is

encountered. 

The host SIGSEGV and SIGBUS signal handlers are used to get invalid

memory accesses. The exact CPU state can be retrieved because all the

x86 registers are stored in fixed host registers. The simulated program

counter is found by retranslating the corresponding basic block and by

looking where the host program counter was at the exception point.

The virtual CPU cannot retrieve the exact @code{EFLAGS} register because

in some cases it is not computed because of condition code

optimisations. It is not a big concern because the emulated code can

still be restarted in any cases.

@section MMU emulation

For system emulation, QEMU uses the mmap() system call to emulate the

target CPU MMU. It works as long the emulated OS does not use an area

reserved by the host OS (such as the area above 0xc0000000 on x86

Linux).

In order to be able to launch any OS, QEMU also supports a soft

MMU. In that mode, the MMU virtual to physical address translation is

done at every memory access. QEMU uses an address translation cache to

speed up the translation.

In order to avoid flushing the translated code each time the MMU

mappings change, QEMU uses a physically indexed translation cache. It

means that each basic block is indexed with its physical address. 

When MMU mappings change, only the chaining of the basic blocks is

reset (i.e. a basic block can no longer jump directly to another one).

@section Hardware interrupts

In order to be faster, QEMU does not check at every basic block if an

hardware interrupt is pending. Instead, the user must asynchrously

call a specific function to tell that an interrupt is pending. This

function resets the chaining of the currently executing basic

block. It ensures that the execution will return soon in the main loop

of the CPU emulator. Then the main loop can test if the interrupt is

pending and handle it.

@section User emulation specific details

@subsection Linux system call translation

QEMU includes a generic system call translator for Linux. It means that

the parameters of the system calls can be converted to fix the

endianness and 32/64 bit issues. The IOCTLs are converted with a generic

type description system (see @file{ioctls.h} and @file{thunk.c}).

QEMU supports host CPUs which have pages bigger than 4KB. It records all

the mappings the process does and try to emulated the @code{mmap()}

system calls in cases where the host @code{mmap()} call would fail

because of bad page alignment.

@subsection Linux signals

Normal and real-time signals are queued along with their information

(@code{siginfo_t}) as it is done in the Linux kernel. Then an interrupt

request is done to the virtual CPU. When it is interrupted, one queued

signal is handled by generating a stack frame in the virtual CPU as the

Linux kernel does. The @code{sigreturn()} system call is emulated to return

from the virtual signal handler.

Some signals (such as SIGALRM) directly come from the host. Other

signals are synthetized from the virtual CPU exceptions such as SIGFPE

when a division by zero is done (see @code{main.c:cpu_loop()}).

The blocked signal mask is still handled by the host Linux kernel so

that most signal system calls can be redirected directly to the host

Linux kernel. Only the @code{sigaction()} and @code{sigreturn()} system

calls need to be fully emulated (see @file{signal.c}).

@subsection clone() system call and threads

The Linux clone() system call is usually used to create a thread. QEMU

uses the host clone() system call so that real host threads are created

for each emulated thread. One virtual CPU instance is created for each

thread.

The virtual x86 CPU atomic operations are emulated with a global lock so

that their semantic is preserved.

Note that currently there are still some locking issues in QEMU. In

particular, the translated cache flush is not protected yet against

reentrancy.

@subsection Self-virtualization

QEMU was conceived so that ultimately it can emulate itself. Although

it is not very useful, it is an important test to show the power of the

emulator.

Achieving self-virtualization is not easy because there may be address

space conflicts. QEMU solves this problem by being an executable ELF

shared object as the ld-linux.so ELF interpreter. That way, it can be

relocated at load time.

@section Bibliography

@table @asis

@item [1] 

@url{http://citeseer.nj.nec.com/piumarta98optimizing.html}, Optimizing

direct threaded code by selective inlining (1998) by Ian Piumarta, Fabio

Riccardi.

@item [2]

@url{http://developer.kde.org/~sewardj/}, Valgrind, an open-source

memory debugger for x86-GNU/Linux, by Julian Seward.

@item [3]

@url{http://bochs.sourceforge.net/}, the Bochs IA-32 Emulator Project,

by Kevin Lawton et al.

@item [4]

@url{http://www.cs.rose-hulman.edu/~donaldlf/em86/index.html}, the EM86

x86 emulator on Alpha-Linux.

@item [5]

@url{http://www.usenix.org/publications/library/proceedings/usenix-nt97/full_papers/chernoff/chernoff.pdf},

DIGITAL FX!32: Running 32-Bit x86 Applications on Alpha NT, by Anton

Chernoff and Ray Hookway.

@item [6]

@url{http://www.willows.com/}, Windows API library emulation from

Willows Software.

@item [7]

@url{http://user-mode-linux.sourceforge.net/}, 

The User-mode Linux Kernel.

@item [8]

@url{http://www.plex86.org/}, 

The new Plex86 project.

@item [9]

@url{http://www.vmware.com/}, 

The VMWare PC virtualizer.

@item [10]

@url{http://www.microsoft.com/windowsxp/virtualpc/}, 

The VirtualPC PC virtualizer.

@item [11]

@url{http://www.twoostwo.org/}, 

The TwoOStwo PC virtualizer.

@end table

@chapter Regression Tests

In the directory @file{tests/}, various interesting testing programs

are available. There are used for regression testing.

@section @file{test-i386}

This program executes most of the 16 bit and 32 bit x86 instructions and

generates a text output. It can be compared with the output obtained with

a real CPU or another emulator. The target @code{make test} runs this

program and a @code{diff} on the generated output.

The Linux system call @code{modify_ldt()} is used to create x86 selectors

to test some 16 bit addressing and 32 bit with segmentation cases.

The Linux system call @code{vm86()} is used to test vm86 emulation.

Various exceptions are raised to test most of the x86 user space

exception reporting.

@section @file{linux-test}

This program tests various Linux system calls. It is used to verify

that the system call parameters are correctly converted between target

and host CPUs.

@section @file{qruncom.c}

Example of usage of @code{libqemu} to emulate a user mode i386 CPU.