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\input texinfo @c -*- texinfo -*- |
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@c %**start of header |
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@setfilename qemu-tech.info |
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@settitle QEMU Internals |
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@exampleindent 0 |
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@paragraphindent 0 |
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@c %**end of header |
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|
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@iftex |
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@titlepage |
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@sp 7 |
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@center @titlefont{QEMU Internals} |
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@sp 3 |
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@end titlepage |
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@end iftex |
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|
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@ifnottex |
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@node Top |
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@top |
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|
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@menu |
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* Introduction:: |
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* QEMU Internals:: |
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* Regression Tests:: |
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* Index:: |
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@end menu |
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@end ifnottex |
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|
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@contents |
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|
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@node Introduction |
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@chapter Introduction |
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|
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@menu |
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* intro_features:: Features |
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* intro_x86_emulation:: x86 emulation |
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* intro_arm_emulation:: ARM emulation |
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* intro_mips_emulation:: MIPS emulation |
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* intro_ppc_emulation:: PowerPC emulation |
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* intro_sparc_emulation:: SPARC emulation |
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@end menu |
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|
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@node intro_features |
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@section Features |
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|
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QEMU is a FAST! processor emulator using a portable dynamic |
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translator. |
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|
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QEMU has two operating modes: |
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|
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@itemize @minus |
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|
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@item |
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Full system emulation. In this mode, QEMU emulates a full system |
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(usually a PC), including a processor and various peripherals. It can |
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be used to launch an different Operating System without rebooting the |
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PC or to debug system code. |
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|
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@item |
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User mode emulation (Linux host only). In this mode, QEMU can launch |
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Linux processes compiled for one CPU on another CPU. It can be used to |
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launch the Wine Windows API emulator (@url{http://www.winehq.org}) or |
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to ease cross-compilation and cross-debugging. |
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|
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@end itemize |
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|
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As QEMU requires no host kernel driver to run, it is very safe and |
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easy to use. |
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|
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QEMU generic features: |
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|
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@itemize |
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|
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@item User space only or full system emulation. |
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|
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@item Using dynamic translation to native code for reasonable speed. |
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|
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@item Working on x86 and PowerPC hosts. Being tested on ARM, Sparc32, Alpha and S390. |
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|
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@item Self-modifying code support. |
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|
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@item Precise exceptions support. |
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|
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@item The virtual CPU is a library (@code{libqemu}) which can be used |
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in other projects (look at @file{qemu/tests/qruncom.c} to have an |
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example of user mode @code{libqemu} usage). |
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|
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@end itemize |
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|
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QEMU user mode emulation features: |
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@itemize |
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@item Generic Linux system call converter, including most ioctls. |
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|
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@item clone() emulation using native CPU clone() to use Linux scheduler for threads. |
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|
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@item Accurate signal handling by remapping host signals to target signals. |
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@end itemize |
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|
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QEMU full system emulation features: |
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@itemize |
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@item QEMU can either use a full software MMU for maximum portability or use the host system call mmap() to simulate the target MMU. |
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@end itemize |
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|
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@node intro_x86_emulation |
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@section x86 emulation |
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|
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QEMU x86 target features: |
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|
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@itemize |
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|
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@item The virtual x86 CPU supports 16 bit and 32 bit addressing with segmentation. |
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LDT/GDT and IDT are emulated. VM86 mode is also supported to run DOSEMU. |
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|
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@item Support of host page sizes bigger than 4KB in user mode emulation. |
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|
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@item QEMU can emulate itself on x86. |
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|
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@item An extensive Linux x86 CPU test program is included @file{tests/test-i386}. |
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It can be used to test other x86 virtual CPUs. |
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|
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@end itemize |
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|
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Current QEMU limitations: |
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|
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@itemize |
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|
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@item No SSE/MMX support (yet). |
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|
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@item No x86-64 support. |
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|
