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1453 lines
74 KiB
Text
1453 lines
74 KiB
Text
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---[ Phrack Magazine Volume 8, Issue 52 January 26, 1998, article 17 of 20
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-------------------------[ Protected mode programming and O/S development
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--------[ Mythrandir <jwthomp@cu-online.com>
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----[ Forward
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About two months ago I decided to begin learning about developing an operating
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system from the ground up. I have been involved in trusted operating systems
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development for over two years now but have always done my work with
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pre-existing operating systems. Mucking with this driver model, deciphering
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that streams implementation, loving this, hating that. I decided it was time
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to begin fresh and start really thinking about how to approach the design
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of one, so that I would be happy with every part. At least if I wasn't, I
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would only be calling myself names.
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This article is the first tentative step in my development of an operating
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system. What is here is not really much of a kernel yet. The big focus of
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this article will be getting a system up and running in protected mode with a
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very minimal kernel. I stress minimal. I have been asked repeatedly what my
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design goals for this operating system are. The fact is the operating system
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itself was the goal for this part. There was simply to much that I didn't
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know about this stage of the development to go on designing something. It
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would be like asking a kindergarten fingerpainter what her final masterpiece
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was going to look like.
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However, now that I have this phase reasonably done, it is time to begin
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thinking about such issues as: a security subsystem, a driver subsystem, as
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well as developing a real task manager and a real memory manager. Hopefully,
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by the next phrack I will be able to not only answer what I want for these
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topics but have also implemented many of them. This will leave me with a much
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more solid kernel that can be built upon.
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So, why write this article? There are several reasons. First, writing down
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what you have done always help solidify your thoughts and understanding.
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Second, having to write an article imposes a deadline on me which forces me to
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get the job done. Finally, and most importantly I hope to give out enough
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knowledge that others who are interested in the subject can begin to do some
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work in it.
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One comment on the name. JeffOS is not going to be the final name for this OS.
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In fact several names have been suggested. However, I have no idea yet what I
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want to call it, mostly because it just isn't solidified enough for a name.
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When its all said and done, I do hope I can come up with something better than
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JeffOS. For now, getting a real working kernel is more important than a real
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working name.
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I hope that you find the following information interesting, and worth
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investigating further.
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Cheers,
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Jeff Thompson
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AKA Mythrandir
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PS: Some words on the Cryptography article. First a thank you for all of the
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letters that I received on the article. I am happy to find that many people
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found the article interesting. For several people it rekindled an old interest
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which is always great to hear. However, for several people I have unfortunate
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news as well. The next article in the series will have to be postponed for
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a few issues until I complete this operating system. As is with many people,
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I have been caught by a new bug (The OS bug) and have set myself up to be
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committed to the work for some time. I am of course still interested in
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discussing the topic with others and look forward to more email on the subject.
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The winners of the decryption contest were:
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1st message:
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1st) Chaos at chaos@vector.nevtron.si
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2nd) Oxygen at oxygen@james.kalifornia.com
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Solution:
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The baron's army will attack at dawn. Ready the Templar knights and strike his
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castle while we hold him.
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2nd message:
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1st) Chaos
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Solution:
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MULTICAST PROTOCOLS HAVE BEEN DEVELOPED TO SUPPORT GROUP COMMUNICATIONS
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THESE PROTOCOLS USE A ONE TO MANY PARADIGM FOR TRANSMISSION TYPICALLY
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USING CLASS D INTERNET PROTOCOL ADDRESSES TO SPECIFY SPECIFIC MULTICAST GROUPS
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Also, there is one typo in my article. The book which was written without the
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letter 'e' was not The Great Gatsby, but rather Gadsby. Thanks to Andy
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Magnusson for pointing that out.
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Great job guys!
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----[ Acknowledgements
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I owe a certain debt to two people who have been available to me during my
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development work. Both have done quite a bit of work developing their own
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protected mode operating systems. I would like to thank Paul Swanson of the
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ACM@UIUC chapter for helping solve several bugs and for giving me general tips
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on issues I encountered. I would also like to thank Brian Swetland of
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Neoglyphics for giving me a glimpse of his operating system. He was also nice
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enough to allow me to steal some of his source code for my use. This source
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include the console io routines which saved me a great deal of time. Also,
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the i386 functions were given to me by Paul Swanson which has made a lot of
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the common protected mode instructions easily useable.
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Following new releases and information on this operating systems work, I am
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currently redoing my web site and will have it up by Feb 1, 1998. I will be
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including this entire article on that site along with all updates to the
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operating system as I work on it. One of the first things that I will be
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doing is rewriting all of the kernel. A large part of what is contained
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within these pages was a learning experience. Unfortunately, one consequence
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of trying to get this thing done was it becoming fairly messy and hackish. I
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would like to clean it up and begin to build upon it. Having a good code base
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will be invaluable to this. So please watch for the next, and future releases
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of this code and feel free to contact me with any feedback or questions. I
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will do my best to help. I won't be able to answer every question but I will
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certainly try. Also, please be patient as I have a very busy schedule outside
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of this project and am often times caught up by it.
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I can be reached at:
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jwthomp@cu-online.com
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and my web site is at:
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http://www.cu-online.com/~jwthomp/ (Up Feb 1, 1998)
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----[ Introduction
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Throughout this document I assume a certain level of knowledge on the part of
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the reader. This knowledge includes c and assembly language programming, and
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x86 architecture.
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The development requirements for the GuildOS operating system are:
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An ELF compiler
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I used the gnu ELF compiler which comes with linux. It is possible to use
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other ELF cross compilers on other systems as well.
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a386 assembler
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This can be obtained from:
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Eric Isaacson
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416 E. University Ave.
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Bloomington IN 47401-4739
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71333.3154@compuserve.com
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or call 1-812-335-1611
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A86+D86+A386+D386 is $80
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Printed manual $10
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This is a really nice assembler. Buy a copy. I did.
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It is also possible to convert the boot loader assembly code to another
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assembler.
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A 486+ machine
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You must have a machine to test the OS on.
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Great books to read to gain an understanding of the various topics presented
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in the following pages are:
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Protected Mode Software Architecture by Tom Shanley from MindShare, Inc.
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ISBN 0-201-55447-X $29.95 US
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This book covers the protected mode architecture of the x86. It also explains
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the differences between real mode and protected mode programming. This book
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contains much of the information which is in the Intel Operating Systems
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Developers guide, but also explains things much more in depth.
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Developing Your Own 32-Bit Operating System by Richard A. Burgess from SAMS
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Publishing. ISBN 0-672-30655-7
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This book covers the development of a complete 32-bit OS. The author also
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creates his own 32-bit assembler and compiler. Considerable portions of the
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code are written in asm, but there is still quite a bit in C.
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The entire Intel architecture series and their OS developers guides which are
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available from their web site for free.
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----[ Chapter 1 - Booting into protected mode
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The first step in setting up an operating system on the x86 architecture is to
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switch the machine into protected mode. Protected mode allows you to use
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hardware protection schemes to provide operating system level security.
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The first component which I began working on was the first stage boot loader
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which is located in "JeffOS/loader/first/".
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The first stage boot loader is placed on the first sector of the floppy. Each
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sector is 512 bytes. This is not a lot of room to write all of the code
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required to boot into protected mode the way I would like to so I had to break
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the boot loader into two parts. Thus the first and second stage floppy loader.
