613 lines
30 KiB
Plaintext
Executable File
613 lines
30 KiB
Plaintext
Executable File
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Timekeeping Virtualization for X86-Based Architectures
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Zachary Amsden <zamsden@redhat.com>
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Copyright (c) 2010, Red Hat. All rights reserved.
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1) Overview
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2) Timing Devices
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3) TSC Hardware
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4) Virtualization Problems
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=========================================================================
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1) Overview
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One of the most complicated parts of the X86 platform, and specifically,
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the virtualization of this platform is the plethora of timing devices available
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and the complexity of emulating those devices. In addition, virtualization of
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time introduces a new set of challenges because it introduces a multiplexed
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division of time beyond the control of the guest CPU.
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First, we will describe the various timekeeping hardware available, then
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present some of the problems which arise and solutions available, giving
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specific recommendations for certain classes of KVM guests.
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The purpose of this document is to collect data and information relevant to
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timekeeping which may be difficult to find elsewhere, specifically,
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information relevant to KVM and hardware-based virtualization.
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=========================================================================
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2) Timing Devices
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First we discuss the basic hardware devices available. TSC and the related
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KVM clock are special enough to warrant a full exposition and are described in
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the following section.
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2.1) i8254 - PIT
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One of the first timer devices available is the programmable interrupt timer,
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or PIT. The PIT has a fixed frequency 1.193182 MHz base clock and three
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channels which can be programmed to deliver periodic or one-shot interrupts.
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These three channels can be configured in different modes and have individual
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counters. Channel 1 and 2 were not available for general use in the original
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IBM PC, and historically were connected to control RAM refresh and the PC
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speaker. Now the PIT is typically integrated as part of an emulated chipset
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and a separate physical PIT is not used.
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The PIT uses I/O ports 0x40 - 0x43. Access to the 16-bit counters is done
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using single or multiple byte access to the I/O ports. There are 6 modes
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available, but not all modes are available to all timers, as only timer 2
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has a connected gate input, required for modes 1 and 5. The gate line is
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controlled by port 61h, bit 0, as illustrated in the following diagram.
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-------------- ----------------
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| | | |
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| 1.1932 MHz |---------->| CLOCK OUT | ---------> IRQ 0
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| Clock | | | |
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-------------- | +->| GATE TIMER 0 |
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| ----------------
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| ----------------
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| | |
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|------>| CLOCK OUT | ---------> 66.3 KHZ DRAM
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| | | (aka /dev/null)
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| +->| GATE TIMER 1 |
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| ----------------
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| ----------------
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| | |
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|------>| CLOCK OUT | ---------> Port 61h, bit 5
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| | |
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Port 61h, bit 0 ---------->| GATE TIMER 2 | \_.---- ____
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---------------- _| )--|LPF|---Speaker
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/ *---- \___/
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Port 61h, bit 1 -----------------------------------/
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The timer modes are now described.
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Mode 0: Single Timeout. This is a one-shot software timeout that counts down
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when the gate is high (always true for timers 0 and 1). When the count
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reaches zero, the output goes high.
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Mode 1: Triggered One-shot. The output is initially set high. When the gate
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line is set high, a countdown is initiated (which does not stop if the gate is
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lowered), during which the output is set low. When the count reaches zero,
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the output goes high.
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Mode 2: Rate Generator. The output is initially set high. When the countdown
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reaches 1, the output goes low for one count and then returns high. The value
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is reloaded and the countdown automatically resumes. If the gate line goes
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low, the count is halted. If the output is low when the gate is lowered, the
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output automatically goes high (this only affects timer 2).
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Mode 3: Square Wave. This generates a high / low square wave. The count
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determines the length of the pulse, which alternates between high and low
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when zero is reached. The count only proceeds when gate is high and is
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automatically reloaded on reaching zero. The count is decremented twice at
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each clock to generate a full high / low cycle at the full periodic rate.