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@item IPC syscalls are missing. |
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|
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@item The x86 segment limits and access rights are not tested at every |
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memory access (yet). Hopefully, very few OSes seem to rely on that for |
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normal use. |
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|
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@item On non x86 host CPUs, @code{double}s are used instead of the non standard |
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10 byte @code{long double}s of x86 for floating point emulation to get |
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maximum performances. |
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|
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@end itemize |
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|
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@node intro_arm_emulation |
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@section ARM emulation |
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|
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@itemize |
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|
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@item Full ARM 7 user emulation. |
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|
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@item NWFPE FPU support included in user Linux emulation. |
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|
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@item Can run most ARM Linux binaries. |
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|
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@end itemize |
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|
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@node intro_mips_emulation |
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@section MIPS emulation |
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|
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@itemize |
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|
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@item The system emulation allows full MIPS32/MIPS64 Release 2 emulation, |
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including privileged instructions, FPU and MMU, in both little and big |
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endian modes. |
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|
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@item The Linux userland emulation can run many 32 bit MIPS Linux binaries. |
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|
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@end itemize |
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|
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Current QEMU limitations: |
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|
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@itemize |
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|
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@item Self-modifying code is not always handled correctly. |
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|
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@item 64 bit userland emulation is not implemented. |
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|
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@item The system emulation is not complete enough to run real firmware. |
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|
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@item The watchpoint debug facility is not implemented. |
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|
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@end itemize |
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|
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@node intro_ppc_emulation |
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@section PowerPC emulation |
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|
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@itemize |
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|
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@item Full PowerPC 32 bit emulation, including privileged instructions, |
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FPU and MMU. |
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|
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@item Can run most PowerPC Linux binaries. |
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|
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@end itemize |
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|
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@node intro_sparc_emulation |
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@section SPARC emulation |
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|
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@itemize |
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|
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@item Full SPARC V8 emulation, including privileged |
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instructions, FPU and MMU. SPARC V9 emulation includes most privileged |
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and VIS instructions, FPU and I/D MMU. Alignment is fully enforced. |
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|
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@item Can run most 32-bit SPARC Linux binaries, SPARC32PLUS Linux binaries and |
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some 64-bit SPARC Linux binaries. |
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|
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@end itemize |
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|
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Current QEMU limitations: |
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|
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@itemize |
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|
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@item IPC syscalls are missing. |
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|
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@item Floating point exception support is buggy. |
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|
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@item Atomic instructions are not correctly implemented. |
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|
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@item Sparc64 emulators are not usable for anything yet. |
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|
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@end itemize |
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|
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@node QEMU Internals |
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@chapter QEMU Internals |
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|
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@menu |
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* QEMU compared to other emulators:: |
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* Portable dynamic translation:: |
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* Register allocation:: |
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* Condition code optimisations:: |
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* CPU state optimisations:: |
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* Translation cache:: |
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* Direct block chaining:: |
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* Self-modifying code and translated code invalidation:: |
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* Exception support:: |
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* MMU emulation:: |
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* Hardware interrupts:: |
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* User emulation specific details:: |
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* Bibliography:: |
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@end menu |
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|
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@node QEMU compared to other emulators |
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@section QEMU compared to other emulators |
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|
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Like bochs [3], QEMU emulates an x86 CPU. But QEMU is much faster than |
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bochs as it uses dynamic compilation. Bochs is closely tied to x86 PC |
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emulation while QEMU can emulate several processors. |
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|
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Like Valgrind [2], QEMU does user space emulation and dynamic |
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translation. Valgrind is mainly a memory debugger while QEMU has no |
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support for it (QEMU could be used to detect out of bound memory |
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accesses as Valgrind, but it has no support to track uninitialised data |
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as Valgrind does). The Valgrind dynamic translator generates better code |
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than QEMU (in particular it does register allocation) but it is closely |
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tied to an x86 host and target and has no support for precise exceptions |
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and system emulation. |