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After the Power On Self-Test (POST) test this first sector is loaded up into
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memory location 0000:7C00. I designed the first stage of the floppy boot
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loader to load up all of the files into memory to be executed. The first
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instruction in the boot loader jumps to the boot code. However, between the
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jump and the boot code are some data structures.
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The first section is the disk parameters. I'm not currently using any of this
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information but will in future versions. The next set of structures contain
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information on the other data files on the floppy disk. Each structure looks
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like this in assembly:
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APCX DW 0000h ; Specifies CX value for INT 13h BIOS routine
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APDX DW 0000h ; DX
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APES DW 0000h ; ES
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APBX DW 0000h ; BX
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APSZ DB 0h ; Specifies number of sectors to read in
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APSZ2 DB 0h ; Unused
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There are four copies of this structure (APxx, BPxx, CPxx, DPxx).
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The INT 13h BIOS call has the following arguments:
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ch: Cylinder number to start reading from.
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cl: Sector number to start at.
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dh: Head number of drive to read from (00h or 01h for 1.44M floppy disk drives)
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dl: Drive number (00h for Disk A)
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es: Segment to store the read in sectors at.
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bx: Offset into the segment to read the sectors into.
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ah: Number of sectors to read in.
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al: Function number for INT 13h. (02h is to read in from the disk)
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I use the APxx to load the second stage boot loader. BPxx is being used
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to load the first stage kernel loader. CPxx is used to load a simple user
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program. Finally, DPxx is used to load the kernel in.
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Following the loader structures are two unused bytes which are used to store
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temporary data. SIZE is used but SIZE2 is not currently used.
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The boot code follows these structures. This boot code relocates itself into
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another section of memory (9000:0000 or 90000h linear). Once relocated, it
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loads all of the files into memory and then jumps into the beginning of the
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second stage boot loader.
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The first part of the second stage boot loader contains a macro which is used
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to easily define a Global Descriptor Table (GDT) entry. In protected mode the
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GDT is used to store information on selectors. A selector in protected mode
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is referred to by a number stored in any of the segment registers. A selector
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has the following format:
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Bits Use
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15 - 3 Descriptor Table Index
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2 Table Indicator
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1 - 0 The Requestor Privilege Level
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The Descriptor Table Index or (DT) is an index into the GDT. The first entry
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in the GDT is 00h, the second is 08h, then 10h, etc.. The reason that the
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entries progress in this manner is because the 3 least significant bits are
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used for other information. So to find the index into the GDT you do a
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segment & 0xfff8 (DT = Selector & 0xfff8).
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The Table Indicator selects whether you are using a GDT or a Local Descriptor
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Table (LDT). I have not yet had a reason to use LDT's so I will leave this
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information to your own research for now.
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Finally, the Requestor Privilege Level is used to tell the processor what
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level of access you would like to have to the selector.
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0 = OS
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1 = OS (but less privileged than 0)
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2 = OS (but less privileged than 1)
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3 = User level
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Typically levels 0 and 3 are the only ones used in modern operating systems.
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The GDT entries which describe various types of segments have the following
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form:
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63 - 56 Upper Byte of Base Address
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55 Granularity Bit
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54 Default Bit
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53 0
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52 Available for Use (free bit)
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51 - 48 Upper Digit of Limit
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47 Segment Present Bit
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46 - 45 Descriptor Privilege Level
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44 System Bit
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43 Data/Code Bit
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42 Conforming Bit
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41 Readable bit
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40 Accessed bit
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39 - 32 Third Byte of Base Address
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31 - 24 Second Byte of Base Address
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23 - 16 First Byte of Base Address
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15 - 8 Second Byte of Limit
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7 - 0 First Byte of Limit
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The base address is the starting location of the segment descriptor (for code
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or data segments). The limit is the number of bytes or 4k pages. Whether it
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is bytes or 4k pages depends on the setting of the granularity but. If the
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granularity bit is set to 0 then the limit specifies the length in bytes. If
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it is set to 1 then the limit specifies the length of the segment in 4k pages.
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The default bit specifies whether the code segment is 32bit or 16bit. If it is
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set to 0 then it is 16bit. If it is set to 1 then it is 32bit.
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The present bit is set to one if the segment is currently in memory. This is
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used for virtual paging.
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The descriptor privilege level is similar to the RPL. The DPL simply states at
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what protection level the segment exists at. The values are the same as for
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the RPL.
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The system bit is used to specify whether the segment contains a system segment.
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It is set to 0 if it is a system(OS) segment.
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The data/code bit is used to specify whether the segment is to be used as a
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code segment or as a data segment. A code segment is used to execute code
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from and is not writable. A data segment is used for stacks and program
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data. It's format is slightly different from the code segment depicted above.
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The readable bit is used to specify whether information can be read from the
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segment or whether it is execute only.
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The next part of the second stage floppy boot loader contains the code which
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is used to enable the A20 address line. This address line allows you to
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access beyond the 1MB limit that was imposed on normal DOS real mode
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operation. For a discussion of this address line I recommend looking at the
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Intel architecture books.
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Once enabled the GDT that exists as data at the end of the assembly file is
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loaded into the GDT register. This must be done before the switch into
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protected mode. Other wise any memory accesses will not have a valid selector
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described for them and will cause a fault (I learned this from experience).
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Once this is completed the move is made to protected mode by setting the
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protected mode bit in the CR0 register to 1.
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Following the code which enables protected mode, there is data which represents
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a far call into the next portion of the second stage boot loader. This causes
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a new selector to be used for CS as opposed to an undefined one.
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The code that is jumped into simply sets up the various selectors for the data
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segments.
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There is then some simple debugging code which prints to the screen. This was
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used for myself and can be removed.
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The stack segment is then set up along with the stack pointer. I placed the
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stack at 90000h.
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|
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Finally I push the value for the stack onto the stack (to be retrieved by the
|
||
|
|
kernel) and then call linear address 100080h which contains the first stage
|
||
|
|
loader for the kernel.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Chapter 2 - The first stage kernel boot loader
|
||
|
|
|
||
|
|
|
||
|
|
The first stage kernel boot loader is located in \boot.
|
||
|
|
|
||
|
|
First some notes on what is happening with the first stage boot loader. The
|
||
|
|
boot loader is compiled to ELF at a set TEXT address so that I can jump into
|
||
|
|
the code and have it execute for me. In the makefile I specify the text
|
||
|
|
address to be 10080. The first 80h bytes are used as the ELF header. I
|
||
|
|
completely ignore this information and jump directly into linear memory
|
||
|
|
address 10080h. It is my understanding that newer versions of the ELF compiler
|
||
|
|
have a slightly different header length and may cause this number to need to be
|
||
|
|
modified. This can be determined by using a dissasembler (i.e. DEBUG in DOS)
|
||
|
|
to determine where the text segment is beginning.
|
||
|
|
|
||
|
|
The two files of importance to the boot loader are main.c and mem.c.