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If the count is even, the clock remains high for N/2 counts and low for N/2
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counts; if the clock is odd, the clock is high for (N+1)/2 counts and low
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for (N-1)/2 counts. Only even values are latched by the counter, so odd
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values are not observed when reading. This is the intended mode for timer 2,
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which generates sine-like tones by low-pass filtering the square wave output.
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Mode 4: Software Strobe. After programming this mode and loading the counter,
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the output remains high until the counter reaches zero. Then the output
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goes low for 1 clock cycle and returns high. The counter is not reloaded.
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Counting only occurs when gate is high.
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Mode 5: Hardware Strobe. After programming and loading the counter, the
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output remains high. When the gate is raised, a countdown is initiated
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(which does not stop if the gate is lowered). When the counter reaches zero,
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the output goes low for 1 clock cycle and then returns high. The counter is
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not reloaded.
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In addition to normal binary counting, the PIT supports BCD counting. The
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command port, 0x43 is used to set the counter and mode for each of the three
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timers.
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PIT commands, issued to port 0x43, using the following bit encoding:
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Bit 7-4: Command (See table below)
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Bit 3-1: Mode (000 = Mode 0, 101 = Mode 5, 11X = undefined)
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Bit 0 : Binary (0) / BCD (1)
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Command table:
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0000 - Latch Timer 0 count for port 0x40
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sample and hold the count to be read in port 0x40;
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additional commands ignored until counter is read;
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mode bits ignored.
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0001 - Set Timer 0 LSB mode for port 0x40
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set timer to read LSB only and force MSB to zero;
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mode bits set timer mode
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0010 - Set Timer 0 MSB mode for port 0x40
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set timer to read MSB only and force LSB to zero;
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mode bits set timer mode
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0011 - Set Timer 0 16-bit mode for port 0x40
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set timer to read / write LSB first, then MSB;
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mode bits set timer mode
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0100 - Latch Timer 1 count for port 0x41 - as described above
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0101 - Set Timer 1 LSB mode for port 0x41 - as described above
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0110 - Set Timer 1 MSB mode for port 0x41 - as described above
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0111 - Set Timer 1 16-bit mode for port 0x41 - as described above
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1000 - Latch Timer 2 count for port 0x42 - as described above
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1001 - Set Timer 2 LSB mode for port 0x42 - as described above
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1010 - Set Timer 2 MSB mode for port 0x42 - as described above
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1011 - Set Timer 2 16-bit mode for port 0x42 as described above
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1101 - General counter latch
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Latch combination of counters into corresponding ports
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Bit 3 = Counter 2
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Bit 2 = Counter 1
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Bit 1 = Counter 0
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Bit 0 = Unused
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1110 - Latch timer status
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Latch combination of counter mode into corresponding ports
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Bit 3 = Counter 2
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Bit 2 = Counter 1
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Bit 1 = Counter 0
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The output of ports 0x40-0x42 following this command will be:
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Bit 7 = Output pin
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Bit 6 = Count loaded (0 if timer has expired)
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Bit 5-4 = Read / Write mode
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01 = MSB only
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10 = LSB only
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11 = LSB / MSB (16-bit)
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Bit 3-1 = Mode
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Bit 0 = Binary (0) / BCD mode (1)
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2.2) RTC
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The second device which was available in the original PC was the MC146818 real
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time clock. The original device is now obsolete, and usually emulated by the
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system chipset, sometimes by an HPET and some frankenstein IRQ routing.
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The RTC is accessed through CMOS variables, which uses an index register to
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control which bytes are read. Since there is only one index register, read
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of the CMOS and read of the RTC require lock protection (in addition, it is
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dangerous to allow userspace utilities such as hwclock to have direct RTC
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access, as they could corrupt kernel reads and writes of CMOS memory).
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The RTC generates an interrupt which is usually routed to IRQ 8. The interrupt
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can function as a periodic timer, an additional once a day alarm, and can issue
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interrupts after an update of the CMOS registers by the MC146818 is complete.