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|
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EM86 [4] is the closest project to user space QEMU (and QEMU still uses |
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some of its code, in particular the ELF file loader). EM86 was limited |
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to an alpha host and used a proprietary and slow interpreter (the |
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interpreter part of the FX!32 Digital Win32 code translator [5]). |
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|
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TWIN [6] is a Windows API emulator like Wine. It is less accurate than |
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Wine but includes a protected mode x86 interpreter to launch x86 Windows |
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executables. Such an approach has greater potential because most of the |
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Windows API is executed natively but it is far more difficult to develop |
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because all the data structures and function parameters exchanged |
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between the API and the x86 code must be converted. |
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|
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User mode Linux [7] was the only solution before QEMU to launch a |
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Linux kernel as a process while not needing any host kernel |
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patches. However, user mode Linux requires heavy kernel patches while |
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QEMU accepts unpatched Linux kernels. The price to pay is that QEMU is |
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slower. |
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|
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The new Plex86 [8] PC virtualizer is done in the same spirit as the |
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qemu-fast system emulator. It requires a patched Linux kernel to work |
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(you cannot launch the same kernel on your PC), but the patches are |
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really small. As it is a PC virtualizer (no emulation is done except |
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for some priveledged instructions), it has the potential of being |
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faster than QEMU. The downside is that a complicated (and potentially |
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unsafe) host kernel patch is needed. |
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|
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The commercial PC Virtualizers (VMWare [9], VirtualPC [10], TwoOStwo |
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[11]) are faster than QEMU, but they all need specific, proprietary |
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and potentially unsafe host drivers. Moreover, they are unable to |
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provide cycle exact simulation as an emulator can. |
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|
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@node Portable dynamic translation |
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@section Portable dynamic translation |
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|
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QEMU is a dynamic translator. When it first encounters a piece of code, |
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it converts it to the host instruction set. Usually dynamic translators |
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are very complicated and highly CPU dependent. QEMU uses some tricks |
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which make it relatively easily portable and simple while achieving good |
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performances. |
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|
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The basic idea is to split every x86 instruction into fewer simpler |
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instructions. Each simple instruction is implemented by a piece of C |
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code (see @file{target-i386/op.c}). Then a compile time tool |
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(@file{dyngen}) takes the corresponding object file (@file{op.o}) |
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to generate a dynamic code generator which concatenates the simple |
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instructions to build a function (see @file{op.h:dyngen_code()}). |
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|
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In essence, the process is similar to [1], but more work is done at |
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compile time. |
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|
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A key idea to get optimal performances is that constant parameters can |
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be passed to the simple operations. For that purpose, dummy ELF |
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relocations are generated with gcc for each constant parameter. Then, |
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the tool (@file{dyngen}) can locate the relocations and generate the |
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appriopriate C code to resolve them when building the dynamic code. |
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|
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That way, QEMU is no more difficult to port than a dynamic linker. |
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|
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To go even faster, GCC static register variables are used to keep the |
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state of the virtual CPU. |
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|
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@node Register allocation |
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@section Register allocation |
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|
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Since QEMU uses fixed simple instructions, no efficient register |
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allocation can be done. However, because RISC CPUs have a lot of |
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register, most of the virtual CPU state can be put in registers without |
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doing complicated register allocation. |
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|
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@node Condition code optimisations |
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@section Condition code optimisations |
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|
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Good CPU condition codes emulation (@code{EFLAGS} register on x86) is a |
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critical point to get good performances. QEMU uses lazy condition code |
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evaluation: instead of computing the condition codes after each x86 |
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instruction, it just stores one operand (called @code{CC_SRC}), the |
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result (called @code{CC_DST}) and the type of operation (called |
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@code{CC_OP}). |
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|
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@code{CC_OP} is almost never explicitely set in the generated code |
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because it is known at translation time. |
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|
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In order to increase performances, a backward pass is performed on the |
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generated simple instructions (see |
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@code{target-i386/translate.c:optimize_flags()}). When it can be proved that |
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the condition codes are not needed by the next instructions, no |
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condition codes are computed at all. |
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|
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@node CPU state optimisations |
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@section CPU state optimisations |
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|
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The x86 CPU has many internal states which change the way it evaluates |
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instructions. In order to achieve a good speed, the translation phase |
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considers that some state information of the virtual x86 CPU cannot |
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change in it. For example, if the SS, DS and ES segments have a zero |
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base, then the translator does not even generate an addition for the |
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segment base. |
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|
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[The FPU stack pointer register is not handled that way yet]. |
