rdist

April 3, 2008

Is the emulation singularity near?

Filed under: PC Architecture,VM — Nate Lawson @ 6:00 am

While reading the book Computer Power and Human Reason, I began to wonder about emulation. Of course, any Turing machine can emulate any other (but possibly very slowly).  However, I am wondering if we’re near a singularity in whole-system emulation.

Whole-system emulation is where an entire computer, including CPU and peripherals, is emulated. This is different from a language VM (e.g., the JVM) or an OS VM (e.g., Linux UML). I gave a talk about VMs a few years ago that may be useful as a refresher. A whole system can be emulated by full instruction interpretation if the host CPU is a different architecture (e.g., Bochs or VICE) or by native execution with traps (e.g., VMware). The only difference is speed.

With the ever-growing prevalence of the x86 architecture, I am wondering whether we are near an emulation singularity. That is, a point in time where every machine ever produced in decent quantity, including every machine currently being sold, can be emulated at full speed on any widely-available desktop.

There are two classes of system that matter in this scenario: old and new machines. Old machines can be emulated via pure horsepower. When I run VICE, my virtual 6502 CPU, video chip, and sound chip are fully interpreted with cycle accuracy.  My desktop PC can be a Nintendo DS, numerous arcade games, or even a Playstation 2.  The fact that not only the main CPU but various custom graphics chips are being emulated is amazing.

New machines can be emulated at a decent speed if they share the same CPU architecture.  I think the spread of x86 is bringing us to that point in the near future.  Apple desktops and laptops, Sun servers, and the original Xbox are all based on x86 and can be emulated at full speed.  The advent of hardware virtualization makes it even easier to run multiple operating systems on the same platform.

There will continue to be new non-x86 systems (Xbox 360, Playstation 3, cellphones) but the gap is narrowing between their release and the appearance of the first emulator.  Since mainstream PCs are used as development platforms, the manufacturers themselves are designing the architecture to be emulated with a minimal amount of peripheral hardware (e.g., a chipset attached via USB).

Will we reach a singularity where every newly-released piece of mainstream hardware is readily emulated on current systems?  I think so — what do you think?

October 3, 2007

IOMMU – virtualization or DRM?

Filed under: Hardware,PC Architecture,Security,VM — Nate Lawson @ 5:00 am

Before deciding how to enable DMA protection, it’s important to figure out what current and future threats you’re trying to prevent. Since there are performance trade-offs with various approaches to adding an IOMMU, it’s important to figure out if you need one, and if so, how it will be used.Current threats using DMA have centered around the easiest to use interface, Firewire (IEEE 1394). Besides being a peripheral interconnect method, Firewire provides a message type that allows a device to directly DMA into a host’s memory. Some of the first talks on this include “0wned by an iPod” and “Hit by a Bus“. I especially like the latter method, where the status registers of an iPod are spoofed to convince the Windows host to disable Firewire’s built-in address restrictions.

Yes, Firewire already has DMA protection built in (see the OHCI spec.) There are a set of registers that the host-side 1394 device driver can program to specify what addresses are allowed. This allows legitimate data transfer to a buffer allocated by the OS while preventing devices from overwriting anything else.  Matasano previously wrote about how those registers can be accessed from the host side to disable protection.

There’s another threat that is quite scary once it appears but is probably still a long way off. Researchers, including myself, have long talked about rootkits persisting by storing themselves in a flash-updateable device and then taking over the OS on each boot by patching it via DMA. This threat has not emerged yet for a number of reasons. It’s by nature a targeted attack since you need to write a different rootkit for each model of device you want to backdoor. Patching the OS reliably becomes an issue if the user reinstalls it, so it would be a lot of work to maintain an OS-specific table of offsets. Mostly, there are just so many easier ways to backdoor systems that it’s not necessary to go this route.  So no one even pretends this is the reason for adding an IOMMU.

If you remember what happened with virtualization, I think there’s some interesting insight to what is driving the deployment of these features.  Hardware VM support (Intel VT, AMD SVM) were being developed around the same time as trusted-computing chipsets (Intel SMX, AMD skinit).  Likewise, DMA blocking (Intel NoDMA, AMD DEV) appeared before IOMMUs, which only start shipping in late 2007.