|
||
|
|
|
||
|
|
main.c contains the function `void _start(unsigned long blh);`. This function
|
||
|
|
must be the first function linked in. So main.c must be the first file which
|
||
|
|
is linked and _start() must be the first function in it. This guarantees that
|
||
|
|
start will be at 10080h. The parameter blh is the value which was pushed in
|
||
|
|
by the second stage boot loader. This originally had meaning, but no longer
|
||
|
|
does.
|
||
|
|
|
||
|
|
The first thing that _start does is to call kinit_MemMgmt which is the
|
||
|
|
initialization routine for memory.
|
||
|
|
|
||
|
|
The first thing that kinit_MemMgmt does is set nMemMax to 0xfffff. This is
|
||
|
|
the maximum number of bytes on the system. This value is 1MB. kinit_MemMgmt
|
||
|
|
then calls kmemcount which attempts to calculate the amount of free memory on
|
||
|
|
the system. Currently this routine does not work properly and assumes that
|
||
|
|
there is 2MB of free memory on the system. This is sufficient for now but
|
||
|
|
needs to be fixed in the future.
|
||
|
|
|
||
|
|
kinit_MemMgmt then calls kinit_page which sets of the page tables for the
|
||
|
|
kernel.
|
||
|
|
|
||
|
|
Paging is the mechanism used to define what memory a task is able to access.
|
||
|
|
This is done by creating a "virtual" memory space which the task accesses.
|
||
|
|
Whenever an access to memory occurs the processor looks into the page tables
|
||
|
|
to determine what "real" physical memory is pointed to by this memory location.
|
||
|
|
For example, the kernel could designate that each task will get 32k (8 pages)
|
||
|
|
of memory to use for the stack. Without using paged memory each of these
|
||
|
|
memory locations would occur at a different address. However, by using paging
|
||
|
|
you can map each of these physical memory allocations to a paged address
|
||
|
|
which allows each of these allocations to appear to occur at the same location.
|
||
|
|
|
||
|
|
The page tables are broken up in the following manner. First is the page
|
||
|
|
directory. It is composed of 1024 entries which have the following properties:
|
||
|
|
|
||
|
|
31 - 12 Page Table Base Address
|
||
|
|
11 - 9 Unused (Free bits)
|
||
|
|
8 0
|
||
|
|
7 Page Size Bit
|
||
|
|
6 0
|
||
|
|
5 Accessed Bit
|
||
|
|
4 Page Cache Disable Bit
|
||
|
|
3 Page Write Through Bit
|
||
|
|
2 User/Supervisor Bit
|
||
|
|
1 Read/Write Bit
|
||
|
|
0 Page Present Bit
|
||
|
|
|
||
|
|
The Page Table Base address is an index to the page table which contains
|
||
|
|
information about this memory location. When a memory location is accessed
|
||
|
|
the most significant 10 bits are used to reference one of the 1024 entries in
|
||
|
|
the page directory. This entry will point to a page table which has a physical
|
||
|
|
memory address equal to the Page Table Base Address. This table is then
|
||
|
|
referenced to one of its 1024 entries by the 21 - 12 bits of the memory
|
||
|
|
address.
|
||
|
|
|
||
|
|
The Page Size Bit tells whether each page is equal to (Bit = 0) 4kb or
|
||
|
|
(Bit = 1) 4MB.
|
||
|
|
|
||
|
|
The accessed bit is used to show whether the page has ever been accessed. Once
|
||
|
|
set to 1, the OS must reset it to 0. This is used for virtual paging.
|
||
|
|
|
||
|
|
The Page Cache Disable Bit and Page Write Bit are not currently used by me, so
|
||
|
|
I will leave its definition as an exercise to the reader (enjoy).
|
||
|
|
|
||
|
|
The User/Supervisor Bit specifies whether access to the page table is
|
||
|
|
restricted to access by tasks with privilege level 0,1,2 or 3. If the bit is
|
||
|
|
set to 0 then only tasks with level 0, 1, or 2 can access this page table. If
|
||
|
|
the bit is set to 1, then tasks with level 0, 1, 2, or 3 can access this page
|
||
|
|
table.
|
||
|
|
|
||
|
|
The Read/Write bit is used to specify whether a user level task can write to
|
||
|
|
this page table. If it is set to 0 then it is read only to "User" tasks. If
|
||
|
|
it is set to 1 then it is read/writable by all tasks.
|
||
|
|
|
||
|
|
Finally, the Present Bit is used to specify whether the page table is present
|
||
|
|
in memory. If this is set to 1 then it is.
|
||
|
|
|
||
|
|
|
||
|
|
Once the page directory is referenced, the offset into the page table is
|
||
|
|
selected. Using the next 10 bits of the memory reference. Each page table
|
||
|
|
has 1024 entries with each entry having the following structure:
|
||
|
|
|
||
|
|
31 - 12 Page Base Address
|
||
|
|
11 - 9 Unused (Free bits)
|
||
|
|
8 - 7 0
|
||
|
|
6 Dirty Bit
|
||
|
|
5 Accessed Bit
|
||
|
|
4 Page Cache Disable Bit
|
||
|
|
3 Page Write Through Bit
|
||
|
|
2 User/Supervisor Bit
|
||
|
|
1 Read/Write Bit
|
||
|
|
0 Page Present Bit
|
||
|
|
|
||
|
|
The Page Base Address points to the upper 20 bits in physical memory where
|
||
|
|
the memory access points to. The lower 12 bits are taken from the original
|
||
|
|
linear memory access.
|
||
|
|
|
||
|
|
The Dirty, Accessed, Page Cache, and Page Write Through Bits are all used for
|
||
|
|
virtual memory and other areas which I have not yet been concerned yet. So
|
||
|
|
they are relegated to the reader (for now).
|
||
|
|
|
||
|
|
The remaining three bits behave just as in the page directory except that
|
||
|
|
they apply to the physical memory page as opposed to a page table. All
|
||
|
|
kernel pages are set to have Supervisor, Read/Write, and Page Present bits
|
||
|
|
set. User pages do not have the supervisor bits set.
|
||
|
|
|
||
|
|
The code in kinit_page creates the page directory in the first of the three
|
||
|
|
physical pages that it set aside. The next page is used to create a low (user)
|
||
|
|
memory area of 4MB (One page table of 1024 entries points to 1024 4kb pages,
|
||
|
|
Thus 4MB). The third page is used to point to high (OS) memory.
|
||
|
|
|
||
|
|
The kinit_page function sets all of the low page memory equal to physical
|
||
|
|
memory. This means that there is a one to one correlation for the first 4MB
|
||
|
|
of memory to paged memory. kinit_page then maps in ten pages starting at
|
||
|
|
70000h linear into 0x80000000. Entry number 0 of the page directory is then
|
||
|
|
set to point to the low page table. Entry number 512 is set to point to the
|
||
|
|
high page table.
|
||
|
|
|
||
|
|
Finally the kinit_page function places the address of the page directory
|
||
|
|
into the cr3 register. This tells the processor where to look for the page
|
||
|
|
tables. Finally, cr0 has its paging bit turned on which informs the processor
|
||
|
|
that memory accesses should go through the page table rather than just being
|
||
|
|
direct physical memory accesses.
|
||
|
|
|
||
|
|
After this the _start function is returned into and k_start() has been set to
|
||
|
|
0x80000080 which points to the _start() function in the main kernel.