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|
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@node Translation cache |
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@section Translation cache |
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|
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A 16 MByte cache holds the most recently used translations. For |
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simplicity, it is completely flushed when it is full. A translation unit |
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contains just a single basic block (a block of x86 instructions |
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terminated by a jump or by a virtual CPU state change which the |
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translator cannot deduce statically). |
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|
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@node Direct block chaining |
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@section Direct block chaining |
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|
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After each translated basic block is executed, QEMU uses the simulated |
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Program Counter (PC) and other cpu state informations (such as the CS |
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segment base value) to find the next basic block. |
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|
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In order to accelerate the most common cases where the new simulated PC |
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is known, QEMU can patch a basic block so that it jumps directly to the |
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next one. |
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|
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The most portable code uses an indirect jump. An indirect jump makes |
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it easier to make the jump target modification atomic. On some host |
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architectures (such as x86 or PowerPC), the @code{JUMP} opcode is |
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directly patched so that the block chaining has no overhead. |
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|
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@node Self-modifying code and translated code invalidation |
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@section Self-modifying code and translated code invalidation |
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|
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Self-modifying code is a special challenge in x86 emulation because no |
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instruction cache invalidation is signaled by the application when code |
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is modified. |
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|
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When translated code is generated for a basic block, the corresponding |
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host page is write protected if it is not already read-only (with the |
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system call @code{mprotect()}). Then, if a write access is done to the |
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page, Linux raises a SEGV signal. QEMU then invalidates all the |
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translated code in the page and enables write accesses to the page. |
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|
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Correct translated code invalidation is done efficiently by maintaining |
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a linked list of every translated block contained in a given page. Other |
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linked lists are also maintained to undo direct block chaining. |
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|
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Although the overhead of doing @code{mprotect()} calls is important, |
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most MSDOS programs can be emulated at reasonnable speed with QEMU and |
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DOSEMU. |
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|
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Note that QEMU also invalidates pages of translated code when it detects |
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that memory mappings are modified with @code{mmap()} or @code{munmap()}. |
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|
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When using a software MMU, the code invalidation is more efficient: if |
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a given code page is invalidated too often because of write accesses, |
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then a bitmap representing all the code inside the page is |
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built. Every store into that page checks the bitmap to see if the code |
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really needs to be invalidated. It avoids invalidating the code when |
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only data is modified in the page. |
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|
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@node Exception support |
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@section Exception support |
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|
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longjmp() is used when an exception such as division by zero is |
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encountered. |
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|
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The host SIGSEGV and SIGBUS signal handlers are used to get invalid |
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memory accesses. The exact CPU state can be retrieved because all the |
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x86 registers are stored in fixed host registers. The simulated program |
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counter is found by retranslating the corresponding basic block and by |
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looking where the host program counter was at the exception point. |
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|
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The virtual CPU cannot retrieve the exact @code{EFLAGS} register because |
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in some cases it is not computed because of condition code |
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optimisations. It is not a big concern because the emulated code can |
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still be restarted in any cases. |
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|
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@node MMU emulation |
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@section MMU emulation |
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|
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For system emulation, QEMU uses the mmap() system call to emulate the |
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target CPU MMU. It works as long the emulated OS does not use an area |
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reserved by the host OS (such as the area above 0xc0000000 on x86 |
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Linux). |
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|
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In order to be able to launch any OS, QEMU also supports a soft |
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MMU. In that mode, the MMU virtual to physical address translation is |
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done at every memory access. QEMU uses an address translation cache to |
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speed up the translation. |
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|
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In order to avoid flushing the translated code each time the MMU |
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mappings change, QEMU uses a physically indexed translation cache. It |
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means that each basic block is indexed with its physical address. |
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|
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When MMU mappings change, only the chaining of the basic blocks is |
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reset (i.e. a basic block can no longer jump directly to another one). |
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|
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@node Hardware interrupts |
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@section Hardware interrupts |
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|
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In order to be faster, QEMU does not check at every basic block if an |
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hardware interrupt is pending. Instead, the user must asynchrously |
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call a specific function to tell that an interrupt is pending. This |
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function resets the chaining of the currently executing basic |
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block. It ensures that the execution will return soon in the main loop |