My theory about all this is that virtualization is something everyone wants.  Servers, desktops, and even laptops can now fully virtualize the OS.  Add an IOMMU and each OS can run native drivers on bare hardware.  When new virtualization features appear, software developers rush to support them.

DRM is a bit more of a mess.  Features like Intel SMX/AMD skinit go unused.  Where can I download one of these signed code segments all the manuals mention?  I predict you won’t see DMA protection being used to implement a protected path for DRM for a while, yet direct device access (i.e., faster virtualized IO) is already shipping in Xen.

The fundamental problem is one of misaligned interests.  The people that have an interest in DRM (content owners) do not make hardware or software.  Thus new capabilities that are useful for both virtualization and DRM, for example, will always first support virtualization.  We haven’t yet seen any mainstream DRM application support TPMs, and those have been out for four years.  So when is the sky going to fall?

September 28, 2007

Protecting memory from DMA

Filed under: Hardware,PC Architecture,Security,VM — Nate Lawson @ 5:00 am

Previously, we discussed how DMA works in the PC architecture. The northbridge is only aware of physical addresses and directs transactions to the appropriate devices or RAM based solely on that address.

Unlike within the CPU where there is virtual memory translation and protection, the chipset previously did not perform any translation of physical addresses or place restrictions on which addresses can be accessed. From the RAM’s perspective, a memory access that originated from the CPU or from the integrated Ethernet is exactly the same. Stability and security depended on the device driver properly programming the device to DMA only to physical addresses that were within the buffer assigned by the OS. This was fine except for device driver or hardware bugs, since ring 0 code was trusted.

With system-wide virtualization and DRM becoming more common, ring 0 code is no longer trusted. To avoid DMA corruption between guests or the host, the hypervisor previously would create a fake device for each OS instance. The guest talked to the fake device, and the host would multiplex the transactions over the real device. This has a lot of overhead, so it would be preferable to let the guest talk directly to the real device.

An IOMMU provides translation and protection for physical addresses. The hypervisor sets up a page table within the northbridge that groups page table entries by their device IDs. Then, when a DMA request arrives at the northbridge from a device, it is looked up by its ID, translated into the actual destination physical address, and allowed or denied based on the protection settings. If a write is denied, no data is transferred to RAM. If it’s a read, all bits are set to 1 in the response. Either way, an abort error is returned to the device as well.

DMA protection (AMD: DEV, Intel: NoDMA table) is currently available in shipping products and physical address translation (AMD: IOMMU, Intel: VT-d) is coming very soon. While these features were implemented separately, it is expected that they will usually be used together.

There have been a few surprising studies of IOMMU performance. The first paper, by IBM researchers, shows that the overhead in setting up and tearing down mappings consumed up to 60% more CPU than without. They discuss various mapping allocation strategies to address this. However, they all have their disadvantages. One of the strategies, setting up the mappings at guest startup and never changing them, interferes with the hypervisor strategy called “ballooning”, where resources are only allocated to a guest as it uses them. This is what allows VMware to run guests with more RAM available to them than the host actually has. Read the paper for more analysis of their other strategies.

Another paper, by Rice University researchers, proposes virtualization support built into the devices themselves (“CDNA”). They build a NIC that maintains a unique set of registers for each guest. Each guest believes it has direct access to the NIC, although requests to set up DMA go through the hypervisor. The NIC hardware manages the fair scheduling of DMA among all the register contexts, so actual packets going out on the wire will be balanced between the various guests sending them. This approach requires no IOMMU, but each device needs to be capable of maintaining multiple register contexts. Again, read this paper for a different take on device virtualization.

This research shows that an IOMMU is not the only way to achieve DMA protection, and it’s important to carefully design how a hypervisor uses an IOMMU to prevent a loss of performance. Next time, we’ll examine some usage scenarios for IOMMUs, both in virtualization and DRM.

September 27, 2007

PC memory architecture overview

Filed under: Hardware,PC Architecture,Security,VM — Nate Lawson @ 5:00 am

The topics of DMA protection and a new Intel/AMD feature called an IOMMU (or VT-d) are becoming more prevalent. I believe this is due to two trends: increased use of virtualization and hardware protection for DRM. It’s important to first understand how memory works in a traditional PC before discussing the benefits and issues with using an IOMMU.