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The type of interrupt is signalled in the RTC status registers.
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The RTC will update the current time fields by battery power even while the
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system is off. The current time fields should not be read while an update is
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in progress, as indicated in the status register.
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The clock uses a 32.768kHz crystal, so bits 6-4 of register A should be
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programmed to a 32kHz divider if the RTC is to count seconds.
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This is the RAM map originally used for the RTC/CMOS:
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Location Size Description
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------------------------------------------
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00h byte Current second (BCD)
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01h byte Seconds alarm (BCD)
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02h byte Current minute (BCD)
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03h byte Minutes alarm (BCD)
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04h byte Current hour (BCD)
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05h byte Hours alarm (BCD)
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06h byte Current day of week (BCD)
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07h byte Current day of month (BCD)
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08h byte Current month (BCD)
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09h byte Current year (BCD)
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0Ah byte Register A
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bit 7 = Update in progress
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bit 6-4 = Divider for clock
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000 = 4.194 MHz
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001 = 1.049 MHz
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010 = 32 kHz
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10X = test modes
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110 = reset / disable
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111 = reset / disable
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bit 3-0 = Rate selection for periodic interrupt
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000 = periodic timer disabled
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001 = 3.90625 uS
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010 = 7.8125 uS
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011 = .122070 mS
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100 = .244141 mS
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...
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1101 = 125 mS
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1110 = 250 mS
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1111 = 500 mS
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0Bh byte Register B
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bit 7 = Run (0) / Halt (1)
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bit 6 = Periodic interrupt enable
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bit 5 = Alarm interrupt enable
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bit 4 = Update-ended interrupt enable
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bit 3 = Square wave interrupt enable
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bit 2 = BCD calendar (0) / Binary (1)
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bit 1 = 12-hour mode (0) / 24-hour mode (1)
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bit 0 = 0 (DST off) / 1 (DST enabled)
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OCh byte Register C (read only)
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bit 7 = interrupt request flag (IRQF)
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bit 6 = periodic interrupt flag (PF)
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bit 5 = alarm interrupt flag (AF)
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bit 4 = update interrupt flag (UF)
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bit 3-0 = reserved
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ODh byte Register D (read only)
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bit 7 = RTC has power
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bit 6-0 = reserved
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32h byte Current century BCD (*)
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(*) location vendor specific and now determined from ACPI global tables
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2.3) APIC
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On Pentium and later processors, an on-board timer is available to each CPU
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as part of the Advanced Programmable Interrupt Controller. The APIC is
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accessed through memory-mapped registers and provides interrupt service to each
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CPU, used for IPIs and local timer interrupts.
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Although in theory the APIC is a safe and stable source for local interrupts,
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in practice, many bugs and glitches have occurred due to the special nature of
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the APIC CPU-local memory-mapped hardware. Beware that CPU errata may affect
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the use of the APIC and that workarounds may be required. In addition, some of
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these workarounds pose unique constraints for virtualization - requiring either
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extra overhead incurred from extra reads of memory-mapped I/O or additional
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functionality that may be more computationally expensive to implement.
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Since the APIC is documented quite well in the Intel and AMD manuals, we will
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avoid repetition of the detail here. It should be pointed out that the APIC
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timer is programmed through the LVT (local vector timer) register, is capable
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of one-shot or periodic operation, and is based on the bus clock divided down
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by the programmable divider register.
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2.4) HPET
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HPET is quite complex, and was originally intended to replace the PIT / RTC
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support of the X86 PC. It remains to be seen whether that will be the case, as
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the de facto standard of PC hardware is to emulate these older devices. Some
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systems designated as legacy free may support only the HPET as a hardware timer
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device.
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The HPET spec is rather loose and vague, requiring at least 3 hardware timers,
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but allowing implementation freedom to support many more. It also imposes no
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fixed rate on the timer frequency, but does impose some extremal values on
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frequency, error and slew.