|
||
|
|
_start in the boot code calls this function which starts the real kernel off.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Chapter 3 - The Kernel
|
||
|
|
|
||
|
|
|
||
|
|
The kernel is where all of the fun begins. Unfortunately, this is the place
|
||
|
|
that needs the most work. However, there is enough here to demonstrate the
|
||
|
|
beginnings of what needs to be done to build a viable kernel for your own work.
|
||
|
|
|
||
|
|
The kernel boot loader created the kernel page table and then jumped into the
|
||
|
|
kernel at _start(); _start() then sets up the console, clears it, and displays
|
||
|
|
the message "Main kernel loaded.". Once this is done it runs the memory
|
||
|
|
manager initialization routine 'kinit_page()'.
|
||
|
|
|
||
|
|
The memory manager initialization routine begins by initializing a structure
|
||
|
|
called the PMAT. The PMAT is a giant bit field (2048 bytes), where each bit
|
||
|
|
represents one page of physical memory. If a bit is set to 1, the
|
||
|
|
corresponding page of memory is considered allocated. If the bit is set to 0
|
||
|
|
then it is considered unallocated. Once this array is initialized the memory
|
||
|
|
management code sets aside the chunks of physical memory which are already in
|
||
|
|
use. This include the system BUS memory areas, as well as the location of the
|
||
|
|
kernel itself in physical memory. Once this is completed the memory manager
|
||
|
|
returns to the _start() function so that it can proceed with kernel
|
||
|
|
initialization.
|
||
|
|
|
||
|
|
The _start() function then calls a temporary function which I am using now to
|
||
|
|
allocate memory which is use by the user program loading in by the first
|
||
|
|
stage floppy loader. This will go away after I add the loading of processes
|
||
|
|
off of disk during run time. This function sets aside the physical memory
|
||
|
|
which is located at 20000h linear.
|
||
|
|
|
||
|
|
Now that the basic memory system is set up the _start() function calls the
|
||
|
|
kinit_task() function. kinit_task() sets up the kernel task so that it can
|
||
|
|
run as a task rather than as a the only process on the system.
|
||
|
|
|
||
|
|
kinit_task() is really a shell function which calls two other functions:
|
||
|
|
kinit_gdt() and kinit_ktask(); kinit_gdt() initializes a new kernel GDT which
|
||
|
|
is to be used by the kernel rather than the previous temporary one which was
|
||
|
|
set up by the second stage floppy boot loader. Once the new location for the
|
||
|
|
gdt is mapped into memory several selectors are added to it. Kernel Code and
|
||
|
|
Data selectors are added. Also, User Code and Data selectors are added. Once
|
||
|
|
these selectors are put into place, the new gdt is placed in the gdt register
|
||
|
|
on the processor so that it can be used.
|
||
|
|
|
||
|
|
kinit_task() now calls the kinit_ktask() function. This task creates a task
|
||
|
|
which the kernel code will be executed as. The first thing this function does
|
||
|
|
is to clear out the kernels task list. This list contains a list of tasks
|
||
|
|
on the system. Next a 4k page is allocated for the kernel task segment. The
|
||
|
|
current executing task is then set to the kernel task. Next the task segment
|
||
|
|
is added to the GDT. This task segment has the following structure and is
|
||
|
|
filled out for the kernel with the following values by me. In fact all tasks
|
||
|
|
will start out with these settings.
|
||
|
|
|
||
|
|
|
||
|
|
struct TSS {
|
||
|
|
ushort link; // set to 0
|
||
|
|
ushort unused0;
|
||
|
|
ulong esp0; // set to the end of the task segment page
|
||
|
|
ushort ss0; // set to SEL_KDATA (Kernel Data segment)
|
||
|
|
ushort unused1;
|
||
|
|
ulong esp1; // set to 0
|
||
|
|
ushort ss1; // set to 0
|
||
|
|
ushort unused2;
|
||
|
|
ulong esp2; // set to 0
|
||
|
|
ushort ss2; // set to 0
|
||
|
|
ushort unused3;
|
||
|
|
ulong cr3; // set to the physical address of this tasks page
|
||
|
|
// tables
|
||
|
|
ulong eip; // set to the entry point to this tasks code
|
||
|
|
ulong eflags; // set to 0x4202
|
||
|
|
ulong eax, ecx, edx, ebx, esp, ebp, esi, edi; // set to garbage values
|
||
|
|
ushort es; // set to SEL_KDATA (Kernel data segment)
|
||
|
|
ushort unused4;
|
||
|
|
ushort cs; // set to SEL_KCODE (Kernel code segment)
|
||
|
|
ushort unused5;
|
||
|
|
ushort ss; // set to SEL_KDATA
|
||
|
|
ushort unused6;
|
||
|
|
ushort ds; // set to SEL_KDATA
|
||
|
|
ushort unused7;
|
||
|
|
ushort fs; // set to SEL_KDATA
|
||
|
|
ushort unused8;
|
||
|
|
ushort gs; // set to SEL_KDATA
|
||
|
|
ushort unused9;
|
||
|
|
ushort ldt; // set to 0
|
||
|
|
ushort unused10;
|
||
|
|
ushort debugtrap; // set to 0
|
||
|
|
ushort iomapbase; // set to 0
|
||
|
|
};
|
||
|
|
|
||
|
|
|
||
|
|
The link field is used by the processor when an interrupt is called. The
|
||
|
|
processor places a pointer to the task segment which was running prior to the
|
||
|
|
interrupt. This is useful for determining access rights based on the calling
|
||
|
|
process.
|
||
|
|
|
||
|
|
The espx and ssx parameters are used to store a pointer to a stack which will
|
||
|
|
be used when a task with a lower privilege level tries to access a high level
|
||
|
|
privilege area.
|
||
|
|
|
||
|
|
The cr3 parameter is used to store a pointer to the physical address of this
|
||
|
|
tasks page table. Whenever this task is switched to, the processor will load
|
||
|
|
the value stored in cr3 into the cr3 register. This means that each task can
|
||
|
|
have a unique set of page tables and mappings.
|
||
|
|
|
||
|
|
The eax, ebx, etc.. registers are all set to a garbage value as they are
|
||
|
|
uninitialized and will only gain values once they are used. When the processor
|
||
|
|
switches to this task these parameters will be loaded into their respective
|
||
|
|
processor registers.
|
||
|
|
|
||
|
|
The cs, es, ss, ds, fs, and gs parameters are all set to meaningful values
|
||
|
|
which will be loaded into their respective processor registers when this
|
||
|
|
task is switched to.
|
||
|
|
|
||
|
|
As I am not using a local descriptor I set this parameter to 0 along with the
|
||
|
|
debugtrap and iomapbase parameters.
|
||
|
|
|
||
|
|
As I have mentioned every time a task is switched to the processor will load
|
||
|
|
all of the parameters from the task segment into their respective registers.
|
||
|
|
Likewise, when a task is switched out of, all of the registers will be stored
|
||
|
|
in their respective parameters. This allows tasks to be suspended and to
|
||
|
|
restart with the state they left off at.
|
||
|
|
|
||
|
|
Switching tasks will be discussed later when the point in the kernel where this
|
||
|
|
takes place at is reached.