DMA (direct memory access) is a general term for architectures where devices can talk directly to RAM, without the CPU being involved. In PCs, the CPU is not even notified when DMA is in progress, although some chipsets do report a little information (i.e., bus mastering status bit or BM_STS). DMA was conceived to provide higher performance than the alternative, which is for the CPU to copy each byte of data from the device to memory (aka programmed IO). To write data to a hard drive controller via DMA, the driver running on the CPU writes the memory address of the data to the hardware and then goes on to doing other tasks. The drive controller finishes reading the data via DMA and generates an interrupt to notify the CPU that the write is complete.

DMA can actually be slower than programmed IO if the overhead in talking to the DMA controller to initiate the transaction takes longer than the transaction itself. This may be true for very short data. That’s why the original PC parallel port (LPT) doesn’t support DMA. When there are only 8 bits of data per transaction, it doesn’t make sense to spend time telling the hardware where to put the data, just read it yourself.

Behind this concept of DMA, common to nearly all modern architectures, the PC has a particular breakdown of responsibilities between the various chips. The CPU executes code and talks to the northbridge (Intel MCH). Integrated devices like USB and Ethernet are all located in the southbridge (Intel ICH), with the exception of on-board video, which is located in the northbridge. Between each of these chips is an Intel or AMD proprietary bus, which is why your Intel CPU won’t work with your AMD chipset, even if you were to rework the socket to fit it. Your RAM is accessed only via the northbridge (Intel) or via a bus shared with the northbridge (AMD).

Interfacing with the CPU is very simple. All complexities (privilege level, paging, task management, segmentation, MSRs) are handled completely internally. On the external bus shared with the northbridge, a CPU has a set of address and data lines and a few control/status lines. Besides power supply, the address and data pins are the most numerous. In the Intel quad-core spec, there are only about 60 types of pins. Only three pins (LINT[0:1], SMI#) are used to signal all interrupts, even on systems with dozens of devices.

Remember, these addresses are purely physical addresses as all virtual memory translation is internal to the CPU. There are two types of addresses known to the northbridge: memory and IO space. The latter are generated by the in/out asm instructions and merely result in a special value being written to the address lines on the next clock cycle after the address is sent. IO space addresses are typically used for device configuration or legacy devices.

The northbridge is relatively dumb compared to the CPU. It is like a traffic cop, directing the CPU’s accesses to devices or RAM. Likewise, when a device on the southbridge wants to access RAM via DMA, the northbridge merely routes the request to the correct location. It maintains a map, set during PCI configuration, which says something like “these address ranges go to the southbridge, these others go to the integrated video”.

With integrated peripherals, PCI is no longer a bus, it’s merely a protocol. There is no set of PCI bus lines within your southbridge that are hooked to the USB and Ethernet components of the chip. Instead, only PCI configuration remains in common with external devices on a PCI bus. PCI configuration is merely a set of IO port reads/writes to walk the logical device hierarchy, programming the northbridge with which regions it decodes to which device. It’s setting up the table for the traffic cop.

Next time, we’ll examine the advent of IOMMUs and DEVs/NoDMA tables.

July 27, 2007

Blackhat next week

Filed under: Misc,Rootkit,VM — Nate Lawson @ 5:00 am

I’m headed for the Blackhat conference next week. We’ll be giving our talk on why a 100% undetectable hypervisor is impossible

We’ll also be releasing our toolkit (“samsara”, an ongoing cycle of rebirth). This is the same code we will use for the Blue Pill challenge whenever Joanna and crew are ready. My hope is that it provides a nice implementation of the tests we’ll describe in our talk and a useful framework for other researchers to add new tests. We expect this will end the irrational fear of hypervisor rootkits and show attackers why spending their time developing one would be futile.

If you run into me, be sure to say hello.

July 2, 2007

Hypervisor rootkit detection strategies

Filed under: Hacking,Rootkit,Security,VM — Nate Lawson @ 5:24 pm

Keith Adams of VMware has a blog where he writes about his experiences virtualizing x86. In a well-written post, he discusses resource utilization techniques for detecting a hypervisor rootkit, including the TLB method described in his recent HotOS paper (alternate link).

We better find a way to derail Keith before he brainstorms any more of our techniques, although we have a reasonable claim that a co-author has published on TLB usage first. :-) Good thing side channels in an environment as complex as the x86 hardware interface are limitless!

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