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In general, the HPET is recommended as a high precision (compared to PIT /RTC)
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time source which is independent of local variation (as there is only one HPET
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in any given system). The HPET is also memory-mapped, and its presence is
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indicated through ACPI tables by the BIOS.
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Detailed specification of the HPET is beyond the current scope of this
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document, as it is also very well documented elsewhere.
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2.5) Offboard Timers
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Several cards, both proprietary (watchdog boards) and commonplace (e1000) have
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timing chips built into the cards which may have registers which are accessible
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to kernel or user drivers. To the author's knowledge, using these to generate
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a clocksource for a Linux or other kernel has not yet been attempted and is in
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general frowned upon as not playing by the agreed rules of the game. Such a
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timer device would require additional support to be virtualized properly and is
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not considered important at this time as no known operating system does this.
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=========================================================================
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3) TSC Hardware
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The TSC or time stamp counter is relatively simple in theory; it counts
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instruction cycles issued by the processor, which can be used as a measure of
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time. In practice, due to a number of problems, it is the most complicated
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timekeeping device to use.
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The TSC is represented internally as a 64-bit MSR which can be read with the
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RDMSR, RDTSC, or RDTSCP (when available) instructions. In the past, hardware
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limitations made it possible to write the TSC, but generally on old hardware it
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was only possible to write the low 32-bits of the 64-bit counter, and the upper
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32-bits of the counter were cleared. Now, however, on Intel processors family
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0Fh, for models 3, 4 and 6, and family 06h, models e and f, this restriction
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has been lifted and all 64-bits are writable. On AMD systems, the ability to
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write the TSC MSR is not an architectural guarantee.
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The TSC is accessible from CPL-0 and conditionally, for CPL > 0 software by
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means of the CR4.TSD bit, which when enabled, disables CPL > 0 TSC access.
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Some vendors have implemented an additional instruction, RDTSCP, which returns
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atomically not just the TSC, but an indicator which corresponds to the
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processor number. This can be used to index into an array of TSC variables to
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determine offset information in SMP systems where TSCs are not synchronized.
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The presence of this instruction must be determined by consulting CPUID feature
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bits.
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Both VMX and SVM provide extension fields in the virtualization hardware which
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allows the guest visible TSC to be offset by a constant. Newer implementations
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promise to allow the TSC to additionally be scaled, but this hardware is not
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yet widely available.
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3.1) TSC synchronization
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The TSC is a CPU-local clock in most implementations. This means, on SMP
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platforms, the TSCs of different CPUs may start at different times depending
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on when the CPUs are powered on. Generally, CPUs on the same die will share
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the same clock, however, this is not always the case.
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The BIOS may attempt to resynchronize the TSCs during the poweron process and
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the operating system or other system software may attempt to do this as well.
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Several hardware limitations make the problem worse - if it is not possible to
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write the full 64-bits of the TSC, it may be impossible to match the TSC in
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newly arriving CPUs to that of the rest of the system, resulting in
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unsynchronized TSCs. This may be done by BIOS or system software, but in
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practice, getting a perfectly synchronized TSC will not be possible unless all
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values are read from the same clock, which generally only is possible on single
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socket systems or those with special hardware support.
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3.2) TSC and CPU hotplug
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As touched on already, CPUs which arrive later than the boot time of the system
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may not have a TSC value that is synchronized with the rest of the system.
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Either system software, BIOS, or SMM code may actually try to establish the TSC
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to a value matching the rest of the system, but a perfect match is usually not
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a guarantee. This can have the effect of bringing a system from a state where
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TSC is synchronized back to a state where TSC synchronization flaws, however
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small, may be exposed to the OS and any virtualization environment.
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3.3) TSC and multi-socket / NUMA
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Multi-socket systems, especially large multi-socket systems are likely to have
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individual clocksources rather than a single, universally distributed clock.