|
||
|
|
|
||
|
|
Once this task state segment is created it is necessary to create an entry in
|
||
|
|
the GDT which points to this task segment. The format of this 64 bit entry is
|
||
|
|
as follows:
|
||
|
|
|
||
|
|
63 - 56 Fourth Byte of Base Address
|
||
|
|
55 Granularity Bit
|
||
|
|
54 - 53 0
|
||
|
|
52 Available for use (free bit)
|
||
|
|
51 - 48 Upper Nibble of Size
|
||
|
|
47 Present in Memory Bit
|
||
|
|
46 - 45 Descriptor Privilege Level
|
||
|
|
44 System Built
|
||
|
|
43 16/32 Bit
|
||
|
|
42 0
|
||
|
|
41 Busy Bit
|
||
|
|
40 1
|
||
|
|
39 - 32 Third Byte of Base Address
|
||
|
|
31 - 24 Second Byte of Base Address
|
||
|
|
23 - 16 First Byte of Base Address
|
||
|
|
15 - 8 Second Byte of Segment Size
|
||
|
|
7 - 0 First Byte of Segment Size
|
||
|
|
|
||
|
|
As you have probably noticed, this structure is very similar to the code
|
||
|
|
segment descriptor. The differences are the 16/32 bit, and the Busy Bit.
|
||
|
|
|
||
|
|
The 16/32 Bit specifies whether the task state segment is 16 bit or 32 bit.
|
||
|
|
We will only be using the 32 Bit task segment (Bit = 1). The 16 bit task state
|
||
|
|
segment was used for the 286 and was replaced by a 32 bit task state segment on
|
||
|
|
the 386+ processors.
|
||
|
|
|
||
|
|
The busy bit specifies whether the task is currently busy.
|
||
|
|
|
||
|
|
Once the kernel task is allocated, a new kernel stack is allocated and made
|
||
|
|
active. This allows the stack to be in a known and mapped in location which
|
||
|
|
uses the memory manager of the kernel.
|
||
|
|
|
||
|
|
The user tasks is then created in a similar fashion as the kernel task. In
|
||
|
|
this current implementation the user task is located at 0x20000. Its stack
|
||
|
|
is located at 0x2107c. Currently, this user task operates with OS level
|
||
|
|
privilege. I encountered some problems when changing its selectors to user
|
||
|
|
entries in the GDT. As soon as I fix this problem I will post a fix on my web
|
||
|
|
site. After the user task is created it is added to the task queue to be
|
||
|
|
switched to once the scheduler starts.
|
||
|
|
|
||
|
|
Now that the kernel task and a user task (though running with kernel privilege
|
||
|
|
level) have been created it is necessary to set up the interrupt tables. This
|
||
|
|
is done by a call to the kinit_idt() function.
|
||
|
|
|
||
|
|
kinit_idt() starts by setting all of the interrupts to point to a null
|
||
|
|
interrupt function. This means that for most interrupts a simple return
|
||
|
|
occurs. However, interrupt handlers for the timer as well as for one system
|
||
|
|
call. Also, interrupts are set up to handle the various exceptions. Once
|
||
|
|
this table is filled out the interrupt descriptor table (IDT) is loaded into
|
||
|
|
the idt register. The interrupts are then enabled to allow them to be called.
|
||
|
|
|
||
|
|
The timer interrupt handler is a simple function which calls a task switch
|
||
|
|
every time the hardware timer fires.
|
||
|
|
|
||
|
|
The system call (interrupt 22h) is called, the handler will print out on the
|
||
|
|
console the string which is pointed to be the eax register.
|
||
|
|
|
||
|
|
The exception handling routine will dump the task registers and then hang the
|
||
|
|
system. The jump.S file in JeffOS/kernel/ contains the assembly wrappers which
|
||
|
|
are called when an interrupt occurs. These wrapper functions then call the C
|
||
|
|
handler functions.
|
||
|
|
|
||
|
|
Now that the IDT is set up and interrupts are occurring task switches can occur.
|
||
|
|
These occur when the swtch() function is called in the task.c file. The
|
||
|
|
swtch() function locates the next task in its queue and does a call to the
|
||
|
|
selector address of the new task. This causes the processor to look up the
|
||
|
|
selector and switch to the new task.
|
||
|
|
|
||
|
|
You now have a very simple multi-tasking kernel.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Chapter 4 - User level libraries
|
||
|
|
|
||
|
|
|
||
|
|
The user level libraries are fairly simplistic.
|
||
|
|
|
||
|
|
There are two files in this directory. The first is the crt0.c file.
|
||
|
|
This file contains one function which is the _start() function. This function
|
||
|
|
makes a call to main which will be defined in user code. This stub function
|
||
|
|
must always be linked in first as it will be jumped into by the kernel to
|
||
|
|
begin running the process.
|
||
|
|
|
||
|
|
The second file is the syscall.c file. This file contains one system call
|
||
|
|
function which is simply an interrupt 22. This interrupt calls the console
|
||
|
|
system call. eax is passed in as a pointer to a string which is printed to
|
||
|
|
the system console.
|
||
|
|
|
||
|
|
Both of these source files are compiled to objects and are used during the
|
||
|
|
linking phase of any user code.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Chapter 5 - User code
|
||
|
|
|
||
|
|
|
||
|
|
The user code is stored in one file called test.c. This file is located in
|
||
|
|
the /user/ directory. All this code does is call the console system call
|
||
|
|
function provided by the library, wait a short amount of time, and call it
|
||
|
|
again in a non-terminating loop (good thing, as I don't handle task
|
||
|
|
termination yet).
|
||
|
|
|
||
|
|
The important thing to note is that when linking this user process is set to
|
||
|
|
have a text segment of 20000h linear. Also the crt0.o and syscall.o files are
|
||
|
|
linked in as well. crt0.o is linked in first to insure that its _start()
|
||
|
|
function is at 20080h so it will be jumped into by the kernel. In truth,
|
||
|
|
_start() is the real main as opposed to the main() everyone is used to dealing
|
||
|
|
with.
|
||
|
|
|
||
|
|
This code is the task which is created and run alongside the kernel, as
|
||
|
|
described in chapter 3.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Chapter 6 - Creating a disk image out of the binaries
|
||
|
|
|
||
|
|
|
||
|
|
Once you have compiled all of the binaries and placed them into the build
|
||
|
|
directory you will need to create two more files before continuing. These
|
||
|
|
files are called STUFF.BIN and STUFF2.BIN. These files are simply containers
|
||
|
|
of empty space to cause alignment of other binaries. The floppy loader
|
||
|
|
expects the user program to be 1k in size. If the user program is not exactly
|
||
|
|
this size then STUFF2.BIN needs to be created and be of such a size that when
|
||
|
|
added to USER.BIN the size is 1024 bytes. Also, the floppy boot loader
|
||
|
|
expects the kernel boot loader to be 3.5k (3584 bytes) in size. STUFF.BIN
|
||
|
|
needs to be made of such length that when added to the size of the BOOT.BIN
|
||
|
|
(kernel boot loader) file the size will be 3584 bytes. In the future I will
|
||
|
|
try to automate this process, but for now this is simply how it must be done.
|
||
|
|
Once this is complete the shell program 'go' must be run. This will place all
|
||
|
|
of the binary files into one file called 'os.bin'. This file can then be
|
||
|
|
written to disk by one of the following two methods.
