2) Overview
Initialization.
Initialization is done with a bootstrap loader that creates
the "start of day" state. This is a known state, running 32-bit
protected mode code with paging enabled. The guest has all the
standard structures in memory that are provided by a native ROM
boot environment, including a memory map and ACPI tables. For
the native hardware, this bootstrap loader can be run before
the kernel code proper, and this environment can be created
readily from within the hypervisor for the virtual case. At
some point, the bootstrap loader or the kernel itself invokes
the initialization call to enter paravirtualized mode.
Privilege Model.
The guest kernel must be modified to run at a dynamic privilege
level, since if entry to paravirtual mode is successful, the kernel
is no longer allowed to run at the highest hardware privilege level.
On the IA-32 architecture, this means the kernel will be running at
CPL 1-2, and with the hypervisor running at CPL0, and user code at
CPL3. The IOPL will be lowered as well to avoid giving the guest
direct access to hardware ports and control of the interrupt flag.
This change causes certain IA-32 instructions to become "sensitive",
so additional support for clearing and setting the hardware
interrupt flag are present. Since the switch into paravirtual mode
may happen dynamically, the guest OS must not rely on testing for a
specific privilege level by checking the RPL field of segment
selectors, but should check for privileged execution by performing
an (RPL != 3 && !EFLAGS_VM) comparison. This means the DPL of kernel
ring descriptors in the GDT or LDT may be raised to match the CPL of
the kernel. This change is visible by inspecting the segments
registers while running in privileged code, and by using the LAR
instruction.
The system also cannot be allowed to write directly to the hardware
GDT, LDT, IDT, or TSS, so these data structures are maintained by the
hypervisor, and may be shadowed or guest visible structures. These
structures are required to be page aligned to support non-shadowed
operation.
Currently, the system only provides for two guest security domains,
kernel (which runs at the equivalent of virtual CPL-0), and user
(which runs at the equivalent of virtual CPL-3, with no hardware
access). Typically, this is not a problem, but if a guest OS relies
on using multiple hardware rings for privilege isolation, this
interface would need to be expanded to support that.
Memory Management.
Since a virtual machine typically does not have access to all the
physical memory on the machine, there is a need to redefine the
physical address space layout for the virtual machine. The
spectrum of possibilities ranges from presenting the guest with
a view of a physically contiguous memory of a boot-time determined
size, exactly what the guest would see when running on hardware, to
the opposite, which presents the guest with the actual machine pages
which the hypervisor has allocated for it. Using this approach
requires the guest to obtain information about the pages it has
from the hypervisor; this can be done by using the memory map which
would normally be passed to the guest by the BIOS.
The interface is designed to support either mode of operation.
This allows the implementation to use either direct page tables
or shadow page tables, or some combination of both. All writes to
page table entries are done through calls to the hypervisor
interface layer. The guest notifies the hypervisor about page
tables updates, flushes, and invalidations through API calls.
The guest OS is also responsible for notifying the hypervisor about
which pages in its physical memory are going to be used to hold page
tables or page directories. Both PAE and non-PAE paging modes are
supported. When the guest is finished using pages as page tables, it
should release them promptly to allow the hypervisor to free the
page table shadows. Using a page as both a page table and a page
directory for linear page table access is possible, but currently
not supported by our implementation.
The hypervisor lives concurrently in the same address space as the
guest operating system. Although this is not strictly necessary on
IA-32 hardware, performance would be severely degraded if that were
not the case. The hypervisor must therefore reserve some portion of
linear address space for its own use. The implementation currently
reserves the top 64 megabytes of linear space for the hypervisor.
This requires the guest to relocate any data in high linear space
down by 64 megabytes. For non-paging mode guests, this means the
high 64 megabytes of physical memory should be reserved. Because
page tables are not sensitive to CPL, only to user/supervisor level,
the hypervisor must combine segment protection to ensure that the
guest can not access this 64 megabyte region.
An experimental patch is available to enable boot-time sizing of
the hypervisor hole.
Segmentation.
The IA-32 architecture provides segmented virtual memory, which can
be used as another form of privilege separation. Each segment
contains a base, limit, and properties. The base is added to the
virtual address to form a linear address. The limit determines the
length of linear space which is addressable through the segment.
The properties determine read/write, code and data size of the
region, as well as the direction in which segments grow. Segments
are loaded from descriptors in one of two system tables, the GDT or
the LDT, and the values loaded are cached until the next load of the
segment. This property, known as segment caching, allows the
machine to be put into a non-reversible state by writing over the
descriptor table entry from which a segment was loaded. There is no
efficient way to extract the base field of the segment after it is
loaded, as it is hidden by the processor. In a hypervisor
environment, the guest OS can be interrupted at any point in time by
interrupts and NMIs which must be serviced by the hypervisor. The
hypervisor must be able to recreate the original guest state when it
is done servicing the external event.
To avoid creating non-reversible segments, the hypervisor will
forcibly reload any live segment registers that are updated by
writes to the descriptor tables. *N.B - in the event that a segment
is put into an invalid or not present state by an update to the
descriptor table, the segment register must be forced to NULL so
that reloading it will not cause a general protection fault (#GP)
when restoring the guest state. This may require the guest to save
the segment register value before issuing a hypervisor API call
which will update the descriptor table.*
Because the hypervisor must protect its own memory space from
privileged code running in the guest at CPL1-2, descriptors may not
provide access to the 64 megabyte region of high linear space. To
achieve this, the hypervisor will truncate descriptors in the
descriptor tables. This means that attempts by the guest to access
through negative offsets to the segment base will fault, so this is
highly discouraged (some TLS implementations on Linux do this).
In addition, this causes the truncated length of the segment to
become visible to the guest through the LSL instruction.
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