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Since these clocks are driven by different crystals, they will not have
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perfectly matched frequency, and temperature and electrical variations will
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cause the CPU clocks, and thus the TSCs to drift over time. Depending on the
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exact clock and bus design, the drift may or may not be fixed in absolute
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error, and may accumulate over time.
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In addition, very large systems may deliberately slew the clocks of individual
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cores. This technique, known as spread-spectrum clocking, reduces EMI at the
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clock frequency and harmonics of it, which may be required to pass FCC
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standards for telecommunications and computer equipment.
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It is recommended not to trust the TSCs to remain synchronized on NUMA or
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multiple socket systems for these reasons.
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3.4) TSC and C-states
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C-states, or idling states of the processor, especially C1E and deeper sleep
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states may be problematic for TSC as well. The TSC may stop advancing in such
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a state, resulting in a TSC which is behind that of other CPUs when execution
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is resumed. Such CPUs must be detected and flagged by the operating system
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based on CPU and chipset identifications.
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The TSC in such a case may be corrected by catching it up to a known external
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clocksource.
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3.5) TSC frequency change / P-states
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To make things slightly more interesting, some CPUs may change frequency. They
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may or may not run the TSC at the same rate, and because the frequency change
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may be staggered or slewed, at some points in time, the TSC rate may not be
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known other than falling within a range of values. In this case, the TSC will
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not be a stable time source, and must be calibrated against a known, stable,
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external clock to be a usable source of time.
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Whether the TSC runs at a constant rate or scales with the P-state is model
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dependent and must be determined by inspecting CPUID, chipset or vendor
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specific MSR fields.
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In addition, some vendors have known bugs where the P-state is actually
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compensated for properly during normal operation, but when the processor is
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inactive, the P-state may be raised temporarily to service cache misses from
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other processors. In such cases, the TSC on halted CPUs could advance faster
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than that of non-halted processors. AMD Turion processors are known to have
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this problem.
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3.6) TSC and STPCLK / T-states
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External signals given to the processor may also have the effect of stopping
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the TSC. This is typically done for thermal emergency power control to prevent
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an overheating condition, and typically, there is no way to detect that this
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condition has happened.
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3.7) TSC virtualization - VMX
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VMX provides conditional trapping of RDTSC, RDMSR, WRMSR and RDTSCP
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instructions, which is enough for full virtualization of TSC in any manner. In
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addition, VMX allows passing through the host TSC plus an additional TSC_OFFSET
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field specified in the VMCS. Special instructions must be used to read and
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write the VMCS field.
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3.8) TSC virtualization - SVM
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SVM provides conditional trapping of RDTSC, RDMSR, WRMSR and RDTSCP
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instructions, which is enough for full virtualization of TSC in any manner. In
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addition, SVM allows passing through the host TSC plus an additional offset
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field specified in the SVM control block.
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3.9) TSC feature bits in Linux
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In summary, there is no way to guarantee the TSC remains in perfect
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synchronization unless it is explicitly guaranteed by the architecture. Even
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if so, the TSCs in multi-sockets or NUMA systems may still run independently
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despite being locally consistent.
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The following feature bits are used by Linux to signal various TSC attributes,
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but they can only be taken to be meaningful for UP or single node systems.
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X86_FEATURE_TSC : The TSC is available in hardware
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X86_FEATURE_RDTSCP : The RDTSCP instruction is available
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X86_FEATURE_CONSTANT_TSC : The TSC rate is unchanged with P-states
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X86_FEATURE_NONSTOP_TSC : The TSC does not stop in C-states
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X86_FEATURE_TSC_RELIABLE : TSC sync checks are skipped (VMware)
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4) Virtualization Problems
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Timekeeping is especially problematic for virtualization because a number of
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challenges arise. The most obvious problem is that time is now shared between
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the host and, potentially, a number of virtual machines. Thus the virtual
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operating system does not run with 100% usage of the CPU, despite the fact that
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it may very well make that assumption. It may expect it to remain true to very
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exacting bounds when interrupt sources are disabled, but in reality only its
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virtual interrupt sources are disabled, and the machine may still be preempted
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|
at any time. This causes problems as the passage of real time, the injection
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|
of machine interrupts and the associated clock sources are no longer completely
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|
synchronized with real time.
