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In a P/Invoke interaction, the initiative must come from the managed code s side. The process starts in managed mode and makes calls to the unmanaged functions. However, the exchange can t always go in only one direction; that model would be too simplistic to be usable. Many unmanaged methods require callback functions, and the managed code must have the means to provide those functions. Thus, it s necessary to have a way to pass a managed method pointer to an unmanaged function, permitting the unmanaged function to call the managed method. The managed callback method might be simply a P/Invoke thunk of another unmanaged method, but that changes nothing it s still a managed method. The way to pass managed methods as callbacks to unmanaged functions involves the use of delegates. The delegates are marshaled by P/Invoke thunks as unmanaged function pointers, which makes them suitable for the task. Let s look at a sample to review the way delegates are used for callback specifications. You can find this sample, Callback.il, on the Apress Web site. The sample implements a simple program that sorts 15 integer values in ascending order, employing the well-known C function qsort, called through P/Invoke. The difference between the P/Invoke calls you ve encountered so far and this one is that qsort requires a callback function, which compares the two elements of the array being sorted, thus defining the sorting order. I ll let the sample speak for itself: // I can't pass the managed method pointer to the unmanaged function, // and even the ldftn instruction will not help me. // This delegate will serve as an appropriate vehicle. .class public sealed CompareDelegate extends [mscorlib]System.MulticastDelegate { .method public specialname void .ctor(object Object, native uint MethodPtr) runtime {}

for pid in `ps -eo pid,comm | egrep "${process}$|${process}:$" | grep -v grep | awk '{print $1}'` do

1 2 ... 342,023

123 456 ... 987

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// Note the modopt modifier of the Invoke signature -- it's very // important. Without it, the calling convention of the callback // function is marshaled as stdcall (callee cleans the stack). // But qsort expects the callback function to have the cdecl // calling convention (caller clears the stack). If we supply the // callback with the stdcall calling convention, qsort blows // the stack away and causes a memory access violation. You are // welcome to comment out the modopt line and see what happens. // Note also that the modopt modifier is placed on the delegate's // Invoke signature, not on the signature of the delegated method. .method public virtual int32 modopt([mscorlib]System.Runtime.CompilerServices.CallConvCdecl) Invoke(void*, void*) runtime {} // Well, I don't really need asynchronous invocation here, // but, you know, dura lex sed lex. .method public newslot virtual class [mscorlib]System.IAsyncResult BeginInvoke(object, class [mscorlib]System.AsyncCallback, object) runtime {} .method public newslot virtual void EndInvoke(class [mscorlib]System.IAsyncResult) runtime {} } // The hero of the occasion: the qsort function. .method public static pinvokeimpl("msvcrt.dll" ansi cdecl) void qsort(void*,int32,int32,class CompareDelegate) preservesig {} // This is the comparison method I'm going to offer as // a callback to qsort. What can be simpler than comparing // two integers .method public static int32 compInt32(void* arg1,void* arg2) { // return(*arg1 - *arg2); ldarg.0 ldind.i4 ldarg.1 ldind.i4 sub ret }

For each process ID, the script has to gather the pertinent information. The embedded ps command gathers only the specific information we want.

So, two of those rows are locked If anyone tried to update them, that user would be blocked So far, the behavior we are seeing is more or less consistent across all databases The difference will be in what happens when the query gets to the locked data When the query we are executing gets to the block containing the locked row (row 342,023) at the bottom of the table, it will notice that the data in the row has changed since the time at which it started execution To provide a consistent (correct) answer, Oracle will at this point create a copy of the block containing this row as it existed when the query began That is, it will read a value of $10000, which is the value that existed at the time the query began.

Effectively, Oracle takes a detour around the modified data it reads around it, reconstructing it from the undo (also known as a rollback) segment (discussed in detail in 9) A consistent and correct answer comes back without waiting for the transaction to commit Now, a database that allowed a dirty read would simply return the value it saw in account 987 at the time it read it, in this case $50000 The query would count the transferred $400 twice Therefore, it not only returns the wrong answer, but also returns a total that never existed in the table at any point in time In a multiuser database, a dirty read can be a dangerous feature and, personally, I have never seen the usefulness of it Say that, rather than transferring, the transaction was actually just depositing $40000 in account 987 The dirty read would count the $400.

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