|
||
|
|
|
||
|
|
If you want to do it from linux you can do the following command:
|
||
|
|
|
||
|
|
dd if=os.bin of=/dev/fd0 (places os.bin directly onto the floppy disk)
|
||
|
|
|
||
|
|
or from DOS you can obtain the rawrite command and run it and follow its
|
||
|
|
directions.
|
||
|
|
|
||
|
|
|
||
|
|
----[ Conclusion
|
||
|
|
|
||
|
|
|
||
|
|
The kernel contained within is far from complete. However, it is a first step
|
||
|
|
towards creating a real protected mode operating system. It is also enough to
|
||
|
|
begin working with, or to refer to during you own work on a protected mode
|
||
|
|
operating system. Doing this work is simply both one of the most rewarding
|
||
|
|
things you will ever do, and one of the most frustrating. Many a night has
|
||
|
|
been spent at the local tavern telling war stories about this stuff. But in
|
||
|
|
the end, it has all been great fun.
|
||
|
|
|
||
|
|
I wish you all the best of luck!
|
||
|
|
|
||
|
|
Jeff Thompson
|
||
|
|
jwthomp@cu-online.com
|
||
|
|
http://www.cu-online.com/~jwthomp/
|
||
|
|
|
||
|
|
<++> JeffOS.tgz.uue
|
||
|
|
begin 600 JeffOS.tgz
|
||
|
|
M'XL(`(-CQC0``^P\:W?:R)+Y"N?D/_3!<]=@$R(!Q@Y,<@\&G#CKUQKG9C(W
|
||
|
|
M<WP$:D"QD%BU,'AF\]^WJKI;+^-'LH[WSAUW'JA?]>[J:G7!>SX:'?=?/ON1
|
||
|
|
MA=6-;<-@SQB6[*>JL$:]8<+?K;K)F&F86^8SMO5#J5)E+D(K8.Q9X/OA;>/N
|
||
|
|
MZO^3EO=2_ZYOV3SX06:P0O]FO;Y"_U5CJV;6H==LU(U_,?W/!0_$8Q#TN"6M
|
||
|
|
M?\&'OF<_M!E\N_YKIEE[TO]CE)7ZEQ\52TP?!(=I&(U;]%_;WM[*Z'^K:H#^
|
||
|
|
MC0?!?D?YB^N_S\==+H;LL-TY/7Z>S]D+5ERKL?91EQE[4$JZK9II&[`U4S=-
|
||
|
|
M5$-=?6ZQXU.VUHB&]=^=LIWG^;7>X?/\\SQ(TH2^X].WS)A@PRZ(OHD/N:E_
|
||
|
|
MR0;+,MN>J(HU*8.MZ(I;9NOM=:@Y7@A!PB2:8\&<H5`56Y2A056XJCS/MZM&
|
||
|
|
MV[8#+@3@0KMKL3X/&30SU<Y<Q^-LP@..XW%(YV`?X'3:!P>,>];`Y3!:]O3/
|
||
|
|
ML.?]X0GK^%[H>'.8$PU1"+`,+=>-Y_IFW//%^YV)B1^$<;?M>SP>H%@V;',2
|
||
|
|
M-_KS$);*I&RY#XMCE,5A2!P)L,WT-#Y<EJL&E$EJE)L8]F4Z4^A_VJS&S8Z'
|
||
|
|
M.(&+N"GD(L3&Q"C7]V=`?A)T`A&RD<`4\!#4@6I[GM<*:=[/H'8S!A6;QEO7
|
||
|
|
M'U@NP_41.+/0#]@98B<+*;-PX@@V!??!!IPA.>SD=!_L/O392>"'[-"W(SLZ
|
||
|
|
M>-L](WOJ-_\)C[^E\>!P/@RY37.4`4(OL(+V)X<>'O^#..VU?RFSSJDR0\`7
|
||
|
|
MMYKID3"HC!VR%4T5"VF"5F8N9S0:(`Z#6[2`%[F</QH)(&@&!$%[0S<;.R09
|
||
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||
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||
|
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M'(H4A^B*7M&R8"]8/>)[5L8N::"YV5Q,9#4I,6.'A"97LY0%N$]C8!-)8#8N
|
||
|
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M]QC_[SEK;.Q0'1VS,8)">K)AS1JO7DF=,8,0:>]N@"40364YH0S83#AE&<L!
|
||
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||
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M]1O0[B2PTMR[\&*Y1K+5Z=\UZ3J?5O=[)O7[J,Y#,3Z`.(V6<7>7&5WL;L-_
|
||
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MZ]CL>.-UA$;6@ILK%G.O!_6^,_:L<!YPG/@18K!V>PO7S[,;XK^ARRVO,K`>
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||
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MZ,![1_S'V%8M$__5MZO5I_CO,8K-7;91\0=?P-G`HXK\!XZ7JHNK*5G+4_EW
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||
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||
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M^D/+\01$MYQ90O#IP,56"$M'$/]BJ[01#(S&T.CZL]D5&X#P\M*&*HSM>\P/
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||
|
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MX!%#882!,;,#`>65/Y<!LS]`)!)';:>A$<$,#R)A.P]]$)`'/EH@TP.#T(%]
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||
|
|
M*4$KT#/U;6=T1?U$HT*(L-C<`Q+R%D"$@#I&4<GG]T=$B@7[X5S`MLG:2(1P
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||
|
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MIC/@-;R:<;9.9,6O0=8KC`2U<"`V@Z/BW"6Z+#9R7)['B`V"]Y$3B!!=)UM,
|
||
|
|
MG.%$#E8"3<H3AL(@*[BJL+:0N`&TQ;K'?98?6`+Z(=(>!]94GC$6?G`A@7D<
|
||
|
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M^H!'?>``N#@)!/'1\6Q_(9!,+CB1):G-)^8,`G\^GH#X+Z5ND"8X\LZ7"$&*
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||
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M:>`OH=D*,P("W>>'_G3FN%;H^*#>$4V^X(''79#HZ=SS<-Q@[K@V!@Z:^=E5
|
||
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MPF9(-D@::E>BIPD)G2[P\)-'Y$/+8T-P1!"C6S!`7#!GBA8G65D$3AA".(P*
|
||
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MUT:(@Q*T1$&,UAJ$V@`+@^ME&%@>]^=""6H4^%,B)R:$+X=\%N:UT4O=@B5(
|
||
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M^BU8`$2^%8*B"4CES[D_KO3_D1H?!L>=\5\M^_ZOOEW;?O+_CU%HB2:69Z7R
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M&?Z2`3Q%?'^!DE[_Y.8>_!;PV^Y_P!>8U>WMI_N_1RFK]/_`Q_^[_7]]*Z/_
|
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M.HQ_\O^/43+G_XWXZ"]#GJ>3_[]W6;7^HV#W@7#<OO[-:@,JF?6_77^*_QZE
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MR(N.,VO0#_T9'J?J*Z]H]0T27M7*VM'QB>YXQP/+M>/=O+O+V/I;#"&/^^:Z
|
||
|
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M'./M7H5<G/"@#P<L_1JZ2F^KJ1N;H;?CBC!0(`Q][^F=BDM;S6-ZKA%W[[7/
|
||
|
|
M^BR-WJCJJ4!PUPEZ7BCBJ;T([9D?6FZ?SGQ"=^_6=??@D-N.E8&\EZ49T"?)