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This same problem can occur on native hardware to a degree, as SMM mode may
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steal cycles from the naturally on X86 systems when SMM mode is used by the
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BIOS, but not in such an extreme fashion. However, the fact that SMM mode may
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cause similar problems to virtualization makes it a good justification for
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solving many of these problems on bare metal.
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4.1) Interrupt clocking
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One of the most immediate problems that occurs with legacy operating systems
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|
is that the system timekeeping routines are often designed to keep track of
|
|
time by counting periodic interrupts. These interrupts may come from the PIT
|
|
or the RTC, but the problem is the same: the host virtualization engine may not
|
|
be able to deliver the proper number of interrupts per second, and so guest
|
|
time may fall behind. This is especially problematic if a high interrupt rate
|
|
is selected, such as 1000 HZ, which is unfortunately the default for many Linux
|
|
guests.
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|
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|
There are three approaches to solving this problem; first, it may be possible
|
|
to simply ignore it. Guests which have a separate time source for tracking
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|
'wall clock' or 'real time' may not need any adjustment of their interrupts to
|
|
maintain proper time. If this is not sufficient, it may be necessary to inject
|
|
additional interrupts into the guest in order to increase the effective
|
|
interrupt rate. This approach leads to complications in extreme conditions,
|
|
where host load or guest lag is too much to compensate for, and thus another
|
|
solution to the problem has risen: the guest may need to become aware of lost
|
|
ticks and compensate for them internally. Although promising in theory, the
|
|
implementation of this policy in Linux has been extremely error prone, and a
|
|
number of buggy variants of lost tick compensation are distributed across
|
|
commonly used Linux systems.
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|
|
|
Windows uses periodic RTC clocking as a means of keeping time internally, and
|
|
thus requires interrupt slewing to keep proper time. It does use a low enough
|
|
rate (ed: is it 18.2 Hz?) however that it has not yet been a problem in
|
|
practice.
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|
|
|
4.2) TSC sampling and serialization
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|
|
|
As the highest precision time source available, the cycle counter of the CPU
|
|
has aroused much interest from developers. As explained above, this timer has
|
|
many problems unique to its nature as a local, potentially unstable and
|
|
potentially unsynchronized source. One issue which is not unique to the TSC,
|
|
but is highlighted because of its very precise nature is sampling delay. By
|
|
definition, the counter, once read is already old. However, it is also
|
|
possible for the counter to be read ahead of the actual use of the result.
|
|
This is a consequence of the superscalar execution of the instruction stream,
|
|
which may execute instructions out of order. Such execution is called
|
|
non-serialized. Forcing serialized execution is necessary for precise
|
|
measurement with the TSC, and requires a serializing instruction, such as CPUID
|
|
or an MSR read.
|
|
|
|
Since CPUID may actually be virtualized by a trap and emulate mechanism, this
|
|
serialization can pose a performance issue for hardware virtualization. An
|
|
accurate time stamp counter reading may therefore not always be available, and
|
|
it may be necessary for an implementation to guard against "backwards" reads of
|
|
the TSC as seen from other CPUs, even in an otherwise perfectly synchronized
|
|
system.