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of the CPU emulator. Then the main loop can test if the interrupt is |
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pending and handle it. |
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|
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@node User emulation specific details |
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@section User emulation specific details |
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|
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@subsection Linux system call translation |
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|
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QEMU includes a generic system call translator for Linux. It means that |
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the parameters of the system calls can be converted to fix the |
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endianness and 32/64 bit issues. The IOCTLs are converted with a generic |
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type description system (see @file{ioctls.h} and @file{thunk.c}). |
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|
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QEMU supports host CPUs which have pages bigger than 4KB. It records all |
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the mappings the process does and try to emulated the @code{mmap()} |
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system calls in cases where the host @code{mmap()} call would fail |
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because of bad page alignment. |
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|
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@subsection Linux signals |
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|
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Normal and real-time signals are queued along with their information |
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(@code{siginfo_t}) as it is done in the Linux kernel. Then an interrupt |
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request is done to the virtual CPU. When it is interrupted, one queued |
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signal is handled by generating a stack frame in the virtual CPU as the |
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Linux kernel does. The @code{sigreturn()} system call is emulated to return |
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from the virtual signal handler. |
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|
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Some signals (such as SIGALRM) directly come from the host. Other |
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signals are synthetized from the virtual CPU exceptions such as SIGFPE |
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when a division by zero is done (see @code{main.c:cpu_loop()}). |
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|
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The blocked signal mask is still handled by the host Linux kernel so |
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that most signal system calls can be redirected directly to the host |
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Linux kernel. Only the @code{sigaction()} and @code{sigreturn()} system |
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calls need to be fully emulated (see @file{signal.c}). |
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|
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@subsection clone() system call and threads |
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|
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The Linux clone() system call is usually used to create a thread. QEMU |
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uses the host clone() system call so that real host threads are created |
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for each emulated thread. One virtual CPU instance is created for each |
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thread. |
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|
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The virtual x86 CPU atomic operations are emulated with a global lock so |
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that their semantic is preserved. |
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|
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Note that currently there are still some locking issues in QEMU. In |
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particular, the translated cache flush is not protected yet against |
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reentrancy. |
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|
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@subsection Self-virtualization |
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|
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QEMU was conceived so that ultimately it can emulate itself. Although |
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it is not very useful, it is an important test to show the power of the |
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emulator. |
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|
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Achieving self-virtualization is not easy because there may be address |
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space conflicts. QEMU solves this problem by being an executable ELF |
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shared object as the ld-linux.so ELF interpreter. That way, it can be |
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relocated at load time. |
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|
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@node Bibliography |
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@section Bibliography |
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|
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@table @asis |
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|
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@item [1] |
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@url{http://citeseer.nj.nec.com/piumarta98optimizing.html}, Optimizing |
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direct threaded code by selective inlining (1998) by Ian Piumarta, Fabio |
528 |
Riccardi. |
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|
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@item [2] |
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@url{http://developer.kde.org/~sewardj/}, Valgrind, an open-source |
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memory debugger for x86-GNU/Linux, by Julian Seward. |
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|
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@item [3] |
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@url{http://bochs.sourceforge.net/}, the Bochs IA-32 Emulator Project, |
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by Kevin Lawton et al. |
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|
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@item [4] |
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@url{http://www.cs.rose-hulman.edu/~donaldlf/em86/index.html}, the EM86 |
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x86 emulator on Alpha-Linux. |
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|
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@item [5] |
543 |
@url{http://www.usenix.org/publications/library/proceedings/usenix-nt97/@/full_papers/chernoff/chernoff.pdf}, |
544 |
DIGITAL FX!32: Running 32-Bit x86 Applications on Alpha NT, by Anton |
545 |
Chernoff and Ray Hookway. |
546 |
|
547 |
@item [6] |
548 |
@url{http://www.willows.com/}, Windows API library emulation from |
549 |
Willows Software. |
550 |
|
551 |
@item [7] |
552 |
@url{http://user-mode-linux.sourceforge.net/}, |
553 |
The User-mode Linux Kernel. |
554 |
|
555 |
@item [8] |
556 |
@url{http://www.plex86.org/}, |
557 |
The new Plex86 project. |
558 |
|
559 |
@item [9] |
560 |
@url{http://www.vmware.com/}, |
561 |
The VMWare PC virtualizer. |
562 |
|
563 |
@item [10] |
564 |
@url{http://www.microsoft.com/windowsxp/virtualpc/}, |
565 |
The VirtualPC PC virtualizer. |
566 |
|
567 |
@item [11] |
568 |
@url{http://www.twoostwo.org/}, |
569 |
The TwoOStwo PC virtualizer. |
570 |
|
571 |
@end table |
572 |
|
573 |
@node Regression Tests |
574 |
@chapter Regression Tests |
575 |
|
576 |
In the directory @file{tests/}, various interesting testing programs |
577 |
are available. They are used for regression testing. |
578 |
|
579 |
@menu |
580 |
* test-i386:: |
581 |
* linux-test:: |
582 |
* qruncom.c:: |
583 |
@end menu |
584 |
|
585 |
@node test-i386 |
586 |
@section @file{test-i386} |
587 |
|
588 |
This program executes most of the 16 bit and 32 bit x86 instructions and |
589 |
generates a text output. It can be compared with the output obtained with |
590 |
a real CPU or another emulator. The target @code{make test} runs this |
591 |
program and a @code{diff} on the generated output. |
592 |
|
593 |
The Linux system call @code{modify_ldt()} is used to create x86 selectors |
594 |
to test some 16 bit addressing and 32 bit with segmentation cases. |
595 |
|
596 |
The Linux system call @code{vm86()} is used to test vm86 emulation. |
597 |
|
598 |
Various exceptions are raised to test most of the x86 user space |
599 |
exception reporting. |
600 |
|
601 |
@node linux-test |
602 |
@section @file{linux-test} |
603 |
|
604 |
This program tests various Linux system calls. It is used to verify |
605 |
that the system call parameters are correctly converted between target |
606 |
and host CPUs. |
607 |
|
608 |
@node qruncom.c |
609 |
@section @file{qruncom.c} |
610 |
|
611 |
Example of usage of @code{libqemu} to emulate a user mode i386 CPU. |
612 |
|
613 |
@node Index |
614 |
@chapter Index |
615 |
@printindex cp |
616 |
|
617 |
@bye |