|
||
|
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M>I7I/@OP!DEWFU7=_8Y;MDC`EK/C;L>VX8`;=7>IVU`7KFGB:]4;A@Q07]W`
|
||
|
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MN>0)!G3G*0>QHEK8BL[>,L2Y?6<<=U8CUH[[L<PT[68]!?BC'VB34*SI[G_X
|
||
|
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MKF=--59E+J?[G7>JKBQFSPK/\%U,:AC(VJS*,<_SN?9)YY<<0">YY5KR'8TC
|
||
|
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M7UYE+E4/R,'12ZPK?QZPXS[-[^KY!L[?9Q,+1"7FLYGKX&L3@%=A$BSWPN`*
|
||
|
|
M;[/G>#*"J;T^3FVHJ>!%U*L.9$VA8<6&O`D\<#QN!26:MYM">2QO7`'!!P]6
|
||
|
|
MG03=_S4'W*)]4Z6*-7FAMQMS7(LXGOKV'%^JB)@]^68&W^N@%A7W-#_#<:A8
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||
|
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M0@:"D%FA?.?D^D/YIL<:A3R(!(JB/+`E(,F_J0#U069XT8\4N+XW1EE'+Z'P
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||
|
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MC8T%YFPSUPH5'6DQ%,V4H%:)95>)A:[R=]-BZ<1BL6X0B\7,"X9.7+]<HVD)
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||
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M:5!=,E555-&N:*-09*(#)8A8`8V\4XT=12^:)HRHXBF;E@SP6JW3[;,HJ7&2
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||
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M%970THV9&2+LMGJ%J?C)Z)@FI)5ZZ`<\V2N9VE9,=N\FO:M(KZH)&0+[^[_V
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||
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ME.SI.59$"_ZR/EF2/Y+B"ZA5I?C@.NX<[+/[E!;K.H+R+?8],)I@/L,4`YTW
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M<8@O\VB]T04];%RO5+9`.@D"\R)>Q;Y'-_?[9:8S(Z*VDS)+P6B!)Z.%P.4J
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||
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MDCZ/<!FWXLI1:6'F2.AX<B'U=0I!<D8O0<8O*I>CNU^&?]<A;W?``&^451\L
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M8LA78^FNP-('+/T,E@Y@V2+W>A.6#KXMPB%DO<K;]V1B"4#I[\:B>S^?4CSA
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M\47D36Y5S<F'_CO9?'W8#K]AT&GO;.]&>M,"<J9S]#ZX_(?<QLOP@(?SP&,C
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MB/_B3*+[0<,7P+!8F!/RJ6!?\%(#DSIP]7P;(%^_"9=V+-VGEE9DALCEV`=O
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M"H.C]"#,0;LGEC/DTXF6$1L@KA0&CCY`OTC'@"%KW-V#\K5P(HUD+WX-SXKM
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M9BEM<*A&K;7](QDQF36EUO<="637LF6$F</4,=RU]J&B6IM9DG9_D8E=R;;V
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M.YG?E6H#TM=KZQG<Y-N@EC,;T=,K6M,2;S/C'6#!'._M]7MG3.5A*'>&R8%0
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M3N9A9V(%(FD`E$CT7W,'A(T&8SM!>%6I5-BI/P"+P9LKV@_EN#T\=;$9^$Z5
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M%C1<@L1@+]")5%3MZJI%U5X_D^<89;QAH)%(<\,X0E719<-@5^<:(2][L%='
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M<T\".VD".[<0V$D3V+DW@7O@C,-)EL+N/2GLIBGLWD)A-TUA]WX42HQ-F;^:
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MJ$E&GS3)SD[JZTD3.!')A2(=4,07'/5HRBD.<#QFJJU8#<$U3U&62MM#=[J.
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M8]?9WMP;TO:+CA66.'F<W!(J*+[!,IJCHB#PKX84PUN_*;V"]%*Y&1R/[:5Z
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M"Z<)`-(C:!I4UL?E4@ZNMZ[HC;V;=J):\4A(,R%7X?R.8K;Y4%H*93-"&QJ.
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M$CA=FIKRAE0-)Z[=B.LV[*0+>2$MV>W"DTI(HP&?N$@E=W,AC<L;!AR#%9U=
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M"4%%,K;(P8F!QE<5(GVZDTFJF_CR@`E?S]ZL1BFG,LM4JC;$6!ACD$O+G=.-
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MG^.7"++Q%6U;T;YKQ<%5W`%R'$G2?DR:[@\KJ][_/W#ZWSWR_XPX_Z]&^7\P
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||
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MX>G]_V.4;\__(QOY*Z3_1==@3]E__[?LOU@T3\E__VIEE?]_X/2_>^3_)>]_
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||
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||
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M8Y2D_B%:<?S*\,%QW/7[#\:VJ>-_^6Q6MXVG_)]'*2\WV$_[=I,IW9<OF5FA
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||
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M/\Q\]6K[I6F\-&K,:#1KU:999V+!0Q?CG]YRQGYB&R_S^37'&[IS"+X+$L2D
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||
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MD,^#2"%:QT"/66$8L-?,++/9$CX-^+R"SVJ]I4<-X9C/-@2$>Q#2O69%62^Q
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||
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M\CD([XH$ZS53V#>9V3!:C!I_3K0BR"T`23V;FZ5\+K<AI[[`&26`0%2U5@/5
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||
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M%-T-^`^$+)\!P#I;;^D&8AB%"2U?\U_S>>(*1'Z.C442=0FY4@*W6JE!&`\'
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M"7L-X@8P-+\)T")B:<`5#JC64;>YR%A*V,M=P;%U=D70KG,TNP*.-F=+8HJT
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M+B*NK[&=X3MB/.+\+M:1R*]2K<D5.QO,1_]\]5LKGQ+*K#CWA#/VN$V.8E9*
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M92SWP$F\>8-@L5O39R3I,U+TX;"80B.F,`)O)L`;>Z4T9#,)V;P%LKD"<E6)
|
||
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M'1LR$L`F:=__WQO74WF0<CW^FSPXCKO>_YK51A3_F=4JQ7_FT_O?1RGI^&]"
|
||
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M\5\UCOUV0!?-ZG;3K*V._4:>S4?L'`*P_>/S=_DUJ.%O:$4-44L<HN7`71G&
|
||
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M_IYS9C3C[V/`FTE]\6EIFU5C\`/*&/SJT/JD\??N"./O![7\F4&%/_,#9?Q]
|
||
|
|
M*G\;]0R:Y_4C\`W&5TP8CW^'CD<SHN?1;#\3B4>S1,>C25?]_\^`2],7&RY-
|
||
|
|
MZ'@CL6E&9#;-382S:6PZ-DUHO+LAGV8D-GR:N7)/94JDFIC<#^&<FCM4.!3]
|
||
|
|
M_1"XEP`_T;LGP:F!@_=(!$Z-^M[#2!A.#?`?Y?L<4`^,.:-V^OL<+R=/CE.S
|
||
|
|
M8N'D.#5?3X%3(W-A9$[-[B1YFJ]Y)#1MS*GQAJ:GAU/3K>/4[-5Q:GIUG)H^
|
||
|
|
M':>F7\>I&=!Q:KJC<&K:=9R:$8E38PK#J>G5<6H&HW!J=NHX-6X=IZ8Q4<NI
|
||
|
|
M>4O'J:F*PJG)3])R:D94RP.G9H0N_Q91.#6P_>^H.#6P?6\3A5.C7OX3Z?U1
|
||
|
|
M<VJ.Z#@U(\DRAX9S:AJ3M)R:W<BI0<8%,B[F!.,"<_4Q5Q]S]3%7'W/U,5<?