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|
|
|
4.3) Timespec aliasing
|
|
|
|
Additionally, this lack of serialization from the TSC poses another challenge
|
|
when using results of the TSC when measured against another time source. As
|
|
the TSC is much higher precision, many possible values of the TSC may be read
|
|
while another clock is still expressing the same value.
|
|
|
|
That is, you may read (T,T+10) while external clock C maintains the same value.
|
|
Due to non-serialized reads, you may actually end up with a range which
|
|
fluctuates - from (T-1.. T+10). Thus, any time calculated from a TSC, but
|
|
calibrated against an external value may have a range of valid values.
|
|
Re-calibrating this computation may actually cause time, as computed after the
|
|
calibration, to go backwards, compared with time computed before the
|
|
calibration.
|
|
|
|
This problem is particularly pronounced with an internal time source in Linux,
|
|
the kernel time, which is expressed in the theoretically high resolution
|
|
timespec - but which advances in much larger granularity intervals, sometimes
|
|
at the rate of jiffies, and possibly in catchup modes, at a much larger step.
|
|
|
|
This aliasing requires care in the computation and recalibration of kvmclock
|
|
and any other values derived from TSC computation (such as TSC virtualization
|
|
itself).
|
|
|
|
4.4) Migration
|
|
|
|
Migration of a virtual machine raises problems for timekeeping in two ways.
|
|
First, the migration itself may take time, during which interrupts cannot be
|
|
delivered, and after which, the guest time may need to be caught up. NTP may
|
|
be able to help to some degree here, as the clock correction required is
|
|
typically small enough to fall in the NTP-correctable window.
|
|
|
|
An additional concern is that timers based off the TSC (or HPET, if the raw bus
|
|
clock is exposed) may now be running at different rates, requiring compensation
|
|
in some way in the hypervisor by virtualizing these timers. In addition,
|
|
migrating to a faster machine may preclude the use of a passthrough TSC, as a
|
|
faster clock cannot be made visible to a guest without the potential of time
|
|
advancing faster than usual. A slower clock is less of a problem, as it can
|
|
always be caught up to the original rate. KVM clock avoids these problems by
|
|
simply storing multipliers and offsets against the TSC for the guest to convert
|
|
back into nanosecond resolution values.
|
|
|
|
4.5) Scheduling
|
|
|
|
Since scheduling may be based on precise timing and firing of interrupts, the
|
|
scheduling algorithms of an operating system may be adversely affected by
|
|
virtualization. In theory, the effect is random and should be universally
|
|
distributed, but in contrived as well as real scenarios (guest device access,
|
|
causes of virtualization exits, possible context switch), this may not always
|
|
be the case. The effect of this has not been well studied.
|
|
|
|
In an attempt to work around this, several implementations have provided a
|
|
paravirtualized scheduler clock, which reveals the true amount of CPU time for
|
|
which a virtual machine has been running.
|
|
|
|
4.6) Watchdogs
|
|
|
|
Watchdog timers, such as the lock detector in Linux may fire accidentally when
|
|
running under hardware virtualization due to timer interrupts being delayed or
|
|
misinterpretation of the passage of real time. Usually, these warnings are
|
|
spurious and can be ignored, but in some circumstances it may be necessary to
|
|
disable such detection.
|
|
|
|
4.7) Delays and precision timing
|
|
|
|
Precise timing and delays may not be possible in a virtualized system. This
|
|
can happen if the system is controlling physical hardware, or issues delays to
|
|
compensate for slower I/O to and from devices. The first issue is not solvable
|
|
in general for a virtualized system; hardware control software can't be
|
|
adequately virtualized without a full real-time operating system, which would
|
|
require an RT aware virtualization platform.
|
|
|
|
The second issue may cause performance problems, but this is unlikely to be a
|
|
significant issue. In many cases these delays may be eliminated through
|
|
configuration or paravirtualization.
|
|
|
|
4.8) Covert channels and leaks
|
|
|
|
In addition to the above problems, time information will inevitably leak to the
|
|
guest about the host in anything but a perfect implementation of virtualized
|
|
time. This may allow the guest to infer the presence of a hypervisor (as in a
|
|
red-pill type detection), and it may allow information to leak between guests
|
|
by using CPU utilization itself as a signalling channel. Preventing such
|
|
problems would require completely isolated virtual time which may not track
|
|
real time any longer. This may be useful in certain security or QA contexts,
|
|
but in general isn't recommended for real-world deployment scenarios.
|