|
||
|
|
M<_4Q5Q]S]3%7'W/U,5<?<_7G?J[^B3<P5Q]S]3%7'W/U,5<?<_4Q5Q]S]3%7
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||
|
|
M'W/U,5<?<_4Q5Q]S]3%7'W/U,5<?<_4Q5Q]S]3%7'W/U,5<?<_4Q5U_>?@C,
|
||
|
|
MU3<.*?^3_KY:LVS+K\PZ!&?D_&^8R?,_;=FYD`MJLSEM#B)D7YG-T<8\S__4
|
||
|
|
M?OYPDEKORVIIBZG<,W+^KR#8LYVASS_;F0W^+V>N'?-_IR/*:^D//3UMH*?L
|
||
|
|
M<*7C"3:TT`M@N&`)T&L$H?XIH3Y(SP8\K4U-<"+.\L2;H0;.%K;1"[Q@:[.P
|
||
|
|
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|
|
MZJF!79D*_D"PL1$NP,SUU5OIU3"]@`SR:ZA@LU!73Z\SLI`K<`5"N__+T(?8
|
||
|
|
MKB/*_I_C<*KV?X<#\O]S;$[<_Z<C,/\?\_\Q_Q_S_S'_'_/_,?]_]MRGP?Q_
|
||
|
|
MS/_7UF/^/^;_8_[_I>3_8X0/[?6_0G.,Y3HB7__;G5:KPO]T6G/@_E^V-1NO
|
||
|
|
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|
||
|
|
M%$"F`#(%D"F`3`%D"B!3`)D"R!1`I@`R!9`I@$P!9`H@4P"9`L@40*8`,@60
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|
M*8!,`60*Q'@>,@7F'E,`X^H)[?A?V?`>VW5$R?^U.6Q67?ZOPY:-^;_3$NC&
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|
|
M0S>>_!MV-;OQ,"XMM,?_LO(-A84Q!T!$X[\X'0K_(<=A`_Y#KLV&Q__I"`$C
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||
|
|
M7,P+WHS!_F^/]0$@ZOZ?JYS_Y63GPOF?U>K`_7\Z8B9VK#D0<^;8H-W_:X)7
|
||
|
|
M8AUT_X_(_[/9E=__7*<=9ECM5MS_IR,\U2U"X=KU90S[)905N$I+5K.G,@I,
|
||
|
|
M")T3"O+=`4'YF1"4C&'A?@GR-F?VC?D0VOT_]$V(Z3JBW?^Q6E7\SVQ^_F]'
|
||
|
|
M_N.TQ"D_V;FFNBW85%IF(W$F$XD[3O(7G5Y(KM.@4I;ETPOM]6M=:Z3/K'!5
|
||
|
|
MN8T>J`76IHKC.@B[^Y!,V/XOP*T'-N:MD4V0\_UD9]?(`&F'QT''>/]@<M?G
|
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|
MCC/OD[AO=]%9[OXNXO[XPH[TVXEC<'AQ4_RI%+(OF?1=T^L83AM.'[[I@]^8
|
||
|
|
M1C\CG=<\0#K35Y$>%^D:[+RU@'0_1-ZH(:-5M&8MZ3A'6LH[TQ\A/<6LNI1T
|
||
|
|
MKV/5JVAU&:O.[DS?0'H>8]4;2?<3K#J#5F]BU>F=Z96DIYI5>TBWCU7'DU-;
|
||
|
|
MR+KUO::^.,?1X<6/;VS_GK0LXEM7,)PV]F5W#;EXF+9<05KL+QSH."!T';CX
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|
MY_9SBUL_:K](6I/>,?W>-+:_\XO!L:1G+W0<,#U[8?!$4N?'=#:Y^.'8;P_L
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M-0^V+.R[AG9(._OF`.\X9SB-ODAW3P%]6U+,1<%J;UU##=D9V]BP1W?^'SK^
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|
|
MQ_([-K7]GY__(_]Q>H)_V58-I[UPN.OSKL'SHPGDPJG;R&@J:5W2^\E)[V@2
|
||
|
|
M:;VN]Y\GJ_SOPQX]1K[T[HX[?E;ZDCXXG):5:DI_A9Q/%0;]'8=-J1F#8\3_
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|
M[PJ21!:0?7`STM]UU-]UP-]UPM\UM@_^.WLH_O9#+E/R(5<<+?'>?3>R1I_V
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|
|
M?S^^@&P_Z-X'A)WQ3_\T/OX*N\D)&03DU;_RQY>4QRNV3\RGT.___`0NUM^Q
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|
|
MR/N_(U?#?[&Q\_\<9R[N_],1^/L_OW__\?@_GV/#'N0_(_\9^<_(?T;^,_*?
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MD?\\>\;4(O\9^<_:>N0_(_\9^<^7PG^^G'_TS_$PX_A?'/\[%\;_SO!^=+5&
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MA/T?^=_(_T;^-_*_D?^-_&_D?R/_&_G?R/]&_C?ROY'_C?QOY'\C_QOYW\C_
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M1O[W7,E5N#K'3B+_.U(>`\;\"(G_4%R]U>>O"TQA9YI"1.._.',5_ILS%_@O
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|
|
M]`GRGZ8EEKJ:@LW-%IX-4LW.KQJ;Z%>!GOTL=:\O*%P+)Y=UCGMS+*T-6QN"
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|
M/VFP^`)^"ZTK+2OGE;3.;':YZ+/,._D2RVH\'OJ<MUAF7LHJ`QZ/8"D1+&N7
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|
MMS8W+8?SL\#R0-WFY72^Q9EE75[7X`FT>GWFHM7JG@)>54<EQ>JJAGI555FY
|
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|
|
MNHK^@-0UJFI7K5?75C>IJER%M,I2:C<OM?A;&R#3Q0)7ULV"Q1^LKVNQ^)NJ
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|
MZWT6^:+1;"XH>90NX'*MS,B\T^5:EB$4K8:G1:OITY)B>%I23)^6E</3LG+Z
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MU%7(VA8NRS";Z?53'KV,I6>_\MV`NLT"?+/,9IB;ER>8%^;[/+5!(2-#>6JQ
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|
MWK`=PFO1;Z'<(=1-[`U>>=CNH-)XZUC-Q-X@MZ@AS_`M855A7IJJ3KN5J@K=
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|
M&GD-<@XQ,#`P,#`P,#`P,#`P,#`P,#`P,#`P,#`P,#`P,#`P,#!F//X/>T-0
|
||
|
|
%]0`@`P`Q
|
||
|
|
`
|
||
|
|
end
|
||
|
|
<-->
|
||
|
|
----[ EOF
|